Network Time Protocol (Version 3) Specification, Implementation and Analysis
RFC 1305
| Document | Type |
RFC - Draft Standard
(March 1992; No errata)
Obsoleted by RFC 5905
Was draft-mills-ntpv3 (individual)
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Network Working Group David L. Mills
Request for Comments: 1305 University of Delaware
Obsoletes RFC-1119, RFC-1059, RFC-958 March 1992
Network Time Protocol (Version 3)
Specification, Implementation and Analysis
Note: This document consists of an approximate rendering in ASCII of the
PostScript document of the same name. It is provided for convenience and
for use in searches, etc. However, most tables, figures, equations and
captions have not been rendered and the pagination and section headings
are not available.
Abstract
This document describes the Network Time Protocol (NTP), specifies its
formal structure and summarizes information useful for its
implementation. NTP provides the mechanisms to synchronize time and
coordinate time distribution in a large, diverse internet operating at
rates from mundane to lightwave. It uses a returnable-time design in
which a distributed subnet of time servers operating in a self-
organizing, hierarchical-master-slave configuration synchronizes local
clocks within the subnet and to national time standards via wire or
radio. The servers can also redistribute reference time via local
routing algorithms and time daemons.
Status of this Memo
This RFC specifies an IAB standards track protocol for the Internet
community and requests discussion and suggestions for improvements.
Please refer to the current edition of the <169>IAB Official Protocol
Standards<170> for the standardization state and status of this
protocol. Distribution of this memo is unlimited.
Keywords: network clock synchronization, standard time distribution,
fault-tolerant architecture, maximum-likelihood estimation, disciplined
oscillator, internet protocol, high-speed networks, formal
specification.
Preface
This document describes Version 3 of the Network Time Protocol (NTP). It
supersedes Version 2 of the protocol described in RFC-1119 dated
September 1989. However, it neither changes the protocol in any
significant way nor obsoletes previous versions or existing
implementations. The main motivation for the new version is to refine
the analysis and implementation models for new applications at much
higher network speeds to the gigabit-per-second regime and to provide
for the enhanced stability, accuracy and precision required at such
speeds. In particular, the sources of time and frequency errors have
been rigorously examined and error bounds established in order to
improve performance, provide a model for correctness assertions and
indicate timekeeping quality to the user. The revision also incorporates
two new optional features, (1) an algorithm to combine the offsets of a
number of peer time servers in order to enhance accuracy and (2)
improved local-clock algorithms which allow the poll intervals on all
synchronization paths to be substantially increased in order to reduce
network overhead. An overview of the changes, which are described in
detail in Appendix D, follows:
1.
In Version 3 The local-clock algorithm has been overhauled to improve
stability and accuracy. Appendix G presents a detailed mathematical
model and design example which has been refined with the aid of
feedback-control analysis and extensive simulation using data collected
over ordinary Internet paths. Section 5 of RFC-1119 on the NTP local
clock has been completely rewritten to describe the new algorithm. Since
the new algorithm can result in message rates far below the old ones, it
is highly recommended that they be used in new implementations. Note
that use of the new algorithm does not affect interoperability with
previous versions or existing implementations.
2.
In Version 3 a new algorithm to combine the offsets of a number of peer
time servers is presented in Appendix F. This algorithm is modelled on
those used by national standards laboratories to combine the weighted
offsets from a number of standard clocks to construct a synthetic
laboratory timescale more accurate than that of any clock separately. It
can be used in an NTP implementation to improve accuracy and stability
and reduce errors due to asymmetric paths in the Internet. The new
algorithm has been simulated using data collected over ordinary Internet
paths and, along with the new local-clock algorithm, implemented and
tested in the Fuzzball time servers now running in the Internet. Note
that use of the new algorithm does not affect interoperability with
previous versions or existing implementations.
3.
Several inconsistencies and minor errors in previous versions have been
corrected in Version 3. The description of the procedures has been
rewritten in pseudo-code augmented by English commentary for clarity and
to avoid ambiguity. Appendix I has been added to illustrate C-language
implementations of the various filtering and selection algorithms
suggested for NTP. Additional information is included in Section 5 and
in Appendix E, which includes the tutorial material formerly included in
Section 2 of RFC-1119, as well as much new material clarifying the
interpretation of timescales and leap seconds.
4.
Minor changes have been made in the Version-3 local-clock algorithms to
avoid problems observed when leap seconds are introduced in the UTC
timescale and also to support an auxiliary precision oscillator, such as
a cesium clock or timing receiver, as a precision timebase. In addition,
changes were made to some procedures described in Section 3 and in the
clock-filter and clock-selection procedures described in Section 4.
While these changes were made to correct minor bugs found as the result
of experience and are recommended for new implementations, they do not
affect interoperability with previous versions or existing
implementations in other than minor ways (at least until the next leap
second).
5.
In Version 3 changes were made to the way delay, offset and dispersion
are defined, calculated and processed in order to reliably bound the
errors inherent in the time-transfer procedures. In particular, the
error accumulations were moved from the delay computation to the
dispersion computation and both included in the clock filter and
selection procedures. The clock-selection procedure was modified to
remove the first of the two sorting/discarding steps and replace with an
algorithm first proposed by Marzullo and later incorporated in the
Digital Time Service. These changes do not significantly affect the
ordinary operation of or compatibility with various versions of NTP, but
they do provide the basis for formal statements of correctness as
described in Appendix H.
Table of Contents
1. Introduction 1
1.1. Related Technology 2
2. System Architecture 4
2.1. Implementation Model 6
2.2. Network Configurations 7
3. Network Time Protocol 8
3.1. Data Formats 8
3.2. State Variables and Parameters 9
3.2.1. Common Variables 9
3.2.2. System Variables 12
3.2.3. Peer Variables 12
3.2.4. Packet Variables 14
3.2.5. Clock-Filter Variables 14
3.2.6. Authentication Variables 15
3.2.7. Parameters 15
3.3. Modes of Operation 17
3.4. Event Processing 19
3.4.1. Notation Conventions 19
3.4.2. Transmit Procedure 20
3.4.3. Receive Procedure 22
3.4.4. Packet Procedure 24
3.4.5. Clock-Update Procedure 27
3.4.6. Primary-Clock Procedure 28
3.4.7. Initialization Procedures 28
3.4.7.1. Initialization Procedure 29
3.4.7.2. Initialization-Instantiation Procedure 29
3.4.7.3. Receive-Instantiation Procedure 30
3.4.7.4. Primary Clock-Instantiation Procedure 31
3.4.8. Clear Procedure 31
3.4.9. Poll-Update Procedure 32
3.5. Synchronization Distance Procedure 32
3.6. Access Control Issues 33
4. Filtering and Selection Algorithms 34
4.1. Clock-Filter Procedure 35
4.2. Clock-Selection Procedure 36
4.2.1. Intersection Algorithm 36
5. Local Clocks 40
5.1. Fuzzball Implementation 41
5.2. Gradual Phase Adjustments 42
5.3. Step Phase Adjustments 43
5.4. Implementation Issues 44
6. Acknowledgments 45
7. References 46
A. Appendix A. NTP Data Format - Version 3 50
B. Appendix B. NTP Control Messages 53
B.1. NTP Control Message Format 54
B.2. Status Words 56
B.2.1. System Status Word 56
B.2.2. Peer Status Word 57
B.2.3. Clock Status Word 58
B.2.4. Error Status Word 58
B.3. Commands 59
C. Appendix C. Authentication Issues 61
C.1. NTP Authentication Mechanism 62
C.2. NTP Authentication Procedures 63
C.2.1. Encrypt Procedure 63
4.2.2. Clustering Algorithm 38
C.2.2. Decrypt Procedure 64
C.2.3. Control-Message Procedures 65
D. Appendix D. Differences from Previous Versions. 66
E. Appendix E. The NTP Timescale and its Chronometry 70
E.1. Introduction 70
E.2. Primary Frequency and Time Standards 70
E.3. Time and Frequency Dissemination 72
E.4. Calendar Systems 74
E.5. The Modified Julian Day System 75
E.6. Determination of Frequency 76
E.7. Determination of Time and Leap Seconds 76
E.8. The NTP Timescale and Reckoning with UTC 78
F. Appendix F. The NTP Clock-Combining Algorithm 80
F.1. Introduction 80
F.2. Determining Time and Frequency 80
F.3. Clock Modelling 81
F.4. Development of a Composite Timescale 81
F.5. Application to NTP 84
F.6. Clock-Combining Procedure 84
G. Appendix G. Computer Clock Modelling and Analysis 86
G.1. Computer Clock Models 86
G.1.1. The Fuzzball Clock Model 88
G.1.2. The Unix Clock Model 89
G.2. Mathematical Model of the NTP Logical Clock 91
G.3. Parameter Management 93
G.4. Adjusting VCO Gain (<$Ebold alpha>) 94
G.5. Adjusting PLL Bandwidth (<$Ebold tau>) 94
G.6. The NTP Clock Model 95
H. Appendix H. Analysis of Errors and Correctness Principles
98
H.1. Introduction 98
H.2. Timestamp Errors 98
H.3. Measurement Errors 100
H.4. Network Errors 101
H.5. Inherited Errors 102
H.6. Correctness Principles 104
I. Appendix I. Selected C-Language Program Listings 107
I.1. Common Definitions and Variables 107
I.2. Clock<196>Filter Algorithm 108
I.3. Interval Intersection Algorithm 109
I.4. Clock<196>Selection Algorithm 110
I.5. Clock<196>Combining Procedure 111
I.6. Subroutine to Compute Synchronization Distance 112
List of Figures
Figure 1. Implementation Model 6
Figure 2. Calculating Delay and Offset 25
Figure 3. Clock Registers 39
Figure 4. NTP Message Header 50
Figure 5. NTP Control Message Header 54
Figure 6. Status Word Formats 55
Figure 7. Authenticator Format 63
Figure 8. Comparison of UTC and NTP Timescales at Leap 79
Figure 9. Network Time Protocol 80
Figure 10. Hardware Clock Models 86
Figure 11. Clock Adjustment Process 90
Figure 12. NTP Phase-Lock Loop (PLL) Model 91
Figure 13. Timing Intervals 96
Figure 14. Measuring Delay and Offset 100
Figure 15. Error Accumulations 103
Figure 16. Confidence Intervals and Intersections 105
List of Tables
Table 1. System Variables 12
Table 2. Peer Variables 13
Table 3. Packet Variables 14
Table 4. Parameters 16
Table 5. Modes and Actions 22
Table 6. Clock Parameters 40
Table 7. Characteristics of Standard Oscillators 71
Table 8. Table of Leap-Second Insertions 77
Table 9. Notation Used in PLL Analysis 91
Table 10. PLL Parameters 91
Table 11. Notation Used in PLL Analysis 95
Table 12. Notation Used in Error Analysis 98
Introduction
This document constitutes a formal specification of the Network Time
Protocol (NTP) Version 3, which is used to synchronize timekeeping among
a set of distributed time servers and clients. It defines the
architectures, algorithms, entities and protocols used by NTP and is
intended primarily for implementors. A companion document [MIL91a]
summarizes the requirements, analytical models, algorithmic analysis and
performance under typical Internet conditions. Another document [MIL91b]
describes the NTP timescale and its relationship to other standard
timescales now in use. NTP was first described in RFC-958 [MIL85c], but
has since evolved in significant ways, culminating in the most recent
NTP Version 2 described in RFC-1119 [MIL89]. It is built on the Internet
Protocol (IP) [DAR81a] and User Datagram Protocol (UDP) [POS80], which
provide a connectionless transport mechanism; however, it is readily
adaptable to other protocol suites. NTP is evolved from the Time
Protocol [POS83b] and the ICMP Timestamp message [DAR81b], but is
specifically designed to maintain accuracy and robustness, even when
used over typical Internet paths involving multiple gateways, highly
dispersive delays and unreliable nets.
The service environment consists of the implementation model and service
model described in Section 2. The implementation model is based on a
multiple-process operating system architecture, although other
architectures could be used as well. The service model is based on a
returnable-time design which depends only on measured clock offsets, but
does not require reliable message delivery. The synchronization subnet
uses a self-organizing, hierarchical-master-slave configuration, with
synchronization paths determined by a minimum-weight spanning tree.
While multiple masters (primary servers) may exist, there is no
requirement for an election protocol.
NTP itself is described in Section 3. It provides the protocol
mechanisms to synchronize time in principle to precisions in the order
of nanoseconds while preserving a non-ambiguous date well into the next
century. The protocol includes provisions to specify the characteristics
and estimate the error of the local clock and the time server to which
it may be synchronized. It also includes provisions for operation with a
number of mutually suspicious, hierarchically distributed primary
reference sources such as radio-synchronized clocks.
Section 4 describes algorithms useful for deglitching and smoothing
clock-offset samples collected on a continuous basis. These algorithms
evolved from those suggested in [MIL85a], were refined as the results of
experiments described in [MIL85b] and further evolved under typical
operating conditions over the last three years. In addition, as the
result of experience in operating multiple-server subnets including
radio clocks at several sites in the U.S. and with clients in the U.S.
and Europe, reliable algorithms for selecting good clocks from a
population possibly including broken ones have been developed [DEC89],
[MIL91a] and are described in Section 4.
The accuracies achievable by NTP depend strongly on the precision of the
local-clock hardware and stringent control of device and process
latencies. Provisions must be included to adjust the software logical-
clock time and frequency in response to corrections produced by NTP.
Section 5 describes a local-clock design evolved from the Fuzzball
implementation described in [MIL83b] and [MIL88b]. This design includes
offset-slewing, frequency compensation and deglitching mechanisms
capable of accuracies in the order of a millisecond, even after extended
periods when synchronization to primary reference sources has been lost.
Details specific to NTP packet formats used with the Internet Protocol
(IP) and User Datagram Protocol (UDP) are presented in Appendix A, while
details of a suggested auxiliary NTP Control Message, which may be used
when comprehensive network-monitoring facilities are not available, are
presented in Appendix B. Appendix C contains specification and
implementation details of an optional authentication mechanism which can
be used to control access and prevent unauthorized data modification,
while Appendix D contains a listing of differences between Version 3 of
NTP and previous versions. Appendix E expands on issues involved with
precision timescales and calendar dating peculiar to computer networks
and NTP. Appendix F describes an optional algorithm to improve accuracy
by combining the time offsets of a number of clocks. Appendix G presents
a detailed mathematical model and analysis of the NTP local-clock
algorithms. Appendix H analyzes the sources and propagation of errors
and presents correctness principles relating to the time-transfer
service. Appendix I illustrates C-language code segments for the clock-
filter, clock-selection and related algorithms described in Section 4.
Related Technology
Other mechanisms have been specified in the Internet protocol suite to
record and transmit the time at which an event takes place, including
the Daytime protocol [POS83a], Time Protocol [POS83b], ICMP Timestamp
message [DAR81b] and IP Timestamp option [SU81]. Experimental results on
measured clock offsets and roundtrip delays in the Internet are
discussed in [MIL83a], [MIL85b], [COL88] and [MIL88a]. Other
synchronization algorithms are discussed in [LAM78], [GUS84], [HAL84],
[LUN84], [LAM85], [MAR85], [MIL85a], [MIL85b], [MIL85c], [GUS85b],
[SCH86], [TRI86], [RIC88], [MIL88a], [DEC89] and [MIL91a], while
protocols based on them are described in [MIL81a], [MIL81b], [MIL83b],
[GUS85a], [MIL85c], [TRI86], [MIL88a], [DEC89] and [MIL91a]. NTP uses
techniques evolved from them and both linear-systems and agreement
methodologies. Linear methods for digital telephone network
synchronization are summarized in [LIN80], while agreement methods for
clock synchronization are summarized in [LAM85].
The Digital Time Service (DTS) [DEC89] has many of the same service
objectives as NTP. The DTS design places heavy emphasis on configuration
management and correctness principles when operated in a managed LAN or
LAN-cluster environment, while NTP places heavy emphasis on the accuracy
and stability of the service operated in an unmanaged, global-internet
environment. In DTS a synchronization subnet consists of clerks,
servers, couriers and time providers. With respect to the NTP
nomenclature, a time provider is a primary reference source, a courier
is a secondary server intended to import time from one or more distant
primary servers for local redistribution and a server is intended to
provide time for possibly many end nodes or clerks. Unlike NTP, DTS does
not need or use mode or stratum information in clock selection and does
not include provisions to filter timing noise, select the most accurate
from a set of presumed correct clocks or compensate for inherent
frequency errors.
In fact, the latest revisions in NTP have adopted certain features of
DTS in order to support correctness principles. These include mechanisms
to bound the maximum errors inherent in the time-transfer procedures and
the use of a provably correct (subject to stated assumptions) mechanism
to reject inappropriate peers in the clock-selection procedures. These
features are described in Section 4 and Appendix H of this document.
The Fuzzball routing protocol [MIL83b], sometimes called Hellospeak,
incorporates time synchronization directly into the routing-protocol
design. One or more processes synchronize to an external reference
source, such as a radio clock or NTP daemon, and the routing algorithm
constructs a minimum-weight spanning tree rooted on these processes. The
clock offsets are then distributed along the arcs of the spanning tree
to all processes in the system and the various process clocks corrected
using the procedure described in Section 5 of this document. While it
can be seen that the design of Hellospeak strongly influenced the design
of NTP, Hellospeak itself is not an Internet protocol and is unsuited
for use outside its local-net environment.
The Unix 4.3bsd time daemon timed [GUS85a] uses a single master-time
daemon to measure offsets of a number of slave hosts and send periodic
corrections to them. In this model the master is determined using an
election algorithm [GUS85b] designed to avoid situations where either no
master is elected or more than one master is elected. The election
process requires a broadcast capability, which is not a ubiquitous
feature of the Internet. While this model has been extended to support
hierarchical configurations in which a slave on one network serves as a
master on the other [TRI86], the model requires handcrafted
configuration tables in order to establish the hierarchy and avoid
loops. In addition to the burdensome, but presumably infrequent,
overheads of the election process, the offset measurement/correction
process requires twice as many messages as NTP per update.
A scheme with features similar to NTP is described in [KOP87]. This
scheme is intended for multi-server LANs where each of a set of possibly
many time servers determines its local-time offset relative to each of
the other servers in the set using periodic timestamped messages, then
determines the local-clock correction using the Fault-Tolerant Average
(FTA) algorithm of [LUN84]. The FTA algorithm, which is useful where up
to k servers may be faulty, sorts the offsets, discards the k highest
and lowest ones and averages the rest. The scheme, as described in
[SCH86], is most suitable to LAN environments which support broadcast
and would result in unacceptable overhead in an internet environment. In
addition, for reasons given in Section 4 of this paper, the statistical
properties of the FTA algorithm are not likely to be optimal in an
internet environment with highly dispersive delays.
A good deal of research has gone into the issue of maintaining accurate
time in a community where some clocks cannot be trusted. A truechimer is
a clock that maintains timekeeping accuracy to a previously published
(and trusted) standard, while a falseticker is a clock that does not.
Determining whether a particular clock is a truechimer or falseticker is
an interesting abstract problem which can be attacked using agreement
methods summarized in [LAM85] and [SRI87].
A convergence function operates upon the offsets between the clocks in a
system to increase the accuracy by reducing or eliminating errors caused
by falsetickers. There are two classes of convergence functions, those
involving interactive-convergence algorithms and those involving
interactive-consistency algorithms. Interactive-convergence algorithms
use statistical clustering techniques such as the fault-tolerant average
algorithm of [HAL84], the CNV algorithm of [LUN84], the majority-subset
algorithm of [MIL85a], the non-Byzantine algorithm of [RIC88], the
egocentric algorithm of [SCH86], the intersection algorithm of [MAR85]
and [DEC89] and the algorithms in Section 4 of this document.
Interactive-consistency algorithms are designed to detect faulty clock
processes which might indicate grossly inconsistent offsets in
successive readings or to different readers. These algorithms use an
agreement protocol involving successive rounds of readings, possibly
relayed and possibly augmented by digital signatures. Examples include
the fireworks algorithm of [HAL84] and the optimum algorithm of [SRI87].
However, these algorithms require large numbers of messages, especially
when large numbers of clocks are involved, and are designed to detect
faults that have rarely been found in the Internet experience. For these
reasons they are not considered further in this document.
In practice it is not possible to determine the truechimers from the
falsetickers on other than a statistical basis, especially with
hierarchical configurations and a statistically noisy Internet. While it
is possible to bound the maximum errors in the time-transfer procedures,
assuming sufficiently generous tolerances are adopted for the hardware
components, this generally results in rather poor accuracies and
stabilities. The approach taken in the NTP design and its predecessors
involves mutually coupled oscillators and maximum-likelihood estimation
and clock-selection procedures, together with a design that allows
provable assertions on error bounds to be made relative to stated
assumptions on the correctness of the primary reference sources. From
the analytical point of view, the system of distributed NTP peers
operates as a set of coupled phase-locked oscillators, with the update
algorithm functioning as a phase detector and the local clock as a
disciplined oscillator, but with deterministic error bounds calculated
at each step in the time-transfer process.
The particular choice of offset measurement and computation procedure
described in Section 3 is a variant of the returnable-time system used
in some digital telephone networks [LIN80]. The clock filter and
selection algorithms are designed so that the clock synchronization
subnet self-organizes into a hierarchical-master-slave configuration
[MIT80]. With respect to timekeeping accuracy and stability, the
similarity of NTP to digital telephone systems is not accidental, since
systems like this have been studied extensively [LIN80], [BRA80]. What
makes the NTP model unique is the adaptive configuration, polling,
filtering, selection and correctness mechanisms which tailor the
dynamics of the system to fit the ubiquitous Internet environment.
System Architecture
In the NTP model a number of primary reference sources, synchronized by
wire or radio to national standards, are connected to widely accessible
resources, such as backbone gateways, and operated as primary time
servers. The purpose of NTP is to convey timekeeping information from
these servers to other time servers via the Internet and also to cross-
check clocks and mitigate errors due to equipment or propagation
failures. Some number of local-net hosts or gateways, acting as
secondary time servers, run NTP with one or more of the primary servers.
In order to reduce the protocol overhead, the secondary servers
distribute time via NTP to the remaining local-net hosts. In the
interest of reliability, selected hosts can be equipped with less
accurate but less expensive radio clocks and used for backup in case of
failure of the primary and/or secondary servers or communication paths
between them.
Throughout this document a standard nomenclature has been adopted: the
stability of a clock is how well it can maintain a constant frequency,
the accuracy is how well its frequency and time compare with national
standards and the precision is how precisely these quantities can be
maintained within a particular timekeeping system. Unless indicated
otherwise, the offset of two clocks is the time difference between them,
while the skew is the frequency difference (first derivative of offset
with time) between them. Real clocks exhibit some variation in skew
(second derivative of offset with time), which is called drift; however,
in this version of the specification the drift is assumed zero.
NTP is designed to produce three products: clock offset, roundtrip delay
and dispersion, all of which are relative to a selected reference clock.
Clock offset represents the amount to adjust the local clock to bring it
into correspondence with the reference clock. Roundtrip delay provides
the capability to launch a message to arrive at the reference clock at a
specified time. Dispersion represents the maximum error of the local
clock relative to the reference clock. Since most host time servers will
synchronize via another peer time server, there are two components in
each of these three products, those determined by the peer relative to
the primary reference source of standard time and those measured by the
host relative to the peer. Each of these components are maintained
separately in the protocol in order to facilitate error control and
management of the subnet itself. They provide not only precision
measurements of offset and delay, but also definitive maximum error
bounds, so that the user interface can determine not only the time, but
the quality of the time as well.
There is no provision for peer discovery or virtual-circuit management
in NTP. Data integrity is provided by the IP and UDP checksums. No flow-
control or retransmission facilities are provided or necessary.
Duplicate detection is inherent in the processing algorithms. The
service can operate in a symmetric mode, in which servers and clients
are indistinguishable, yet maintain a small amount of state information,
or in client/server mode, in which servers need maintain no state other
than that contained in the client request. A lightweight association-
management capability, including dynamic reachability and variable poll-
rate mechanisms, is included only to manage the state information and
reduce resource requirements. Since only a single NTP message format is
used, the protocol is easily implemented and can be used in a variety of
solicited or unsolicited polling mechanisms.
It should be recognized that clock synchronization requires by its
nature long periods and multiple comparisons in order to maintain
accurate timekeeping. While only a few measurements are usually adequate
to reliably determine local time to within a second or so, periods of
many hours and dozens of measurements are required to resolve oscillator
skew and maintain local time to the order of a millisecond. Thus, the
accuracy achieved is directly dependent on the time taken to achieve it.
Fortunately, the frequency of measurements can be quite low and almost
always non-intrusive to normal net operations.
Implementation Model
In what may be the most common client/server model a client sends an NTP
message to one or more servers and processes the replies as received.
The server interchanges addresses and ports, overwrites certain fields
in the message, recalculates the checksum and returns the message
immediately. Information included in the NTP message allows the client
to determine the server time with respect to local time and adjust the
local clock accordingly. In addition, the message includes information
to calculate the expected timekeeping accuracy and reliability, as well
as select the best from possibly several servers.
While the client/server model may suffice for use on local nets
involving a public server and perhaps many workstation clients, the full
generality of NTP requires distributed participation of a number of
client/servers or peers arranged in a dynamically reconfigurable,
hierarchically distributed configuration. It also requires sophisticated
algorithms for association management, data manipulation and local-clock
control. Throughout the remainder of this document the term host refers
to an instantiation of the protocol on a local processor, while the term
peer refers to the instantiation of the protocol on a remote processor
connected by a network path.
Figure 1<$&fig1> shows an implementation model for a host including
three processes sharing a partitioned data base, with a partition
dedicated to each peer, and interconnected by a message-passing system.
The transmit process, driven by independent timers for each peer,
collects information in the data base and sends NTP messages to the
peers. Each message contains the local timestamp when the message is
sent, together with previously received timestamps and other information
necessary to determine the hierarchy and manage the association. The
message transmission rate is determined by the accuracy required of the
local clock, as well as the accuracies of its peers.
The receive process receives NTP messages and perhaps messages in other
protocols, as well as information from directly connected radio clocks.
When an NTP message is received, the offset between the peer clock and
the local clock is computed and incorporated into the data base along
with other information useful for error determination and peer
selection. A filtering algorithm described in Section 4 improves the
accuracy by discarding inferior data.
The update procedure is initiated upon receipt of a message and at other
times. It processes the offset data from each peer and selects the best
one using the algorithms of Section 4. This may involve many
observations of a few peers or a few observations of many peers,
depending on the accuracies required.
The local-clock process operates upon the offset data produced by the
update procedure and adjusts the phase and frequency of the local clock
using the mechanisms described in Section 5. This may result in either a
step-change or a gradual phase adjustment of the local clock to reduce
the offset to zero. The local clock provides a stable source of time
information to other users of the system and for subsequent reference by
NTP itself.
Network Configurations
The synchronization subnet is a connected network of primary and
secondary time servers, clients and interconnecting transmission paths.
A primary time server is directly synchronized to a primary reference
source, usually a radio clock. A secondary time server derives
synchronization, possibly via other secondary servers, from a primary
server over network paths possibly shared with other services. Under
normal circumstances it is intended that the synchronization subnet of
primary and secondary servers assumes a hierarchical-master-slave
configuration with the primary servers at the root and secondary servers
of decreasing accuracy at successive levels toward the leaves.
Following conventions established by the telephone industry [BEL86], the
accuracy of each server is defined by a number called the stratum, with
the topmost level (primary servers) assigned as one and each level
downwards (secondary servers) in the hierarchy assigned as one greater
than the preceding level. With current technology and available radio
clocks, single-sample accuracies in the order of a millisecond can be
achieved at the network interface of a primary server. Accuracies of
this order require special care in the design and implementation of the
operating system and the local-clock mechanism, such as described in
Section 5.
As the stratum increases from one, the single-sample accuracies
achievable will degrade depending on the network paths and local-clock
stabilities. In order to avoid the tedious calculations [BRA80]
necessary to estimate errors in each specific configuration, it is
useful to assume the mean measurement errors accumulate approximately in
proportion to the measured delay and dispersion relative to the root of
the synchronization subnet. Appendix H contains an analysis of errors,
including a derivation of maximum error as a function of delay and
dispersion, where the latter quantity depends on the precision of the
timekeeping system, frequency tolerance of the local clock and various
residuals. Assuming the primary servers are synchronized to standard
time within known accuracies, this provides a reliable, determistic
specification on timekeeping accuracies throughout the synchronization
subnet.
Again drawing from the experience of the telephone industry, which
learned such lessons at considerable cost [ABA89], the synchronization
subnet topology should be organized to produce the highest accuracy, but
must never be allowed to form a loop. An additional factor is that each
increment in stratum involves a potentially unreliable time server which
introduces additional measurement errors. The selection algorithm used
in NTP uses a variant of the Bellman-Ford distributed routing algorithm
[37] to compute the minimum-weight spanning trees rooted on the primary
servers. The distance metric used by the algorithm consists of the
(scaled) stratum plus the synchronization distance, which itself
consists of the dispersion plus one-half the absolute delay. Thus, the
synchronization path will always take the minimum number of servers to
the root, with ties resolved on the basis of maximum error.
As a result of this design, the subnet reconfigures automatically in a
hierarchical-master-slave configuration to produce the most accurate and
reliable time, even when one or more primary or secondary servers or the
network paths between them fail. This includes the case where all normal
primary servers (e.g., highly accurate WWVB radio clock operating at the
lowest synchronization distances) on a possibly partitioned subnet fail,
but one or more backup primary servers (e.g., less accurate WWV radio
clock operating at higher synchronization distances) continue operation.
However, should all primary servers throughout the subnet fail, the
remaining secondary servers will synchronize among themselves while
distances ratchet upwards to a preselected maximum <169>infinity<170>
due to the well-known properties of the Bellman-Ford algorithm. Upon
reaching the maximum on all paths, a server will drop off the subnet and
free-run using its last determined time and frequency. Since these
computations are expected to be very precise, especially in frequency,
even extended outage periods can result in timekeeping errors not
greater than a few milliseconds per day with appropriately stabilized
oscillators (see Section 5).
In the case of multiple primary servers, the spanning-tree computation
will usually select the server at minimum synchronization distance.
However, when these servers are at approximately the same distance, the
computation may result in random selections among them as the result of
normal dispersive delays. Ordinarily, this does not degrade accuracy as
long as any discrepancy between the primary servers is small compared to
the synchronization distance. If not, the filter and selection
algorithms will select the best of the available servers and cast out
outlyers as intended.
Network Time Protocol
This section consists of a formal definition of the Network Time
Protocol, including its data formats, entities, state variables, events
and event-processing procedures. The specification is based on the
implementation model illustrated in Figure 1, but it is not intended
that this model is the only one upon which a specification can be based.
In particular, the specification is intended to illustrate and clarify
the intrinsic operations of NTP, as well as to serve as a foundation for
a more rigorous, comprehensive and verifiable specification.
Data Formats
All mathematical operations expressed or implied herein are in two's-
complement, fixed-point arithmetic. Data are specified as integer or
fixed-point quantities, with bits numbered in big-endian fashion from
zero starting at the left, or high-order, position. Since various
implementations may scale externally derived quantities for internal
use, neither the precision nor decimal-point placement for fixed-point
quantities is specified. Unless specified otherwise, all quantities are
unsigned and may occupy the full field width with an implied zero
preceding bit zero. Hardware and software packages designed to work with
signed quantities will thus yield surprising results when the most
significant (sign) bit is set. It is suggested that externally derived,
unsigned fixed-point quantities such as timestamps be shifted right one
bit for internal use, since the precision represented by the full field
width is seldom justified.
Since NTP timestamps are cherished data and, in fact, represent the main
product of the protocol, a special timestamp format has been
established. NTP timestamps are represented as a 64-bit unsigned fixed-
point number, in seconds relative to 0h on 1 January 1900. The integer
part is in the first 32 bits and the fraction part in the last 32 bits.
This format allows convenient multiple-precision arithmetic and
conversion to Time Protocol representation (seconds), but does
complicate the conversion to ICMP Timestamp message representation
(milliseconds). The precision of this representation is about 200
picoseconds, which should be adequate for even the most exotic
requirements.
Timestamps are determined by copying the current value of the local
clock to a timestamp when some significant event, such as the arrival of
a message, occurs. In order to maintain the highest accuracy, it is
important that this be done as close to the hardware or software driver
associated with the event as possible. In particular, departure
timestamps should be redetermined for each link-level retransmission. In
some cases a particular timestamp may not be available, such as when the
host is rebooted or the protocol first starts up. In these cases the 64-
bit field is set to zero, indicating the value is invalid or undefined.
Note that since some time in 1968 the most significant bit (bit 0 of the
integer part) has been set and that the 64-bit field will overflow some
time in 2036. Should NTP be in use in 2036, some external means will be
necessary to qualify time relative to 1900 and time relative to 2036
(and other multiples of 136 years). Timestamped data requiring such
qualification will be so precious that appropriate means should be
readily available. There will exist an 200-picosecond interval,
henceforth ignored, every 136 years when the 64-bit field will be zero
and thus considered invalid.
State Variables and Parameters
Following is a summary of the various state variables and parameters
used by the protocol. They are separated into classes of system
variables, which relate to the operating system environment and local-
clock mechanism; peer variables, which represent the state of the
protocol machine specific to each peer; packet variables, which
represent the contents of the NTP message; and parameters, which
represent fixed configuration constants for all implementations of the
current version. For each class the description of the variable is
followed by its name and the procedure or value which controls it. Note
that variables are in lower case, while parameters are in upper case.
Additional details on formats and use are presented in later sections
and Appendices.
Common Variables
The following variables are common to two or more of the system, peer
and packet classes. Additional variables are specific to the optional
authentication mechanism as described in Appendix C. When necessary to
distinguish between common variables of the same name, the variable
identifier will be used.
Peer Address (peer.peeraddr, pkt.peeraddr), Peer Port (peer.peerport,
pkt.peerport): These are the 32-bit Internet address and 16-bit port
number of the peer.
Host Address (peer.hostaddr, pkt.hostaddr), Host Port (peer.hostport,
pkt.hostport): These are the 32-bit Internet address and 16-bit port
number of the host. They are included among the state variables to
support multi-homing.
Leap Indicator (sys.leap, peer.leap, pkt.leap): This is a two-bit code
warning of an impending leap second to be inserted in the NTP timescale.
The bits are set before 23:59 on the day of insertion and reset after
00:00 on the following day. This causes the number of seconds (rollover
interval) in the day of insertion to be increased or decreased by one.
In the case of primary servers the bits are set by operator
intervention, while in the case of secondary servers the bits are set by
the protocol. The two bits, bit 0 and bit 1, respectively, are coded as
follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
00, no warning
01, last minute has 61 seconds
10, last minute has 59 seconds
11, alarm condition (clock not synchronized)
@Z_TBL_END =
In all except the alarm condition (112), NTP itself does nothing with
these bits, except pass them on to the time-conversion routines that are
not part of NTP. The alarm condition occurs when, for whatever reason,
the local clock is not synchronized, such as when first coming up or
after an extended period when no primary reference source is available.
Mode (peer.mode, pkt.mode): This is an integer indicating the
association mode, with values coded as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, unspecified
1, symmetric active
2, symmetric passive
3, client
4, server
5, broadcast
6, reserved for NTP control messages
7, reserved for private use
@Z_TBL_END =
Stratum (sys.stratum, peer.stratum, pkt.stratum): This is an integer
indicating the stratum of the local clock, with values defined as
follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, unspecified
1, primary reference (e.g.,, calibrated atomic clock,, radio clock)
2-255, secondary reference (via NTP)
@Z_TBL_END =
For comparison purposes a value of zero is considered greater than any
other value. Note that the maximum value of the integer encoded as a
packet variable is limited by the parameter NTP.MAXSTRATUM.
Poll Interval (sys.poll, peer.hostpoll, peer.peerpoll, pkt.poll): This
is a signed integer indicating the minimum interval between transmitted
messages, in seconds as a power of two. For instance, a value of six
indicates a minimum interval of 64 seconds.
Precision (sys.precision, peer.precision, pkt.precision): This is a
signed integer indicating the precision of the various clocks, in
seconds to the nearest power of two. The value must be rounded to the
next larger power of two; for instance, a 50-Hz (20 ms) or 60-Hz (16.67
ms) power-frequency clock would be assigned the value -5 (31.25 ms),
while a 1000-Hz (1 ms) crystal-controlled clock would be assigned the
value -9 (1.95 ms).
Root Delay (sys.rootdelay, peer.rootdelay, pkt.rootdelay): This is a
signed fixed-point number indicating the total roundtrip delay to the
primary reference source at the root of the synchronization subnet, in
seconds. Note that this variable can take on both positive and negative
values, depending on clock precision and skew.
Root Dispersion (sys.rootdispersion, peer.rootdispersion,
pkt.rootdispersion): This is a signed fixed-point number indicating the
maximum error relative to the primary reference source at the root of
the synchronization subnet, in seconds. Only positive values greater
than zero are possible.
Reference Clock Identifier (sys.refid, peer.refid, pkt.refid): This is a
32-bit code identifying the particular reference clock. In the case of
stratum 0 (unspecified) or stratum 1 (primary reference source), this is
a four-octet, left-justified, zero-padded ASCII string, for example (see
Appendix A for comprehensive list):
@Z_TBL_BEG = COLUMNS(3), DIMENSION(IN), COLWIDTHS(E2,E2,E5),
WIDTH(4.1700), ABOVE(.1670), BELOW(.0830), HGUTTER(.3330),
BOX(Z_SINGLE), KEEP(ON), ALIGN(CT), L1(R1C0..R1C3)
@Z_TBL_BODY = TABLE CENTER, TABLE HEADER, TABLE HEADER
Stratum, Code, Meaning
@Z_TBL_BODY = TABLE CENTER, TABLE TEXT, TABLE TEXT
0, DCN, DCN routing protocol
0, TSP, TSP time protocol
1, ATOM, Atomic clock (calibrated)
1, WWVB, WWVB LF (band 5) radio
1, GOES, GOES UHF (band 9) satellite
@Z_TBL_BODY = TABLE CENTER, TABLE HEADER, TABLE HEADER
1, WWV, WWV HF (band 7) radio
@Z_TBL_END =
In the case of stratum 2 and greater (secondary reference) this is the
four-octet Internet address of the peer selected for synchronization.
Reference Timestamp (sys.reftime, peer.reftime, pkt.reftime): This is
the local time, in timestamp format, when the local clock was last
updated. If the local clock has never been synchronized, the value is
zero.
Originate Timestamp (peer.org, pkt.org): This is the local time, in
timestamp format, at the peer when its latest NTP message was sent. If
the peer becomes unreachable the value is set to zero.
Receive Timestamp (peer.rec, pkt.rec): This is the local time, in
timestamp format, when the latest NTP message from the peer arrived. If
the peer becomes unreachable the value is set to zero.
Transmit Timestamp (peer.xmt, pkt.xmt): This is the local time, in
timestamp format, at which the NTP message departed the sender.
System Variables
Table 1<$&tab1> shows the complete set of system variables. In addition
to the common variables described previously, the following variables
are used by the operating system in order to synchronize the local
clock.
Local Clock (sys.clock): This is the current local time, in timestamp
format. Local time is derived from the hardware clock of the particular
machine and increments at intervals depending on the design used. An
appropriate design, including slewing and skew-Compensation mechanisms,
is described in Section 5.
Clock Source (sys.peer): This is a selector identifying the current
synchronization source. Usually this will be a pointer to a structure
containing the peer variables. The special value NULL indicates there is
no currently valid synchronization source.
Peer Variables
Table 2 shows the complete set of peer variables. In addition to the
common variables described previously, the following variables are used
by the peer management and measurement functions.
Configured Bit (peer.config): This is a bit indicating that the
association was created from configuration information and should not be
demobilized if the peer becomes unreachable.
Update Timestamp (peer.update): This is the local time, in timestamp
format, when the most recent NTP message was received. It is used in
calculating the skew dispersion.
Reachability Register (peer.reach): This is a shift register of
NTP.WINDOW bits used to determine the reachability status of the peer,
with bits entering from the least significant (rightmost) end. A peer is
considered reachable if at least one bit in this register is set to one.
Peer Timer (peer.timer): This is an integer counter used to control the
interval between transmitted NTP messages. Once set to a nonzero value,
the counter decrements at one-second intervals until reaching zero, at
which time the transmit procedure is called. Note that the operation of
this timer is independent of local-clock updates, which implies that the
timekeeping system and interval-timer system architecture must be
independent of each other.<$&tab2>
Packet Variables
Table 3<$&tab3> shows the complete set of packet variables. In addition
to the common variables described previously, the following variables
are defined.
Version Number (pkt.version): This is an integer indicating the version
number of the sender. NTP messages will always be sent with the current
version number NTP.VERSION and will always be accepted if the version
number matches NTP.VERSION. Exceptions may be advised on a case-by-case
basis at times when the version number is changed. Specific guidelines
for interoperation between this version and previous versions of NTP are
summarized in Appendix D.
Clock-Filter Variables
When the filter and selection algorithms suggested in Section 4 are
used, the following state variables are defined in addition to the
variables described previously.
Filter Register (peer.filter): This is a shift register of NTP.SHIFT
stages, where each stage stores a 3-tuple consisting of the measured
delay, measured offset and calculated dispersion associated with a
single observation. These 3-tuples enter from the most significant
(leftmost) right and are shifted towards the least significant
(rightmost) end and eventually discarded as new observations arrive.
Valid Data Counter (peer.valid): This is an integer counter indicating
the valid samples remaining in the filter register. It is used to
determine the reachability state and when the poll interval should be
increased or decreased.
Offset (peer.offset): This is a signed, fixed-point number indicating
the offset of the peer clock relative to the local clock, in seconds.
Delay (peer.delay): This is a signed fixed-point number indicating the
roundtrip delay of the peer clock relative to the local clock over the
network path between them, in seconds. Note that this variable can take
on both positive and negative values, depending on clock precision and
skew-error accumulation.
Dispersion (peer.dispersion): This is a signed fixed-point number
indicating the maximum error of the peer clock relative to the local
clock over the network path between them, in seconds. Only positive
values greater than zero are possible.
Authentication Variables
When the authentication mechanism suggested in Appendix C is used, the
following state variables are defined in addition to the variables
described previously. These variables are used only if the optional
authentication mechanism described in Appendix C is implemented.
Authentication Enabled Bit (peer.authenable): This is a bit indicating
that the association is to operate in the authenticated mode.
Authenticated Bit (peer.authentic): This is a bit indicating that the
last message received from the peer has been correctly authenticated.
Key Identifier (peer.hostkeyid, peer.peerkeyid, pkt.keyid): This is an
integer identifying the cryptographic key used to generate the message-
authentication code.
Cryptographic Keys (sys.key): This is a set of 64-bit DES keys. Each key
is constructed as in the Berkeley Unix distributions, which consists of
eight octets, where the seven low-order bits of each octet correspond to
the DES bits 1-7 and the high-order bit corresponds to the DES odd-
parity bit 8.
Crypto-Checksum (pkt.check): This is a crypto-checksum computed by the
encryption procedure.
Parameters
Table 4<$&tab4> shows the parameters assumed for all implementations
operating in the Internet system. It is necessary to agree on the values
for these parameters in order to avoid unnecessary network overheads and
stable peer associations. The following parameters are assumed fixed and
applicable to all associations.
Version Number (NTP.VERSION): This is the current NTP version number
(3).
NTP Port (NTP.PORT): This is the port number (123) assigned by the
Internet Assigned Numbers Authority to NTP.
Maximum Stratum (NTP.MAXSTRATUM): This is the maximum stratum value that
can be encoded as a packet variable, also interpreted as
<169>infinity<170> or unreachable by the subnet routing algorithm.
Maximum Clock Age (NTP.MAXAGE): This is the maximum interval a reference
clock will be considered valid after its last update, in seconds.
Maximum Skew (NTP.MAXSKEW): This is the maximum offset error due to skew
of the local clock over the interval determined by NTP.MAXAGE, in
seconds. The ratio <$Ephi~=~roman {NTP.MAXSKEW over NTP.MAXAGE}> is
interpreted as the maximum possible skew rate due to all causes.
Maximum Distance (NTP.MAXDISTANCE): When the selection algorithm
suggested in Section 4 is used, this is the maximum synchronization
distance for peers acceptable for synchronization.
Minimum Poll Interval (NTP.MINPOLL): This is the minimum poll interval
allowed by any peer of the Internet system, in seconds to a power of
two.
Maximum Poll Interval (NTP.MAXPOLL): This is the maximum poll interval
allowed by any peer of the Internet system, in seconds to a power of
two.
Minimum Select Clocks (NTP.MINCLOCK): When the selection algorithm
suggested in Section 4 is used, this is the minimum number of peers
acceptable for synchronization.
Maximum Select Clocks (NTP.MAXCLOCK): When the selection algorithm
suggested in Section 4 is used, this is the maximum number of peers
considered for selection.
Minimum Dispersion (NTP.MINDISPERSE): When the filter algorithm
suggested in Section 4 is used, this is the minimum dispersion increment
for each stratum level, in seconds.
Maximum Dispersion (NTP.MAXDISPERSE): When the filter algorithm
suggested in Section 4 is used, this is the maximum peer dispersion and
the dispersion assumed for missing data, in seconds.
Reachability Register Size (NTP.WINDOW): This is the size of the
reachability register (peer.reach), in bits.
Filter Size (NTP.SHIFT): When the filter algorithm suggested in Section
4 is used, this is the size of the clock filter (peer.filter) shift
register, in stages.
Filter Weight (NTP.FILTER): When the filter algorithm suggested in
Section 4 is used, this is the weight used to compute the filter
dispersion.
Select Weight (NTP.SELECT): When the selection algorithm suggested in
Section 4 is used, this is the weight used to compute the select
dispersion.
Modes of Operation
Except in broadcast mode, an NTP association is formed when two peers
exchange messages and one or both of them create and maintain an
instantiation of the protocol machine, called an association. The
association can operate in one of five modes as indicated by the host-
mode variable (peer.mode): symmetric active, symmetric passive, client,
server and broadcast, which are defined as follows:
Symmetric Active (1): A host operating in this mode sends periodic
messages regardless of the reachability state or stratum of its peer. By
operating in this mode the host announces its willingness to synchronize
and be synchronized by the peer.
Symmetric Passive (2): This type of association is ordinarily created
upon arrival of a message from a peer operating in the symmetric active
mode and persists only as long as the peer is reachable and operating at
a stratum level less than or equal to the host; otherwise, the
association is dissolved. However, the association will always persist
until at least one message has been sent in reply. By operating in this
mode the host announces its willingness to synchronize and be
synchronized by the peer.
Client (3): A host operating in this mode sends periodic messages
regardless of the reachability state or stratum of its peer. By
operating in this mode the host, usually a LAN workstation, announces
its willingness to be synchronized by, but not to synchronize the peer.
Server (4): This type of association is ordinarily created upon arrival
of a client request message and exists only in order to reply to that
request, after which the association is dissolved. By operating in this
mode the host, usually a LAN time server, announces its willingness to
synchronize, but not to be synchronized by the peer.
Broadcast (5): A host operating in this mode sends periodic messages
regardless of the reachability state or stratum of the peers. By
operating in this mode the host, usually a LAN time server operating on
a high-speed broadcast medium, announces its willingness to synchronize
all of the peers, but not to be synchronized by any of them.
A host operating in client mode occasionally sends an NTP message to a
host operating in server mode, perhaps right after rebooting and at
periodic intervals thereafter. The server responds by simply
interchanging addresses and ports, filling in the required information
and returning the message to the client. Servers need retain no state
information between client requests, while clients are free to manage
the intervals between sending NTP messages to suit local conditions. In
these modes the protocol machine described in this document can be
considerably simplified to a simple remote-procedure-call mechanism
without significant loss of accuracy or robustness, especially when
operating over high-speed LANs.
In the symmetric modes the client/server distinction (almost)
disappears. Symmetric passive mode is intended for use by time servers
operating near the root nodes (lowest stratum) of the synchronization
subnet and with a relatively large number of peers on an intermittent
basis. In this mode the identity of the peer need not be known in
advance, since the association with its state variables is created only
when an NTP message arrives. Furthermore, the state storage can be
reused when the peer becomes unreachable or is operating at a higher
stratum level and thus ineligible as a synchronization source.
Symmetric active mode is intended for use by time servers operating near
the end nodes (highest stratum) of the synchronization subnet. Reliable
time service can usually be maintained with two peers at the next lower
stratum level and one peer at the same stratum level, so the rate of
ongoing polls is usually not significant, even when connectivity is lost
and error messages are being returned for every poll.
Normally, one peer operates in an active mode (symmetric active, client
or broadcast modes) as configured by a startup file, while the other
operates in a passive mode (symmetric passive or server modes), often
without prior configuration. However, both peers can be configured to
operate in the symmetric active mode. An error condition results when
both peers operate in the same mode, but not symmetric active mode. In
such cases each peer will ignore messages from the other, so that prior
associations, if any, will be demobilized due to reachability failure.
Broadcast mode is intended for operation on high-speed LANs with
numerous workstations and where the highest accuracies are not required.
In the typical scenario one or more time servers on the LAN send
periodic broadcasts to the workstations, which then determine the time
on the basis of a preconfigured latency in the order of a few
milliseconds. As in the client/server modes the protocol machine can be
considerably simplified in this mode; however, a modified form of the
clock selection algorithm may prove useful in cases where multiple time
servers are used for enhanced reliability.
Event Processing
The significant events of interest in NTP occur upon expiration of a
peer timer (peer.timer), one of which is dedicated to each peer with an
active association, and upon arrival of an NTP message from the various
peers. An event can also occur as the result of an operator command or
detected system fault, such as a primary reference source failure. This
section describes the procedures invoked when these events occur.
Notation Conventions
The NTP filtering and selection algorithms act upon a set of variables
for clock offset (<$Etheta ,~THETA>), roundtrip delay (<$Edelta
,~DELTA>) and dispersion (<$Eepsilon ,~EPSILON>). When necessary to
distinguish between them, lower-case Greek letters are used for
variables relative to a peer, while upper-case Greek letters are used
for variables relative to the primary reference source(s), i.e., via the
peer to the root of the synchronization subnet. Subscripts will be used
to identify the particular peer when this is not clear from context. The
algorithms are based on a quantity called the synchronization distance
(<$Elambda ,~LAMBDA>), which is computed from the roundtrip delay and
dispersion as described below.
As described in Appendix H, the peer dispersion <$Eepsilon> includes
contributions due to measurement error <$Erho~=~1~<< <<~roman
sys.precision>, skew-error accumulation <$Ephi tau>, where
<$Ephi~=~roman {NTP.MAXSKEW over NTP.MAXAGE}> is the maximum skew rate
and <$Etau~=~roman {sys.clock~-~peer.update}> is the interval since the
last update, and filter (sample) dispersion <$Eepsilon sub sigma>
computed by the clock-filter algorithm. The root dispersion <$EEPSILON>
includes contributions due to the selected peer dispersion <$Eepsilon>
and skew-error accumulation <$Ephi tau>, together with the root
dispersion for the peer itself. The system dispersion includes the
select (sample) dispersion <$Eepsilon sub xi> computed by the clock-
select algorithm and the absolute initial clock offset <$E| THETA |>
provided to the local-clock algorithm. Both <$Eepsilon> and <$EEPSILON>
are dynamic quantities, since they depend on the elapsed time <$Etau>
since the last update, as well as the sample dispersions calculated by
the algorithms.
Each time the relevant peer variables are updated, all dispersions
associated with that peer are updated to reflect the skew-error
accumulation. The computations can be summarized as follows:
<$Etheta~==~roman peer.offset> ,
<$Edelta~==~roman peer.delay> ,
<$Eepsilon~==~roman peer.dispersion~=~rho~+~phi tau~+~epsilon sub sigma>
,
<$Elambda~==~epsilon~+~{| delta |} over 2> ,
where <$Etau> is the interval since the original timestamp (from which
<$Etheta> and <$Edelta> were determined) was transmitted to the present
time and <$Eepsilon sub sigma> is the filter dispersion (see clock-
filter procedure below). The variables relative to the root of the
synchronization subnet via peer i are determined as follows:
<$ETHETA sub i~==~theta sub i> ,
<$EDELTA sub i~==~roman peer.rootdelay~+~delta sub i> ,
<$EEPSILON sub i~==~roman peer.rootdispersion~+~epsilon sub i~+~phi tau
sub i> ,
<$ELAMBDA sub i~==~EPSILON sub i~+~{| DELTA sub i |} over 2> ,
where all variables are understood to pertain to the ith peer. Finally,
assuming the ith peer is selected for synchronization, the system
variables are determined as follows:
<$ETHETA~=~>combined final offset ,
<$EDELTA~=~DELTA sub i> ,
<$EEPSILON~=~EPSILON sub i~+~epsilon sub xi~+~| THETA |> ,
<$ELAMBDA~=~LAMBDA sub i> ,
where <$Eepsilon sub xi> is the select dispersion (see clock-selection
procedure below).
Informal pseudo-code which accomplishes these computations is presented
below. Note that the pseudo-code is represented in no particular
language, although it has many similarities to the C language. Specific
details on the important algorithms are further illustrated in the C-
language routines in Appendix I.
Transmit Procedure
The transmit procedure is executed when the peer timer decrements to
zero for all modes except client mode with a broadcast server and server
mode in all cases. In client mode with a broadcast server messages are
never sent. In server mode messages are sent only in response to
received messages. This procedure is also called by the receive
procedure when an NTP message arrives that does not result in a
persistent association.
begin transmit procedure
The following initializes the packet buffer and copies the packet
variables. The value skew is necessary to account for the skew-error
accumulated over the interval since the local clock was last set.
<$Eroman pkt.peeraddr~<<-~roman peer.hostaddr>; /* copy
system and peer variables */
<$Eroman pkt.peerport~<<-~roman peer.hostport>;
<$Eroman pkt.hostaddr~<<-~roman peer.peeraddr>;
<$Eroman pkt.hostport~<<-~roman peer.peerport>;
<$Eroman pkt.leap~<<-~roman sys.leap>;
<$Eroman pkt.version~<<-~roman NTP.VERSION>;
<$Eroman pkt.mode~<<-~roman peer.mode>;
<$Eroman pkt.stratum~<<-~roman sys.stratum>;
<$Eroman pkt.poll~<<-~roman peer.hostpoll>;
<$Eroman pkt.precision~<<-~roman sys.precision>;
<$Eroman pkt.rootdelay~<<-~roman sys.rootdelay>;
if (sys.leap = 112 or (sys.clock <196> sys.reftime) >>
NTP.MAXAGE)
<$Eskew~<<-~roman NTP.MAXSKEW>;
else
<$Eskew~<<-~phi roman {(sys.clock~-~sys.reftime)}>;
<$Eroman {pkt.rootdispersion~<<-~roman
sys.rootdispersion~+~(1~<< <<~sys.precision)}~+~skew>;
<$Eroman pkt.refid~<<-~roman sys.refid>;
<$Eroman pkt.reftime~<<-~roman sys.reftime>;
The transmit timestamp pkt.xmt will be used later in order to validate
the reply; thus, implementations must save the exact value transmitted.
In addition, the order of copying the timestamps should be designed so
that the time to format and copy the data does not degrade accuracy.
<$Eroman pkt.org~<<-~roman peer.org>;
/* copy timestamps */
<$Eroman pkt.rec~<<-~roman peer.rec>;
<$Eroman pkt.xmt~<<-~roman sys.clock>;
<$Eroman peer.xmt~<<-~roman pkt.xmt>;
The call to encrypt is implemented only if authentication is
implemented. If authentication is enabled, the delay to encrypt the
authenticator may degrade accuracy. Therefore, implementations should
include a system state variable (not mentioned elsewhere in this
specification) which contains an offset calculated to match the expected
encryption delay and correct the transmit timestamp as obtained from the
local clock.
#ifdef (authentication implemented) /* see Appendix C */
call encrypt;
#endef
send packet;
The reachability register is shifted one position to the left, with zero
replacing the vacated bit. If all bits of this register are zero, the
clear procedure is called to purge the clock filter and reselect the
synchronization source, if necessary. If the association was not
configured by the initialization procedure, the association is
demobilized.
<$Eroman peer.reach~<<-~roman peer.reach~<< <<~1>;
/* update reachability */
if (<$Eroman peer.reach~=~0> and <$Eroman peer.config~=~0>)
begin
demobilize association;
exit;
endif
If valid data have been shifted into the filter register at least once
during the preceding two poll intervals (low-order bit of peer.reach set
to one), the valid data counter is incremented. After eight such valid
intervals the poll interval is incremented. Otherwise, the valid data
counter and poll interval are both decremented and the clock-filter
procedure called with zero values for offset and delay and
NTP.MAXDISPERSE for dispersion. The clock-select procedure is called to
reselect the synchronization source, if necessary.
if (<$Eroman peer.reach~&~6~!=~0>) /* test
two low-order bits (shifted) */
if (<$Eroman peer.valid~<<~roman NTP.SHIFT>) /* valid
data received */
<$Eroman peer.valid~<<-~roman peer.valid~+~1>;
else <$Eroman peer.hostpoll~<<-~roman
peer.hostpoll~+~1>;
else begin
<$Eroman peer.valid~<<-~roman peer.valid~-~1>; /*
nothing heard */
<$Eroman peer.hostpoll~<<-~roman peer.hostpoll~-~1>);
call clock-filter(0, 0, NTP.MAXDISPERSE);
call clock-select; /* select clock
source */
endif
call poll-update;
end transmit procedure;
Receive Procedure
The receive procedure is executed upon arrival of an NTP message. It
validates the message, interprets the various modes and calls other
procedures to filter the data and select the synchronization source. If
the version number in the packet does not match the current version, the
message may be discarded; however, exceptions may be advised on a case-
by-case basis at times when the version is changed. If the NTP control
messages described in Appendix B are implemented and the packet mode is
6 (control), the control-message procedure is called. The source and
destination Internet addresses and ports in the IP and UDP headers are
matched to the correct peer. If there is no match a new instantiation of
the protocol machine is created and the association mobilized.
begin receive procedure
if (<$Eroman pkt.version~!=~roman NTP.VERSION>) exit;
#ifdef (control messages implemented)
if (<$Eroman pkt.mode~=~6>) call control-message;
#endef
for (all associations) /* access control goes
here */
match addresses and ports to associations;
if (no matching association)
call receive-instantiation procedure; /* create
association */
The call to decrypt is implemented only if authentication is
implemented.
#ifdef (authentication implemented) /* see Appendix C */
call decrypt;
#endef
If the packet mode is nonzero, this becomes the value of mode used in
the following step; otherwise, the peer is an old NTP version and mode
is determined from the port numbers as described in Section 3.3.
if (pkt.mode = 0) /* for
compatibility with old versions */
<$Emode~<<-~>(see Section 3.3);
else
<$Emode~<<-~roman pkt.mode>;
Table 5<$&tab5> shows for each combination of peer.mode and mode the
resulting case labels.
case (mode, peer.hostmode) /* see Table 5 */
If error the packet is simply ignored and the association demobilized,
if not previously configured.
error: if (<$Eroman peer.config~=~0>) demobilize association;
/* see no evil */
break;
If recv the packet is processed and the association marked reachable if
tests five through eight (valid header) enumerated in the packet
procedure succeed. If, in addition, tests one through four succeed
(valid data), the clock-update procedure is called to update the local
clock. Otherwise, if the association was not previously configured, it
is demobilized.
recv: call packet; /* process
packet */
if (valid header) begin /* if valid header,
update local clock */
<$Eroman peer.reach~<<-~roman peer.reach~|~1>;
if (valid data) call clock-update;
endif
else
if (<$Eroman peer.config~=~0>) demobilize
association;
break;
If xmit the packet is processed and an immediate reply is sent. The
association is then demobilized if not previously configured.
xmit: call packet; /* process
packet */
<$Eroman peer.hostpoll~<<-~roman peer.peerpoll>;
/* send immediate reply */
call poll-update;
call transmit;
if (<$Eroman peer.config~=~0>) demobilize association;
break;
If pkt the packet is processed and the association marked reachable if
tests five through eight (valid header) enumerated in the packet
procedure succeed. If, in addition, tests one through four succeed
(valid data), the clock-update procedure is called to update the local
clock. Otherwise, if the association was not previously configured, an
immediate reply is sent and the association demobilized.
pkt: call packet; /* process
packet */
if (valid header) begin /* if valid header,
update local clock */
<$Eroman peer.reach~<<-~roman peer.reach~|~1>;
if (valid data) call clock-update;
endif
else if (<$Eroman peer.config~=~0>) begin
<$Eroman peer.hostpoll~<<-~roman
peer.peerpoll>; /* send immediate reply */
call poll-update;
call transmit;
demobilize association;
endif
endcase
end receive procedure;
Packet Procedure
The packet procedure checks the message validity, computes delay/offset
samples and calls other procedures to filter the data and select the
synchronization source. Test 1 requires the transmit timestamp not match
the last one received from the same peer; otherwise, the message might
be an old duplicate. Test 2 requires the originate timestamp match the
last one sent to the same peer; otherwise, the message might be out of
order, bogus or worse. In case of broadcast mode (5) the apparent
roundtrip delay will be zero and the full accuracy of the time-transfer
operation may not be achievable. However, the accuracy achieved may be
adequate for most purposes. The poll-update procedure is called with
argument peer.hostpoll (peer.peerpoll may have changed).
begin packet procedure
<$Eroman peer.rec~<<-~roman sys.clock>; /*
capture receive timestamp */
if (<$Eroman pkt.mode ~!=~5>) begin
<$Etest1~<<-~( roman {pkt.xmt~!=~peer.org})>; /* test
1 */
<$Etest2~<<-~( roman {pkt.org~=~peer.xmt})>; /* test
2 */
endif
else begin
<$Eroman pkt.org~<<-~roman peer.rec>;
/* fudge missing timestamps */
<$Eroman pkt.rec~<<-~roman pkt.xmt>;
<$Etest1~<<-~bold roman true>;
/* fake tests */
<$Etest2~<<-~bold roman true>;
endif
<$Eroman peer.org~<<-~roman pkt.xmt>;
/* update originate timestamp */
<$Eroman peer.peerpoll~<<-~roman pkt.poll>;
/* adjust poll interval */
call poll-update(peer.hostpoll);
Test 3 requires that both the originate and receive timestamps are
nonzero. If either of the timestamps are zero, the association has not
synchronized or has lost reachability in one or both directions.
<$Etest3~<<-~( roman pkt.org~!=~0> and <$Eroman pkt.rec~!=~0)>;
/* test 3 */
The roundtrip delay and clock offset relative to the peer are calculated
as follows. Number the times of sending and receiving NTP messages as
shown in Figure 2<$&fig2> and let i be an even integer. Then Ti-3, Ti-2,
Ti-1 and Ti are the contents of the pkt.org, pkt.rec, pkt.xmt and
peer.rec variables, respectively. The clock offset <$Etheta>, roundtrip
delay <$Edelta> and dispersion <$Eepsilon> of the host relative to the
peer is:
<$Edelta~=~(T sub i~-~T sub {i - 3} )~-~(T sub {i - 1}~-~T sub {i - 2}
)> ,
<$Etheta~=~{(T sub {i - 2}~-~T sub {i-3})~+~(T sub {i-1}~-~T sub i ) }
over 2> ,
<$Eepsilon~=~roman {(1~<< <<~sys.precision})~+~phi (T sub i ~-~T sub {i-
3} )> ,
where, as before, <$Ephi~=~roman{ NTP.MAXSKEW over NTP.MAXAGE}>. The
quantity <$Eepsilon> represents the maximum error or dispersion due to
measurement error at the host and local-clock skew accumulation over the
interval since the last message was transmitted to the peer.
Subsequently, the dispersion will be updated by the clock-filter
procedure.
The above method amounts to a continuously sampled, returnable-time
system, which is used in some digital telephone networks [BEL86]. Among
the advantages are that the order and timing of the messages are
unimportant and that reliable delivery is not required. Obviously, the
accuracies achievable depend upon the statistical properties of the
outbound and inbound data paths. Further analysis and experimental
results bearing on this issue can be found in [MIL90] and in Appendix H.
Test 4 requires that the calculated delay be within <169>reasonable<170>
bounds:
<$Etest4~<<-~(| delta |~<<~roman NTP.MAXDISPERSE~bold
and~epsilon~<<~roman NTP.MAXDISPERSE)>; /* test 4 */
Test 5 is implemented only if the authentication mechanism described in
Appendix C is implemented. It requires either that authentication be
explicitly disabled or that the authenticator be present and correct as
determined by the decrypt procedure.
#ifdef (authentication implemented) /* test 5 */
<$Etest5~<<-~( roman {(peer.config~=~1~bold
and~peer.authenable~=~0)~bold or~ peer.authentic~=~1})>;
#endef
Test 6 requires the peer clock be synchronized and the interval since
the peer clock was last updated be positive and less than NTP.MAXAGE.
Test 7 insures that the host will not synchronize on a peer with greater
stratum. Test 8 requires that the header contains <169>reasonable<170>
values for the pkt.rootdelay and pkt.rootdispersion fields.
<$Etest6~<<-~( roman pkt.leap~!=~11 sub 2> and /* test
6 */
<$Eroman
{pkt.reftime~<<=~pkt.xmt~<<~pkt.reftime~+~NTP.MAXAGE}>)
<$Etest7~<<-~roman {pkt.stratum ~<<=~sys.stratum}> and /* test
7 */
<$Eroman {pkt.stratum ~<<~NTP.MAXSTRATUM}>;
<$Etest8~<<-~( roman {| pkt.rootdelay |~<<~NTP.MAXDISPERSE}>
and /* test 8 */
<$Eroman {pkt.rootdispersion~<<~NTP.MAXDISPERSE})>;
With respect to further processing, the packet includes valid
(synchronized) data if tests one through four succeed
<$E(test1~&~test2~&~test3~&~test4~=~1)>, regardless of the remaining
tests. Only packets with valid data can be used to calculate offset,
delay and dispersion values. The packet includes a valid header if tests
five through eight succeed <$E(test5~&~test6~&~test7~&~test8~=~1)>,
regardless of the remaining tests. Only packets with valid headers can
be used to determine whether a peer can be selected for synchronization.
Note that <$Etest1> and <$Etest2> are not used in broadcast mode (forced
to true), since the originate and receive timestamps are undefined.
The clock-filter procedure is called to produce the delay (peer.delay),
offset (peer.offset) and dispersion (peer.dispersion) for the peer.
Specification of the clock-filter algorithm is not an integral part of
the NTP specification, since there may be other algorithms that work
well in practice. However, one found to work well in the Internet
environment is described in Section 4 and its use is recommended.
if (not valid header) exit;
<$Eroman peer.leap~<<-~roman pkt.leap>; /* copy
packet variables */
<$Eroman peer.stratum~<<-~roman pkt.stratum>;
<$Eroman peer.precision~<<-~roman pkt.precision>;
<$Eroman peer.rootdelay~<<-~roman pkt.rootdelay>;
<$Eroman peer.rootdispersion~<<-~roman pkt.rootdispersion>;
<$Eroman peer.refid~<<-~roman pkt.refid>;
<$Eroman peer.reftime~<<-~roman pkt.reftime>;
if (valid data) call clock-filter(<$Etheta ,~delta ,~epsilon>);
/* process sample */
end packet procedure;
Clock-Update Procedure
The clock-update procedure is called from the receive procedure when
valid clock offset, delay and dispersion data have been determined by
the clock-filter procedure for the current peer. The result of the
clock-selection and clock-combining procedures is the final clock
correction <$ETHETA>, which is used by the local-clock procedure to
update the local clock. If no candidates survive these procedures, the
clock-update procedure exits without doing anything further.
begin clock-update procedure
call clock-select; /* select clock
source */
if (<$Eroman sys.peer~!=~peer>) exit;
It may happen that the local clock may be reset, rather than slewed to
its final value. In this case the clear procedure is called for every
peer to purge the clock filter, reset the poll interval and reselect the
synchronization source, if necessary. Note that the local-clock
procedure sets the leap bits sys.leap to <169>unsynchronized<170> 112 in
this case, so that no other peer will attempt to synchronize to the host
until the host once again selects a peer for synchronization.
The distance procedure calculates the root delay <$EDELTA>, root
dispersion <$EEPSILON> and root synchronization distance <$ELAMBDA> via
the peer to the root of the synchronization subnet. The host will not
synchronize to the selected peer if the distance is greater than
NTP.MAXDISTANCE. The reason for the minimum clamp at NTP.MINDISPERSE is
to discourage subnet route flaps that can happen with Bellman-Ford
algorithms and small roundtrip delays.
<$ELAMBDA~<M=O>
<~>an distance (peer)>; /* update system
variables */
<B> if (<$ELAMBDA~>>=~roman NTP.MAXDISTANCE>) exit;
<$Eroman sys.leap~<<-~roman peer.leap>;
<$Eroman sys.stratum~<<-~roman peer.stratum~+~1>;
<$Eroman sys.refid~<<-~roman peer.peeraddr>;
call local-clock;
if (local clock reset) begin /* if reset,
clear state variables */
<$Eroman sys.leap~<<-~11 sub 2>;
for (all peers) call clear;
endif
else begin
<$Eroman sys.peer~<<-~peer>; /* if
not, adjust local clock */
<$Eroman sys.rootdelay~<<-~DELTA>;
<$Eroman sys.rootdispersion~<<-~EPSILON~+~max ( epsilon
sub xi~+~| THETA |,~roman NTP.MINDISPERSE)>;
endif
<$Eroman sys.reftime~<<-~roman sys.clock>;
end clock-update procedure;
In some system configurations a precise source of timing information is
available in the form of a train of timing pulses spaced at one-second
intervals. Usually, this is in addition to a source of timecode
information, such as a radio clock or even NTP itself, to number the
seconds, minutes, hours and days. In these configurations the system
variables are set to refer to the source from which the pulses are
derived. For those configurations which support a primary reference
source, such as a radio clock or calibrated atomic clock, the stratum is
set at one as long as this is the actual synchronization source and
whether or not the primary-clock procedure is used.
Specification of the clock-selection and local-clock algorithms is not
an integral part of the NTP specification, since there may be other
algorithms which provide equivalent performance. However, a clock-
selection algorithm found to work well in the Internet environment is
described in Section 4, while a local-clock algorithm is described in
Section 5 and their use is recommended. The clock-selection algorithm
described in Section 4 usually picks the peer at the lowest stratum and
minimum synchronization distance among all those available, unless that
peer appears to be a falseticker. The result is that the algorithms all
work to build a minimum-weight spanning tree relative to the primary
reference time servers and thus a hierarchical-master-slave
synchronization subnet.
Primary-Clock Procedure
When a primary reference source such as a radio clock is connected to
the host, it is convenient to incorporate its information into the data
base as if the clock were represented as an ordinary peer. In the
primary-clock procedure the clock is polled once a minute or so and the
returned timecode used to produce a new update for the local clock. When
peer.timer decrements to zero for a primary clock peer, the transmit
procedure is not called; rather, the radio clock is polled, usually
using an ASCII string specified for this purpose. When a valid timecode
is received from the radio clock, it is converted to NTP timestamp
format and the peer variables updated. The value of peer.leap is set
depending on the status of the leap-warning bit in the timecode, if
available, or manually by the operator. The value for peer.peeraddr,
which will become the value of sys.refid when the clock-update procedure
is called, is set to an ASCII string describing the clock type (see
Appendix A).
begin primary-clock-update procedure
<$Eroman peer.leap~<<-~"from"~radio~or~operator>; /* copy
variables */
<$Eroman peer.peeraddr~<<-~ASCII~identifier>;
<$Eroman peer.rec~<<-~radio~timestamp>;
<$Eroman peer.reach~<<-~1>;
call clock-filter(<$Eroman {sys.clock~-~peer.rec,~0,~1~<<
<<~peer.precision}>); /* process sample */
call clock-update; /* update local
clock */
end primary-clock-update procedure;
Initialization Procedures
The initialization procedures are used to set up and initialize the
system, its peers and associations.
Initialization Procedure
The initialization procedure is called upon reboot or restart of the NTP
daemon. The local clock is presumably undefined at reboot; however, in
some equipment an estimate is available from the reboot environment,
such as a battery-backed clock/calendar. The precision variable is
determined by the intrinsic architecture of the local hardware clock.
The authentication variables are used only if the authentication
mechanism described in Appendix C is implemented. The values of these
variables are determined using procedures beyond the scope of NTP
itself.
begin initialization procedure
#ifdef (authentication implemented) / * see Appendix C */
<$Eroman sys.keys~<<-~as~required>;
#endef;
<$Eroman sys.leap~<<-~11 sub 2>;
/* copy variables */
<$Eroman sys.stratum~<<-~0~(undefined)>;
<$Eroman sys.precision~<<-~host~precision>;
<$Eroman sys.rootdelay~<<-~0~(undefined)>;
<$Eroman sys.rootdispersion~<<-~0~(undefined)>;
<$Eroman sys.refid~<<-~0~(undefined)>;
<$Eroman sys.reftime~<<-~0~(undefined)>;
<$Eroman sys.clock~<<-~external~reference>;
<$Eroman sys.peer~<<-~roman NULL>;
<$Eroman sys.poll~<<-~roman NTP.MINPOLL>;
for (all configured peers) /* create
configured associations */
call initialization-instantiation procedure;
end initialization procedure;
Initialization-Instantiation Procedure
This implementation-specific procedure is called from the initialization
procedure to define an association. The addresses and modes of the peers
are determined using information read during the reboot procedure or as
the result of operator commands. The authentication variables are used
only if the authentication mechanism described in Appendix C is
implemented. The values of these variables are determined using
procedures beyond the scope of NTP itself. With the authentication bits
set as suggested, only properly authenticated peers can become the
synchronization source.
begin initialization-instantiation procedure
<$Eroman peer.config~<<-~1>;
#ifdef (authentication implemented) /* see Appendix C */
<$Eroman peer.authenable~<<-~1~(suggested)>;
<$Eroman peer.authentic~<<-~0>;
<$Eroman peer.hostkeyid~<<-~as~required>;
<$Eroman peer.peerkeyid~<<-~0>;
#endef;
<$Eroman peer.peeraddr~<<-~peer~IP~address>; /* copy
variables */
<$Eroman peer.peerport~<<-~roman NTP.PORT>;
<$Eroman peer.hostaddr~<<-~host~IP~address>;
<$Eroman peer.hostport~<<-~roman NTP.PORT>;
<$Eroman peer.mode~<<-~host~mode>;
<$Eroman peer.peerpoll~<<-~0~(undefined)>;
<$Eroman peer.timer~<<-~0>;
<$Eroman peer.delay~<<-~0~(undefined)>;
<$Eroman peer.offset~<<-~0~(undefined)>;
call clear; /* initialize
association */
end initialization-instantiation procedure;
Receive-Instantiation Procedure
The receive-instantiation procedure is called from the receive procedure
when a new peer is discovered. It initializes the peer variables and
mobilizes the association. If the message is from a peer operating in
client mode (3), the host mode is set to server mode (4); otherwise, it
is set to symmetric passive mode (2). The authentication variables are
used only if the authentication mechanism described in Appendix C is
implemented. If implemented, only properly authenticated non-configured
peers can become the synchronization source.
begin receive-instantiation procedure
#ifdef (authentication implemented) /* see Appendix C */
<$Eroman peer.authenable~<<-~0>;
<$Eroman peer.authentic~<<-~0>;
<$Eroman peer.hostkeyid~<<-~as~required>;
<$Eroman peer.peerkeyid~<<-~0>;
#endef
<$Eroman peer.config~<<-~0>; /* copy
variables */
<$Eroman peer.peeraddr~<<-~roman pkt.peeraddr>;
<$Eroman peer.peerport~<<-~roman pkt.peerport>;
<$Eroman peer.hostaddr~<<-~roman pkt.hostaddr>;
<$Eroman peer.hostport~<<-~roman pkt.hostport>;
if (pkt.mode = 3) /* determine
mode */
<$Eroman peer.mode~<<-~4>;
else
<$Eroman peer.mode~<<-~2>;
<$Eroman peer.peerpoll~<<-~0~(undefined)>;
<$Eroman peer.timer~<<-~0>;
<$Eroman peer.delay~<<-~0~(undefined)>;
<$Eroman peer.offset~<<-~0~(undefined)>;
call clear; /* initialize
association */
end receive-instantiation procedure;
Primary Clock-Instantiation Procedure
This procedure is called from the initialization procedure in order to
set up the state variables for the primary clock. The value for
peer.precision is determined from the radio clock specification and
hardware interface. The value for peer.rootdispersion is nominally ten
times the inherent maximum error of the radio clock; for instance,
<$E10~mu s> for a calibrated atomic clock, 10 ms for a WWVB or GOES
radio clock and 100 ms for a less accurate WWV radio clock.
begin clock-instantiation procedure
<$Eroman peer.config~<<-~1>; /* copy
variables */
<$Eroman peer.peeraddr~<<-~0~undefined>;
<$Eroman peer.peerport~<<-~0~(not~used)>;
<$Eroman peer.hostaddr~<<-~0~(not~used)>;
<$Eroman peer.hostport~<<-~0~(not~used)>;
<$Eroman peer.leap~<<-~11 sub 2>;
<$Eroman peer.mode~<<-~0~(not~used)>;
<$Eroman peer.stratum~<<-~0>;
<$Eroman peer.peerpoll~<<-~0~(undefined)>;
<$Eroman peer.precision~<<-~clock~precision>;
<$Eroman peer.rootdelay~<<-~0>;
<$Eroman peer.rootdispersion~<<-~clock~dispersion>;
<$Eroman peer.refid~<<-~0~(not~used)>;
<$Eroman peer.reftime~<<-~0~(undefined)>;
<$Eroman peer.timer~<<-~0>;
<$Eroman peer.delay~<<-~0~(undefined)>;
<$Eroman peer.offset~<<-~0~(undefined)>;
call clear; /* initialize
association */
end clock-instantiation procedure;
In some configurations involving a calibrated atomic clock or LORAN-C
receiver, the primary reference source may provide only a seconds pulse,
but lack a complete timecode from which the numbering of the seconds,
etc., can be derived. In these configurations seconds numbering can be
derived from other sources, such as a radio clock or even other NTP
peers. In these configurations the primary clock variables should
reflect the primary reference source, not the seconds-numbering source;
however, if the seconds-numbering source fails or is known to be
operating incorrectly, updates from the primary reference source should
be suppressed as if it had failed.
Clear Procedure
The clear procedure is called when some event occurs that results in a
significant change in reachability state or potential disruption of the
local clock.
begin clear procedure
<$Eroman peer.org~<<-~0~(undefined)>; /* mark
timestamps undefined */
<$Eroman peer.rec~<<-~0~(undefined)>;
<$Eroman peer.xmt~<<-~0~(undefined)>;
<$Eroman peer.reach~<<-~0>; /* reset
state variables */
<$Eroman peer.filter~<<-~[0,~,0,~roman NTP.MAXDISPERSE]>; /*
all stages */
<$Eroman peer.valid~<<-~0>;
<$Eroman peer.dispersion~<<-~roman NTP.MAXDISPERSE>;
<$Eroman {peer.hostpoll~<<-~NTP.MINPOLL}>; /* reset
poll interval */
call poll-update;
call clock-select; /* select clock
source */
end clear procedure;
Poll-Update Procedure
The poll-update procedure is called when a significant event occurs that
may result in a change of the poll interval or peer timer. It checks the
values of the host poll interval (peer.hostpoll) and peer poll interval
(peer.peerpoll) and clamps each within the valid range. If the peer is
selected for synchronization, the value is further clamped as a function
of the computed compliance (see Section 5).
begin poll-update procedure
<$Etemp~<<-~roman peer.hostpoll>; /*
determine host poll interval */
if (<$Epeer~=~roman sys.peer>)
<$Etemp~<<-~min (temp,~roman {sys.poll,~NTP.MAXPOLL)}>;
else
<$Etemp~<<-~min (temp,~roman NTP.MAXPOLL)>;
<$Eroman peer.hostpoll~<<-~max (temp,~roman NTP.MINPOLL)>;
<$Etemp~<<-~1~<< << ~min ( roman {peer.hostpoll,~max
(peer.peerpoll,~NTP.MINPOLL)})>;
If the poll interval is unchanged and the peer timer is zero, the timer
is simply reset. If the poll interval is changed and the new timer value
is greater than the present value, no additional action is necessary;
otherwise, the peer timer must be reduced. When the peer timer must be
reduced it is important to discourage tendencies to synchronize
transmissions between the peers. A prudent precaution is to randomize
the first transmission after the timer is reduced, for instance by the
sneaky technique illustrated.
if (peer.timer = 0) /* reset peer
timer */
<$Eroman peer.timer~<<-~temp>;
else if (<$Eroman peer.timer~>>~temp>)
<$Eroman peer.timer~<<-~( roman sys.clock~&~(temp~-
~1))~+~1>;
end poll-update procedure;
Synchronization Distance Procedure
The distance procedure calculates the synchronization distance from the
peer variables for the peer peer.
begin distance(peer) procedure;
<$EDELTA~<<-~roman {peer.rootdelay~+~|peer.delay|}>;
<$EEPSILON~<<-~roman
{peer.rootdispersion~+~peer.dispersion~+~phi (sys.clock~-~peer.update)
}>;
<$ELAMBDA~<<-~EPSILON~+~{| DELTA |} over 2> ;
end distance procedure;
Note that, while <$EDELTA> may be negative in some cases, both
<$EEPSILON> and <$ELAMBDA> are always positive.
Access Control Issues
The NTP design is such that accidental or malicious data modification
(tampering) or destruction (jamming) at a time server should not in
general result in timekeeping errors elsewhere in the synchronization
subnet. However, the success of this approach depends on redundant time
servers and diverse network paths, together with the assumption that
tampering or jamming will not occur at many time servers throughout the
synchronization subnet at the same time. In principle, the subnet
vulnerability can be engineered through the selection of time servers
known to be trusted and allowing only those time servers to become the
synchronization source. The authentication procedures described in
Appendix C represent one mechanism to enforce this; however, the
encryption algorithms can be quite CPU-intensive and can seriously
degrade accuracy, unless precautions such as mentioned in the
description of the transmit procedure are taken.
While not a required feature of NTP itself, some implementations may
include an access-control feature that prevents unauthorized access and
controls which peers are allowed to update the local clock. For this
purpose it is useful to distinguish between three categories of access:
those that are preauthorized as trusted, preauthorized as friendly and
all other (non-preauthorized) accesses. Presumably, preauthorization is
accomplished by entries in the configuration file or some kind of
ticket-management system such as Kerberos [STE88]. In this model only
trusted accesses can result in the peer becoming the synchronization
source. While friendly accesses cannot result in the peer becoming the
synchronization source, NTP messages and timestamps are returned as
specified.
It does not seem useful to maintain a secret clock, as would result from
restricting non-preauthorized accesses, unless the intent is to hide the
existence of the time server itself. Well-behaved Internet hosts are
expected to return an ICMP service-unavailable error message if a
service is not implemented or resources are not available; however, in
the case of NTP the resources required are minimal, so there is little
need to restrict requests intended only to read the clock. A simple but
effective access-control mechanism is then to consider all associations
preconfigured in a symmetric mode or client mode (modes 1, 2 and 3) as
trusted and all other associations, preconfigured or not, as friendly.
If a more comprehensive trust model is required, the design can be based
on an access-control list with each entry consisting of a 32-bit
Internet address, 32-bit mask and three-bit mode. If the logical AND of
the source address (pkt.peeraddr) and the mask in an entry matches the
corresponding address in the entry and the mode (pkt.mode) matches the
mode in the entry, the access is allowed; otherwise an ICMP error
message is returned to the requestor. Through appropriate choice of
mask, it is possible to restrict requests by mode to individual
addresses, a particular subnet or net addresses, or have no restriction
at all. The access-control list would then serve as a filter controlling
which peers could create associations.
Filtering and Selection Algorithms
A most important factor affecting the accuracy and reliability of time
distribution is the complex of algorithms used to reduce the effect of
statistical errors and falsetickers due to failure of various subnet
components, reference sources or propagation media. The algorithms
suggested in this section were developed and refined over several years
of operation in the Internet under widely varying topologies, speeds and
traffic regimes. While these algorithms are believed the best available
at the present time, they are not an integral part of the NTP
specification, since other algorithms with similar or superior
performance may be devised in future.
However, it is important to observe that not all time servers or clients
in an NTP synchronization subnet must implement these algorithms. For
instance, simple workstations may dispense with one or both of them in
the interests of simplicity if accuracy and reliability requirements
justify. Nevertheless, it would be expected that an NTP server providing
synchronization to a sizable community, such as a university campus or
research laboratory, would be expected to implement these algorithms or
others proved to have equivalent functionality. A comprehensive
discussion of the design principles and performance is given in
[MIL91a].
In order for the NTP filter and selection algorithms to operate
effectively, it is useful to have a measure of recent sample variance
recorded for each peer. The measure adopted is based on first-order
differences, which are easy to compute and effective for the purposes
intended. There are two measures, one called the filter dispersion
<$Eepsilon sub sigma> and the other the select dispersion <$Eepsilon sub
xi>. Both are computed as the weighted sum of the clock offsets in a
temporary list sorted by synchronization distance. If <$Etheta sub i
~(0~<<=~i~<<~n)> is the offset of the ith entry, then the sample
difference <$Eepsilon sub ij> of the ith entry relative to the jth entry
is defined <$Eepsilon sub ij~<~>=~| theta sub i~-~theta sub j |> . The
dispersion relative to the jth entry is defined <$Eepsilon sub j> and
computed as the weighted sum
<$Eepsilon sub j~=~sum from {i~=~0} to {n~-~1}~epsilon sub ij~w~sup
{i+1}> ,
where w is a weighting factor chosen to control the influence of
synchronization distance in the dispersion budget. In the NTP algorithms
w is chosen less than <$E1 / 2>: <$Ew~=~roman NTP.FILTER> for filter
dispersion and <$Ew~=~roman NTP.SELECT> for select dispersion. The
(absolute) dispersion <$Eepsilon sub sigma> and <$Eepsilon sub xi> as
used in the NTP algorithms are defined relative to the 0th entry
<$Eepsilon sub 0>.
There are two procedures described in the following, the clock-filter
procedure, which is used to select the best offset samples from a given
clock, and the clock-selection procedure, which is used to select the
best clock among a hierarchical set of clocks.
Clock-Filter Procedure
The clock-filter procedure is executed upon arrival of an NTP message or
other event that results in new data samples. It takes arguments of the
form (<$Etheta ,~delta ,~epsilon>), where <$Etheta> is a sample clock
offset measurement and <$Edelta> and <$Eepsilon> are the associated
roundtrip delay and dispersion. It determines the filtered clock offset
(peer.offset), roundtrip delay (peer.delay) and dispersion
(peer.dispersion). It also updates the dispersion of samples already
recorded and saves the current time (peer.update).
The basis of the clock-filter procedure is the filter shift register
(peer.filter), which consists of NTP.SHIFT stages, each stage containing
a 3-tuple <$E[ theta sub i ,~delta sub i ,~epsilon sub i ]>, with
indices numbered from zero on the left. The filter is initialized with
the value <$E[0,~0,~roman NTP.MAXDISPERSE]> in all stages by the clear
procedure. New data samples are shifted into the filter at the left end,
causing first NULLs then old samples to fall off the right end. The
packet procedure provides samples of the form (<$Etheta ,~delta
,~epsilon>) as new updates arrive, while the transmit procedure provides
samples of the form <$E[0,~0,~roman NTP.MAXDISPERSE]> when two poll
intervals elapse without a fresh update. While the same symbols
(<$Etheta ,~delta ,~epsilon>) are used here for the arguments, clock-
filter contents and peer variables, the meaning will be clear from
context. The following pseudo-code describes this procedure.
begin clock-filter procedure (<$Etheta ,~delta ,~epsilon>)
The dispersion <$Eepsilon sub i> for all valid samples in the filter
register must be updated to account for the skew-error accumulation
since the last update. These samples are also inserted on a temporary
list with entry format <$E[distance,index]>. The samples in the register
are shifted right one stage, with the overflow sample discarded and the
new sample inserted at the leftmost stage. The temporary list is then
sorted by increasing distance. If no samples remain in the list, the
procedure exits without updating the peer variables.
for (i from NTP.SIZE <196> 1 to 1) begin /* update
dispersion */
<$E[ theta sub i ,~delta sub i ,~epsilon sub i ]~<<-~[
theta sub {i-1} ,~delta sub {i-1} ,~epsilon sub {i-1} ]>;
/* shift stage right */
<$Eepsilon sub i~=~epsilon sub i~+~phi tau>;
add <$E[ lambda sub i~==~epsilon sub i~+~{| delta sub i
|} over 2 ,~i]> to temporary list;
endfor;
<$E[ theta sub 0 ,~delta sub 0 ,~epsilon sub 0 ]~<<-~[ theta
,~delta ,~epsilon ]>; /* insert new sample */
add <$E[ lambda~==~epsilon~+~{| delta |} over 2 ,~0]> to
temporary list;
<$Eroman peer.update~<<-~roman sys.clock>;
/* reset base time */
sort temporary list by increasing <$E[distance~||index]>;
where <$E[distance~||index]> represents the concatenation of the
distance and index fields and distance is the high-order field. The
filter dispersion <$Eepsilon sub sigma> is computed and included in the
peer dispersion. Note that for this purpose the temporary list is
already sorted.
<$Eepsilon sub sigma~<<-~0>;
for (i from NTP.SHIFT<196>1 to 0) /* compute
filter dispersion */
if (<$Eroman peer.dispersion sub index[i]~>>=~roman
NTP.MAXDISPERSE> or
<$E| theta sub i~-~theta sub 0 |~>>~roman
NTP.MAXDISPERSE>)
<$Eepsilon sub sigma~<~><<-~( epsilon sub
sigma~+~roman NTP.MAXDISPERSE)~times~roman NTP.FILTER>;
else
<$Eepsilon sub sigma~<~><<-~( epsilon sub
sigma~+~| theta sub i~-~theta sub 0 |)~times~roman NTP.FILTER>;
The peer offset <$Etheta sub 0>, delay <$Edelta sub 0> and dispersion
<$Eepsilon sub 0> are chosen as the values corresponding to the minimum-
distance sample; in other words, the sample corresponding to the first
entry on the temporary list, here represented as the 0th subscript.
<$Eroman peer.offset~<<-~theta sub 0>;
/* update peer variables */
<$Eroman peer.delay~<<-~delta sub 0>;
<$Eroman peer.dispersion~<<-~min ( epsilon sub 0~+~epsilon sub
sigma ,~roman NTP.MAXDISPERSE)>;
end clock-filter procedure
The peer.offset and peer.delay variables represent the clock offset and
roundtrip delay of the local clock relative to the peer clock. Both of
these are precision quantities and can usually be averaged over long
intervals in order to improve accuracy and stability without bias
accumulation (see Appendix H). The peer.dispersion variable represents
the maximum error due to measurement error, skew-error accumulation and
sample variance. All three variables are used in the clock-selection and
clock-combining procedures to select the peer clock(s) used for
synchronization and to maximize the accuracy and stability of the
indications.
Clock-Selection Procedure
The clock-selection procedure uses the peer variables <$ETHETA>,
<$EDELTA>, <$EEPSILON> and <$Etau> and is called when these variables
change or when the reachability status changes. It consists of two
algorithms, the intersection algorithm and the clustering algorithm. The
intersection algorithm constructs a list of candidate peers eligible to
become the synchronization source, computes a confidence interval for
each and casts out falsetickers using a technique adapted from Marzullo
and Owicki [MAR85]. The clustering algorithm sorts the list of surviving
candidates in order of stratum and synchronization distance and
repeatedly casts out outlyers on the basis of select dispersion until
only the most accurate, precise and stable survivors are left. A bit is
set for each survivor to indicate the outcome of the selection process.
The system variable sys.peer is set as a pointer to the most likely
survivor, if there is one, or to the NULL value if not.
Intersection Algorithm
begin clock-selection procedure
Each peer is examined in turn and added to an endpoint list only if it
passes several sanity checks designed to avoid loops and use of
exceptionally noisy data. If no peers survive the sanity checks, the
procedure exits without finding a synchronization source. For each of m
survivors three entries of the form <$E[endpoint,~type]> are added to
the endpoint list: <$E[ THETA~-~LAMBDA ,~-~1]>, <$E[ THETA ,~0]> and
<$E[ THETA~+~LAMBDA ,~1]>. There will be <$E3 m> entries on the list,
which is then sorted by increasing endpoint.
<$Em~<<-~0>;
for (each peer) /* calling all peers */
if (<$Eroman {peer.reach~!=~0~bold
and~peer.dispersion~<<~NTP.MAXDISPERSE}> and
not (peer.stratum >> 1 and peer.refid =
peer.hostaddr)) begin
<$ELAMBDA~<MO>
<~>an distance (peer)>; /* make list entry */
add <$E[ THETA~-~LAMBDA ,~-1]> to endpoint list;
add <$E[ THETA ,~0]> to endpoint list;
add <$E[ THETA~+~LAMBDA ,~1]> to endpoint list;
<$Em~<<-~m~+~1>;
<B>endif
endfor
if (<$Em~=~0>) begin /* skedaddle if
no candidates */
<$Eroman sys.peer~<<-~roman NULL>;
<$Eroman sys.stratum~<<-~0~(undefined)>;
exit;
endif
sort endpoint list by increasing endpoint||type;
The following algorithm is adapted from DTS [DEC89] and is designed to
produce the largest single intersection containing only truechimers. The
algorithm begins by initializing a value f and counters i and c to zero.
Then, starting from the lowest endpoint of the sorted endpoint list, for
each entry <$E[endpoint,~type]> the value of type is subtracted from the
counter i, which is the number of intersections. If type is zero,
increment the value of c, which is the number of falsetickers (see
Appendix H). If <$Ei~>>=~m~-~f> for some entry, endpoint of that entry
becomes the lower endpoint of the intersection; otherwise, f is
increased by one and the above procedure is repeated. Without resetting
f or c, a similar procedure is used to find the upper endpoint, except
that the value of type is added to the counter.. If after both endpoints
have been determined <$Ec~<<=~f>, the procedure continues having found
<$Em~-~f> truechimers; otherwise, f is increased by one and the entire
procedure is repeated.
for (f from 0 to <$Ef~>>=~m over 2>) begin /*
calling all truechimers */
<$Ec~<<-~0>;
<$Ei~<<-~0>;
for (each [endpoint, type] from lowest) begin /* find
low endpoint */
<$Ei~<<-~i~-~type>;
<$Elow~<<-~endpoint>;
if (<$Ei~>>=~m~-~f>) break;
if (<$Etype~=~0>) <$Ec~<<-~c~+~1>;
endfor;
<$Ei~<<-~0>;
for (each [endpoint, type] from highest) begin /* find
high endpoint */
<$Ei~<<-~i~+~type>;
<$Ehigh~<<-~endpoint>;
if (<$Ei~>>=~m~-~f>) break;
if (<$Etype~=~0>) <$Ec~<<-~c~+~1>;
endfor;
if (<$Ec~<<=~f>) break; /* continue
until all falsetickers found */
endfor;
if (<$Elow~>>~high>) begin /* quit
if no intersection found */
<$Eroman sys.peer~<<-~roman NULL>;
exit;
endif;
Note that processing continues past this point only if there are more
than <$Em over 2> intersections. However, it is possible, but not highly
likely, that there may be fewer than <$Em over 2> truechimers remaining
in the intersection.
Clustering Algorithm
In the original DTS algorithm the clock-selection procedure exits at
this point with the presumed correct time set midway in the computed
intersection <$E[low,~high]>. However, this can lead to a considerable
loss in accuracy and stability, since the individual peer statistics are
lost. Therefore, in NTP the candidates that survived the preceding steps
are processed further. The candidate list is rebuilt with entries of the
form <$E[distance,~index]>, where distance is computed from the (scaled)
peer stratum and synchronization distance <$ELAMBDA>. The scaling factor
provides a mechanism to weight the combination of stratum and distance.
Ordinarily, the stratum will dominate, unless one or more of the
survivors has an exceptionally high distance. The list is then sorted by
increasing distance.
<$Em~<<-~0>;
for (each peer) begin /* calling all peers */
if (<$Elow~<<=~theta~<<=~high>) begin
<$ELAMBDA~<<-~roman distance (peer)>;
/* make list entry */
<$Edist~<<-~roman
{peer.stratum~times~NTP.MAXDISPERSE~+~LAMBDA }>
add <$E[ dist ,~peer]> to candidate list;
<$Em~<<-~m~+~1>;
endif;
endfor;
sort candidate list by increasing dist;
The next steps are designed to cast out outlyers which exhibit
significant dispersions relative to the other members of the candidate
list while minimizing wander, especially on high-speed LANs with many
time servers. Wander causes needless network overhead, since the poll
interval is clamped at sys.poll as each new peer is selected for
synchronization and only slowly increases when the peer is no longer
selected. It has been the practical experience that the number of
candidates surviving to this point can become quite large and can result
in significant processor cycles without materially enhancing stability
and accuracy. Accordingly, the candidate list is truncated at
NTP.MAXCLOCK entries.
Note <$Eepsilon sub {xi i}> is the select (sample) dispersion relative
to the ith peer represented on the candidate list, which can be
calculated in a manner similar to the filter dispersion described
previously. The <$EEPSILON sub j> is the dispersion of the jth peer
represented on the list and includes components due to measurement
error, skew-error accumulation and filter dispersion. If the maximum
<$Eepsilon sub {xi i}> is greater than the minimum <$EEPSILON sub j> and
the number of survivors is greater than NTP.MINCLOCK, the ith peer is
discarded from the list and the procedure is repeated. If the current
synchronization source is one of the survivors and there is no other
survivor of lower stratum, then the procedure exits without doing
anything further. Otherwise, the synchronization source is set to the
first survivor on the candidate list. In the following i, j, k, l are
peer indices, with k the index of the current synchronization source
(NULL if none) and l the index of the first survivor on the candidate
list.
while begin
for (each survivor <$E[distance,~index]>) begin /*
compute dispersions */
find index i for max <$Eepsilon sub {xi i}>;
find index j for min <$EEPSILON sub j>;
endfor
if (<$Eepsilon sub {xi i}~<<=~EPSILON sub j> or
<$Em~<<=~roman NTP.MINCLOCK>) break;
<$Eroman peer.survivor [i]~<<-~0> ; /*
discard ith peer */
if (<$Ei~=~k>) <$Eroman sys.peer~<<-~roman NULL>;
delete the ith peer from the candidate list;
<$Em~<<-~m~-~1>;
endwhile
if (<$Eroman peer.survivor [k]~=~0> or <$Eroman peer.stratum
[k]~>>~roman peer.stratum [l]>) begin
<$Eroman sys.peer~<<-~l>;
/* new clock source */
call poll-update;
endif
end clock-select procedure;
The algorithm is designed to favor those peers near the head of the
candidate list, which are at the lowest stratum and distance and
presumably can provide the most accurate and stable time. With proper
selection of weight factor v (also called NTP.SELECT), entries will be
trimmed from the tail of the list, unless a few outlyers disagree
significantly with respect to the remaining entries, in which case the
outlyers are discarded first. The termination condition is designed to
avoid needless switching between synchronization sources when not
statistically justified, yet maintain a bias toward the low-stratum,
low-distance peers.
Local Clocks
In order to implement a precise and accurate local clock, the host must
be equipped with a hardware clock consisting of an oscillator and
interface and capable of the required precision and stability. A logical
clock is then constructed using these components plus software
components that adjust the apparent time and frequency in response to
periodic updates computed by NTP or some other time-synchronization
protocol such as Hellospeak [MIL83b] or the Unix 4.3bsd TSP [GUS85a].
This section describes the Fuzzball local-clock model and
implementation, which includes provisions for precise time and frequency
adjustment and can maintain time to within 15 ns and frequency to within
0.3 ms per day. The model is suitable for use with both compensated and
uncompensated quartz oscillators and can be adapted to power-frequency
oscillators. A summary of the characteristics of these and other types
of oscillators can be found in Appendix E, while a comprehensive
mathematical analysis of the NTP local-clock model can be found in
Appendix G.
It is important to note that the particular implementation described is
only one of possibly many implementations that provide equivalent
functionality. However, it is equally important to note that the clock
model described in Appendix G and which is the basis of the
implementation involves a particular kind of control-feedback loop that
is potentially unstable if the design rules are broken. The model and
parameter described in Appendix G are designed to provide accurate and
stable time under typical operating conditions using conventional
hardware and in the face of disruptions in hardware or network
connectivity. The parameters have been engineered for reliable operation
in a multi-level hierarchical subnet where unstable operation at one
level can disrupt possibly many other levels.
Fuzzball Implementation
The Fuzzball local clock consists of a collection of hardware and
software registers, together with a set of algorithms, which implement a
logical clock that functions as a disciplined oscillator and
synchronizes to an external source. Following is a description of its
components and manner of operation. Note that all arithmetic is two's
complement integer and all shifts <169><<<<<170> and <169>>>>><170> are
arithmetic (sign-fill for right shifts and zero-fill for left shifts).
Also note that <$Ex~<< <<~n> is equivalent to <$Ex~>> >>~-~n>.
The principal components of the local clock are shown in Figure
3,<$&fig3> in which the fraction points shown are relative to whole
milliseconds. The 48-bit Clock register and 32-bit Prescaler function as
a disciplined oscillator which increments in milliseconds relative to
midnight at the fraction point. The 32-bit Clock-Adjust register is used
to adjust the oscillator phase in gradual steps to avoid discontinuities
in the indicated timescale. Its contents are designated x in the
following. The 32-bit Skew-Compensation register is used to trim the
oscillator frequency by adding small phase increments at periodic
adjustment intervals and can compensate for frequency errors as much as
.01% or <F128M>æ<F255D>100 ppm. Its contents are designated y in the
following. The 16-bit Watchdog counter and 32-bit Compliance register
are used to determine validity, as well as establish the PLL bandwidth
and poll interval (see Appendix G). The contents of the Compliance
register are designated z in the following. The 32-bit PPS-Adjust
register is used to hold a precision time adjustment when a source of 1-
pps pulses is available, while the 8-bit PPS counter is used to verify
presence of these pulses. The two-bit Flags register contains the two
leap bits described elsewhere (leap).
All registers except the Prescaler register are ordinarily implemented
in memory. In typical clock interface designs such as the DEC KWV11-C,
the Prescaler register is implemented as a 16-bit buffered counter
driven by a quartz-controlled oscillator at some multiple of 1000 Hz. A
counter overflow is signalled by an interrupt, which results in an
increment of the Clock register at the bit corresponding to the
overflow. The time of day is determined by reading the Prescaler
register, which does not disturb the counting process, and adding its
value to that of the Clock register with fraction points aligned as
shown and with unimplemented low-order bits set to zero. In other
interface designs, such as the LSI-11 event-line mechanism, each tick of
the clock is signalled by an interrupt at intervals of 16-2/3 ms or 20
ms, depending on interface and mains frequency. When this occurs the
appropriate increment in fractional milliseconds is added to the Clock
register.
The various parameters used are summarized in Table 6, in which certain
parameters have been rescaled from those given in Appendix G due to the
units here being in milliseconds.<$&tab6> When the system is
initialized, all registers and counters are cleared and the leap bits
set to 112 (unsynchronized). At adjustment intervals of CLOCK.ADJ
seconds CLOCK.ADJ is subtracted from the PPS counter, but only if the
previous contents of the PPS counter are greater than zero. Also,
CLOCK.ADJ is added to the Watchdog counter, but the latter is clamped
not to exceed NTP.MAXAGE divided by CLOCK.ADJ (one full day). In
addition, if the Watchdog counter reaches this value, the leap bits are
set to 112 (unsynchronized).
In some system configurations a precise source of timing information is
available in the form of a train of timing pulses spaced at one-second
intervals. Usually, this is in addition to a source of timecode
information, such as a radio clock or even NTP itself, to number the
seconds, minutes, hours and days. In typical clock interface designs
such as the DEC KWV11-C, a special input is provided which can trigger
an interrupt as each pulse is received. When this happens the PPS
counter is set to CLOCK.PPS and the current time offset is determined in
the usual way. Then, the PPS-Adjust register is set to the time offset
scaled to milliseconds. Finally, if the PPS-Adjust register is greater
than or equal to 500, 1000 is subtracted from its contents. As described
below, the PPS-Adjust register and PPS counters can be used in
conjunction with an ordinary timecode to produce an extremely accurate
local clock.
Gradual Phase Adjustments
Left uncorrected, the local clock runs at the offset and frequency
resulting from its last update. An update is produced by an event that
results in a valid clock selection. It consists of a signed 48-bit
integer in whole milliseconds and fraction, with fraction point to the
left of bit 32. If the magnitude is greater than the maximum aperture
CLOCK.MAX, a step adjustment is required, in which case proceed as
described later. Otherwise, a gradual phase adjustment is performed.
Normally, the update is computed by the NTP algorithms described
previously; however, if the PPS counter is greater than zero, the value
of the PPS-Adjust register is used instead. Let u be a 32-bit quantity
with bits 0-31 set as bits 16-47 of the update. If some of the low-order
bits of the update are unimplemented, they are set as the value of the
sign bit. These operations move the fraction point of u to the left of
bit 16 and minimize the effects of truncation and roundoff errors. Let b
be the number of leading zeros of the absolute value of the Compliance
register and let c be the number of leading zeros of the Watchdog
counter, both of which are easily computed by compact loops. Then, set b
to
<$Eb~=~b~-~16~+~roman CLOCK.COMP>
and clamp it to be not less than zero. This represents the logarithm of
the loop time constant. Then, set c to
<$Ec~=~10~-~c>
and clamp it to be not greater than NTP.MAXPOLL <196> NTP.MINPOLL. This
represents the logarithm of the integration interval since the last
update. The clamps insure stable operation under typical conditions
encountered in the Internet. Then, compute new values for the Clock-
Adjust and Skew-Compensation registers
<$Ex~=~u~>> >>~b> ,
<$Ey~=~y~+~(u~>> >>~(b~+~b~-~c))> .
Finally, compute the exponential average
<$Ez~=~z~+~(u~<< <<~(b~+~ roman CLOCK.MULT)~-~z)~>> >>~ roman
CLOCK.WEIGHT> ,
where the left shift realigns the fraction point for greater precision
and ease of computation.
At each adjustment interval the final clock correction consisting of two
components is determined. The first (phase) component consists of the
quantity
<$Ex~>> >>~ roman CLOCK.PHASE> ,
which is then subtracted from the previous contents of the Clock-Adjust
register to form the new contents of that register. The second
(frequency) component consists of the quantity
<$Ey~>> >>~ roman CLOCK.FREQ> .
The sum of the phase and frequency components is the final clock
correction, which is then added to the Clock register. FInally, the
Watchdog counter is set to zero. Operation continues in this way until a
new correction is introduced.
The value of b computed above can be used to update the poll interval
system variable (sys.poll). This functions as an adaptive parameter that
provides a very valuable feature which reduces the polling overhead,
especially if the clock-combining algorithm described in Appendix F is
used:
<$Eroman sys.poll~<<-~b~+~roman NTP.MINPOLL> .
Under conditions when update noise is high or the hardware oscillator
frequency is changing relatively rapidly due to environmental
conditions, the magnitude of the compliance increases. With the
parameters specified, this causes the loop bandwidth (reciprocal of time
constant) to increase and the poll interval to decrease, eventually to
NTP.MINPOLL seconds. When noise is low and the hardware oscillator very
stable, the compliance decreases, which causes the loop bandwidth to
decrease and the poll interval to increase, eventually to NTP.MAXPOLL
seconds.
The parameters in Table 6 have been selected so that, under good
conditions with updates in the order of a few milliseconds, a precision
of a millisecond per day (about .01 ppm or 10-8), can be achieved. Care
is required in the implementation to insure monotonicity of the Clock
register and to preserve the highest precision while minimizing the
propagation of roundoff errors. Since all of the multiply/divide
operations (except those involved with the 1-pps pulses) computed in
real time can be approximated by bitwise-shift operations, it is not
necessary to implement a full multiply/divide capability in hardware or
software.
In the various implementations of NTP for many Unix-based systems it has
been the common experience that the single most important factor
affecting local-clock stability is the matching of the phase and
frequency coefficients to the particular kernel implementation. It is
vital that these coefficients be engineered according to the model
values, for otherwise the PLL can fail to track normal oscillator
variations and can even become unstable.
Step Phase Adjustments
When the magnitude of a correction exceeds the maximum aperture
CLOCK.MAX, the possibility exists that the clock is so far out of
synchronization with the reference source that the best action is an
immediate and wholesale replacement of Clock register contents, rather
than in gradual adjustments as described above. However, in cases where
the sample variance is extremely high, it is prudent to disbelieve a
step change, unless a significant interval has elapsed since the last
gradual adjustment. Therefore, if a step change is indicated and the
Watchdog counter is less than the preconfigured value CLOCK.MINSTEP, the
update is ignored and the local-clock procedure exits. These safeguards
are especially useful in those system configurations using a calibrated
atomic clock or LORAN-C receiver in conjunction with a separate source
of seconds-numbering information, such as a radio clock or NTP peer.
If a step change is indicated the update is added directly to the Clock
register and the Clock-Adjust register and Watchdog counter both set to
zero, but the other registers are left undisturbed. Since a step change
invalidates data currently in the clock filters, the leap bits are set
to 112 (unsynchronized) and, as described elsewhere, the clear procedure
is called to purge the clock filters and state variables for all peers.
In practice, the necessity to perform a step change is rare and usually
occurs when the local host or reference source is rebooted, for example.
This is fortunate, since step changes can result in the local clock
apparently running backward, as well as incorrect delay and offset
measurements of the synchronization mechanism itself.
Considerable experience with the Internet environment suggests the
values of CLOCK.MAX tabulated in Table 6 as appropriate. In practice,
these values are exceeded with a single time-server source only under
conditions of the most extreme congestion or when multiple failures of
nodes or links have occurred. The most common case when the maximum is
exceeded is when the time-server source is changed and the time
indicated by the new and old sources exceeds the maximum due to
systematic errors in the primary reference source or large differences
in path delays. It is recommended that implementations include
provisions to tailor CLOCK.MAX for specific situations. The amount that
CLOCK.MAX can be increased without violating the monotonicity
requirement depends on the Clock register increment. For an increment of
10 ms, as used in many workstations, the value shown in Table 6 can be
increased by a factor of five.
Implementation Issues
The basic NTP robustness model is that a host has no other means to
verify time other than NTP itself. In some equipment a battery-backed
clock/calendar is available for a sanity check. If such a device is
available, it should be used only to confirm sanity of the timekeeping
system, not as the source of system time. In the common assumption (not
always justified) that the clock/calendar is more reliable, but less
accurate, than the NTP synchronization subnet, the recommended approach
at initialization is to set the Clock register as determined from the
clock/calendar and the other registers, counters and flags as described
above. On subsequent updates if the time offset is greater than a
configuration parameter (e.g., 1000 seconds), then the update should be
discarded and an error condition reported. Some implementations
periodically record the contents of the Skew-Compensation register in
stable storage such as a system file or NVRAM and retrieve this value at
initialization. This can significantly reduce the time to converge to
the nominal stability and accuracy regime.
Conversion from NTP format to the common date and time formats used by
application programs is simplified if the internal local-clock format
uses separate date and time variables. The time variable is designed to
roll over at 24 hours, give or take a leap second as determined by the
leap-indicator bits, with its overflows (underflows) incrementing
(decrementing) the date variable. The date and time variables then
indicate the number of days and seconds since some previous reference
time, but uncorrected for intervening leap seconds.
On the day prior to the insertion of a leap second the leap bits
(sys.leap) are set at the primary servers, presumably by manual means.
Subsequently, these bits show up at the local host and are passed to the
local-clock procedure. This causes the modulus of the time variable,
which is the length of the current day, to be increased or decreased by
one second as appropriate. Immediately following insertion the leap bits
are reset. Additional discussion on this issue can be found in Appendix
E.
Lack of a comprehensive mechanism to administer the leap bits in the
primary servers is presently an awkward problem better suited to a
comprehensive network-management mechanism yet to be developed. As a
practical matter and unless specific provisions have been made
otherwise, currently manufactured radio clocks have no provisions for
leap seconds, either automatic or manual. Thus, when a leap actually
occurs, the radio must resynchronize to the broadcast timecode, which
may take from a few minutes to some hours. Unless special provisions are
made, a primary server might leap to the new timescale, only to be
yanked back to the previous timescale when it next synchronizes to the
radio. Subsequently, the server will be yanked forward again when the
radio itself resynchronizes to the broadcast timecode.
This problem can not be reliably avoided using any selection algorithm,
since there will always exist an interval of at least a couple of
minutes and possibly as much as some hours when some or all radios will
be out of synchronization with the broadcast timecode and only after the
majority of them have resynchronized will the subnet settle down. The
CLOCK.MINSTEP delay is designed to cope with this problem by forcing a
minimum interval since the last gradual adjustment was made before
allowing a step change to occur. Therefore, until the radio
resynchronizes, it will continue on the old timescale, which is one
second off the local clock after the leap and outside the maximum
aperture CLOCK.MAX permitted for gradual phase adjustments. When the
radio eventually resynchronizes, it will almost certainly come up within
the aperture and again become the reference source. Thus, even in the
unlikely case when the local clock incorrectly leaps, the server will go
no longer than CLOCK.MINSTEP seconds before resynchronizing.
Acknowledgments
Many people contributed to the contents of this document, which was
thoroughly debated by electronic mail and debugged using two different
prototype implementations for the Unix 4.3bsd operating system, one
written by Louis Mamakos and Michael Petry of the University of Maryland
and the other by Dennis Ferguson of the University of Toronto. Another
implementation for the Fuzzball operating system [MIL88b] was written by
the author. Many individuals to numerous to mention meticulously tested
the several beta-test prototype versions and ruthlessly smoked out the
bugs, both in the code and the specification. Especially useful were
comments from Dennis Ferguson and Bill Sommerfeld, as well as
discussions with Joe Comuzzi and others at Digital Equipment
Corporation.
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Appendix A. NTP Data Format - Version 3
The format of the NTP Message data area, which immediately follows the
UDP header, is shown in Figure 4<$&fig4>. Following is a description of
its fields.
Leap Indicator (LI): This is a two-bit code warning of an impending leap
second to be inserted/deleted in the last minute of the current day,
with bit 0 and bit 1, respectively, coded as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
00, no warning
01, last minute has 61 seconds
10, last minute has 59 seconds)
11, alarm condition (clock not synchronized)
@Z_TBL_END =
Version Number (VN): This is a three-bit integer indicating the NTP
version number, currently three (3).
Mode: This is a three-bit integer indicating the mode, with values
defined as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, reserved
1, symmetric active
2, symmetric passive
3, client
4, server
5, broadcast
6, reserved for NTP control message (see Appendix B)
7, reserved for private use
@Z_TBL_END =
Stratum: This is a eight-bit integer indicating the stratum level of the
local clock, with values defined as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, unspecified
1, primary reference (e.g.,, radio clock)
2-255, secondary reference (via NTP)
@Z_TBL_END =
The values that can appear in this field range from zero to NTP.INFIN
inclusive.
Poll Interval: This is an eight-bit signed integer indicating the
maximum interval between successive messages, in seconds to the nearest
power of two. The values that can appear in this field range from
NTP.MINPOLL to NTP.MAXPOLL inclusive.
Precision: This is an eight-bit signed integer indicating the precision
of the local clock, in seconds to the nearest power of two.
Root Delay: This is a 32-bit signed fixed-point number indicating the
total roundtrip delay to the primary reference source, in seconds with
fraction point between bits 15 and 16. Note that this variable can take
on both positive and negative values, depending on clock precision and
skew.
Root Dispersion: This is a 32-bit signed fixed-point number indicating
the maximum error relative to the primary reference source, in seconds
with fraction point between bits 15 and 16. Only positive values greater
than zero are possible.
Reference Clock Identifier: This is a 32-bit code identifying the
particular reference clock. In the case of stratum 0 (unspecified) or
stratum 1 (primary reference), this is a four-octet, left-justified,
zero-padded ASCII string. While not enumerated as part of the NTP
specification, the following are suggested ASCII identifiers:
@Z_TBL_BEG = COLUMNS(3), DIMENSION(IN), COLWIDTHS(E2,E2,E5),
WIDTH(4.6700), ABOVE(.1670), BELOW(.0830), HGUTTER(.3330),
BOX(Z_SINGLE), KEEP(ON), ALIGN(CT), L1(R1C0..R1C3)
@Z_TBL_BODY = TABLE HEADER, TABLE HEADER, TABLE HEADER
Stratum, Code, Meaning
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT, TABLE TEXT
0, DCN, DCN routing protocol
0, NIST, NIST public modem
0, TSP, TSP time protocol
0, DTS, Digital Time Service
1, ATOM, Atomic clock (calibrated)
1, VLF, VLF radio (OMEGA,, etc.)
1, callsign, Generic radio
1, LORC, LORAN-C radionavigation
1, GOES, GOES UHF environment satellite
@Z_TBL_BODY = TABLE HEADER, TABLE HEADER, TABLE HEADER
1, GPS, GPS UHF satellite positioning
@Z_TBL_END =
In the case of stratum 2 and greater (secondary reference) this is the
four-octet Internet address of the primary reference host.
Reference Timestamp: This is the local time at which the local clock was
last set or corrected, in 64-bit timestamp format.
Originate Timestamp: This is the local time at which the request
departed the client host for the service host, in 64-bit timestamp
format.
Receive Timestamp: This is the local time at which the request arrived
at the service host, in 64-bit timestamp format.
Transmit Timestamp: This is the local time at which the reply departed
the service host for the client host, in 64-bit timestamp format.
Authenticator (optional): When the NTP authentication mechanism is
implemented, this contains the authenticator information defined in
Appendix C.
Appendix B. NTP Control Messages
In a comprehensive network-management environment, facilities are
presumed available to perform routine NTP control and monitoring
functions, such as setting the leap-indicator bits at the primary
servers, adjusting the various system parameters and monitoring regular
operations. Ordinarily, these functions can be implemented using a
network-management protocol such as SNMP and suitable extensions to the
MIB database. However, in those cases where such facilities are not
available, these functions can be implemented using special NTP control
messages described herein. These messages are intended for use only in
systems where no other management facilities are available or
appropriate, such as in dedicated-function bus peripherals. Support for
these messages is not required in order to conform to this
specification.
The NTP Control Message has the value 6 specified in the mode field of
the first octet of the NTP header and is formatted as shown below. The
format of the data field is specific to each command or response;
however, in most cases the format is designed to be constructed and
viewed by humans and so is coded in free-form ASCII. This facilitates
the specification and implementation of simple management tools in the
absence of fully evolved network-management facilities. As in ordinary
NTP messages, the authenticator field follows the data field. If the
authenticator is used the data field is zero-padded to a 32-bit
boundary, but the padding bits are not considered part of the data field
and are not included in the field count.
IP hosts are not required to reassemble datagrams larger than 576
octets; however, some commands or responses may involve more data than
will fit into a single datagram. Accordingly, a simple reassembly
feature is included in which each octet of the message data is numbered
starting with zero. As each fragment is transmitted the number of its
first octet is inserted in the offset field and the number of octets is
inserted in the count field. The more-data (M) bit is set in all
fragments except the last.
Most control functions involve sending a command and receiving a
response, perhaps involving several fragments. The sender chooses a
distinct, nonzero sequence number and sets the status field and R and E
bits to zero. The responder interprets the opcode and additional
information in the data field, updates the status field, sets the R bit
to one and returns the three 32-bit words of the header along with
additional information in the data field. In case of invalid message
format or contents the responder inserts a code in the status field,
sets the R and E bits to one and, optionally, inserts a diagnostic
message in the data field.
Some commands read or write system variables and peer variables for an
association identified in the command. Others read or write variables
associated with a radio clock or other device directly connected to a
source of primary synchronization information. To identify which type of
variable and association a 16-bit association identifier is used. System
variables are indicated by the identifier zero. As each association is
mobilized a unique, nonzero identifier is created for it. These
identifiers are used in a cyclic fashion, so that the chance of using an
old identifier which matches a newly created association is remote. A
management entity can request a list of current identifiers and
subsequently use them to read and write variables for each association.
An attempt to use an expired identifier results in an exception
response, following which the list can be requested again.
Some exception events, such as when a peer becomes reachable or
unreachable, occur spontaneously and are not necessarily associated with
a command. An implementation may elect to save the event information for
later retrieval or to send an asynchronous response (called a trap) or
both. In case of a trap the IP address and port number is determined by
a previous command and the sequence field is set as described below.
Current status and summary information for the latest exception event is
returned in all normal responses. Bits in the status field indicate
whether an exception has occurred since the last response and whether
more than one exception has occurred.
Commands need not necessarily be sent by an NTP peer, so ordinary
access-control procedures may not apply; however, the optional
mask/match mechanism suggested elsewhere in this document provides the
capability to control access by mode number, so this could be used to
limit access for control messages (mode 6) to selected address ranges.
NTP Control Message Format
The format of the NTP Control Message header, which immediately follows
the UDP header, is shown in Figure 5<$&fig5>. Following is a description
of its fields. Bit positions marked as zero are reserved and should
always be transmitted as zero.
Version Number (VN): This is a three-bit integer indicating the NTP
version number, currently three (3).
Mode: This is a three-bit integer indicating the mode. It must have the
value 6, indicating an NTP control message.
Response Bit (R): Set to zero for commands, one for responses.
Error Bit (E): Set to zero for normal response, one for error response.
More Bit (M): Set to zero for last fragment, one for all others.
Operation Code (Op): This is a five-bit integer specifying the command
function. Values currently defined include the following:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, reserved
1, read status command/response
2, read variables command/response
3, write variables command/response
4, read clock variables command/response
5, write clock variables command/response
6, set trap address/port command/response
7, trap response
8-31, reserved
@Z_TBL_END =
Sequence: This is a 16-bit integer indicating the sequence number of the
command or response.
Status: This is a 16-bit code indicating the current status of the
system, peer or clock, with values coded as described in following
sections.
Association ID: This is a 16-bit integer identifying a valid
association.
Offset: This is a 16-bit integer indicating the offset, in octets, of
the first octet in the data area.
Count: This is a 16-bit integer indicating the length of the data field,
in octets.
Data: This contains the message data for the command or response. The
maximum number of data octets is 468.
Authenticator (optional): When the NTP authentication mechanism is
implemented, this contains the authenticator information defined in
Appendix C.
Status Words
Status words indicate the present status of the system, associations and
clock. They are designed to be interpreted by network-monitoring
programs and are in one of four 16-bit formats shown in Figure 6<$&fig6>
and described in this section. System and peer status words are
associated with responses for all commands except the read clock
variables, write clock variables and set trap address/port commands. The
association identifier zero specifies the system status word, while a
nonzero identifier specifies a particular peer association. The status
word returned in response to read clock variables and write clock
variables commands indicates the state of the clock hardware and
decoding software. A special error status word is used to report
malformed command fields or invalid values.
System Status Word
The system status word appears in the status field of the response to a
read status or read variables command with a zero association
identifier. The format of the system status word is as follows:
Leap Indicator (LI): This is a two-bit code warning of an impending leap
second to be inserted/deleted in the last minute of the current day,
with bit 0 and bit 1, respectively, coded as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
00, no warning
01, last minute has 61 seconds
10, last minute has 59 seconds)
11, alarm condition (clock not synchronized)
@Z_TBL_END =
Clock Source: This is a six-bit integer indicating the current
synchronization source, with values coded as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, unspecified or unknown
1, Calibrated atomic clock (e.g.,, HP 5061)
2, VLF (band 4) or LF (band 5) radio (e.g.,, OMEGA,, WWVB)
3, HF (band 7) radio (e.g.,, CHU,, MSF,, WWV/H)
4, UHF (band 9) satellite (e.g.,, GOES,, GPS)
5, local net (e.g.,, DCN,, TSP,, DTS)
6, UDP/NTP
7, UDP/TIME
8, eyeball-and-wristwatch
9, telephone modem (e.g.,, NIST)
10-63, reserved
@Z_TBL_END =
System Event Counter: This is a four-bit integer indicating the number
of system exception events occurring since the last time the system
status word was returned in a response or included in a trap message.
The counter is cleared when returned in the status field of a response
and freezes when it reaches the value 15.
System Event Code: This is a four-bit integer identifying the latest
system exception event, with new values overwriting previous values, and
coded as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, unspecified
1, system restart
2, system or hardware fault
3, system new status word (leap bits or synchronization change)
4, system new synchronization source or stratum (sys.peer or sys.stratum
change)
5, system clock reset (offset correction exceeds CLOCK.MAX)
6, system invalid time or date (see NTP specification)
7, system clock exception (see system clock status word)
8-15, reserved
@Z_TBL_END =
Peer Status Word
A peer status word is returned in the status field of a response to a
read status, read variables or write variables command and appears also
in the list of association identifiers and status words returned by a
read status command with a zero association identifier. The format of a
peer status word is as follows:
Peer Status: This is a five-bit code indicating the status of the peer
determined by the packet procedure, with bits assigned as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, configured (peer.config)
1, authentication enabled (peer.authenable)
2, authentication okay (peer.authentic)
3, reachability okay (peer.reach <F128M>Ö<F255D> 0)
4, reserved
@Z_TBL_END =
Peer Selection (Sel): This is a three-bit integer indicating the status
of the peer determined by the clock-selection procedure, with values
coded as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, rejected
1, passed sanity checks (tests 1 through 8 in Section 3.4.3)
2, passed correctness checks (intersection algorithm in Section 4.2.1)
3, passed candidate checks (if limit check implemented)
4, passed outlyer checks (clustering algorithm in Section 4.2.2)
5, current synchronization source; max distance exceeded (if limit check
implemented)
6, current synchronization source; max distance okay
7, reserved
@Z_TBL_END =
Peer Event Counter: This is a four-bit integer indicating the number of
peer exception events that occurred since the last time the peer status
word was returned in a response or included in a trap message. The
counter is cleared when returned in the status field of a response and
freezes when it reaches the value 15.
Peer Event Code: This is a four-bit integer identifying the latest peer
exception event, with new values overwriting previous values, and coded
as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, unspecified
1, peer IP error
2, peer authentication failure (peer.authentic bit was one now zero)
3, peer unreachable (peer.reach was nonzero now zero)
4, peer reachable (peer.reach was zero now nonzero)
5, peer clock exception (see peer clock status word)
6-15, reserved
@Z_TBL_END =
Clock Status Word
There are two ways a reference clock can be attached to a NTP service
host, as an dedicated device managed by the operating system and as a
synthetic peer managed by NTP. As in the read status command, the
association identifier is used to identify which one, zero for the
system clock and nonzero for a peer clock. Only one system clock is
supported by the protocol, although many peer clocks can be supported. A
system or peer clock status word appears in the status field of the
response to a read clock variables or write clock variables command.
This word can be considered an extension of the system status word or
the peer status word as appropriate. The format of the clock status word
is as follows:
Clock Status: This is an eight-bit integer indicating the current clock
status, with values coded as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, clock operating within nominals
1, reply timeout
2, bad reply format
3, hardware or software fault
4, propagation failure
5, bad date format or value
6, bad time format or value
7-255, reserved
@Z_TBL_END =
Clock Event Code: This is an eight-bit integer identifying the latest
clock exception event, with new values overwriting previous values. When
a change to any nonzero value occurs in the radio status field, the
radio status field is copied to the clock event code field and a system
or peer clock exception event is declared as appropriate.
Error Status Word
An error status word is returned in the status field of an error
response as the result of invalid message format or contents. Its
presence is indicated when the E (error) bit is set along with the
response (R) bit in the response. It consists of an eight-bit integer
coded as follows:
@Z_TBL_BEG = COLUMNS(2), DIMENSION(IN), COLWIDTHS(E1,E8), WIDTH(5.0000),
ABOVE(.0830), BELOW(.0830), HGUTTER(.0560), KEEP(OFF), ALIGN(CT)
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT
0, unspecified
1, authentication failure
2, invalid message length or format
3, invalid opcode
4, unknown association identifier
5, unknown variable name
6, invalid variable value
7, administratively prohibited
8-255, reserved
@Z_TBL_END =
Commands
Commands consist of the header and optional data field shown in Figure
6. When present, the data field contains a list of identifiers or
assignments in the form
<<identifier>>[=<<value>>],<<identifier>>[=<<value>>],...
where <<identifier>> is the ASCII name of a system or peer variable
specified in Table 2 or Table 3 and <<value>> is expressed as a decimal,
hexadecimal or string constant in the syntax of the C programming
language. Where no ambiguity exists, the <169>sys.<170> or
<169>peer.<170> prefixes shown in Table 2 or Table 4 can be suppressed.
Whitespace (ASCII nonprinting format effectors) can be added to improve
readability for simple monitoring programs that do not reformat the data
field. Internet addresses are represented as four octets in the form
[n.n.n.n], where n is in decimal notation and the brackets are optional.
Timestamps, including reference, originate, receive and transmit values,
as well as the logical clock, are represented in units of seconds and
fractions, preferably in hexadecimal notation, while delay, offset,
dispersion and distance values are represented in units of milliseconds
and fractions, preferably in decimal notation. All other values are
represented as-is, preferably in decimal notation.
Implementations may define variables other than those listed in Table 2
or Table 3. Called extramural variables, these are distinguished by the
inclusion of some character type other than alphanumeric or <169>.<170>
in the name. For those commands that return a list of assignments in the
response data field, if the command data field is empty, it is expected
that all available variables defined in Table 3 or Table 4 of the NTP
specification will be included in the response. For the read commands,
if the command data field is nonempty, an implementation may choose to
process this field to individually select which variables are to be
returned.
Commands are interpreted as follows:
Read Status (1): The command data field is empty or contains a list of
identifiers separated by commas. The command operates in two ways
depending on the value of the association identifier. If this identifier
is nonzero, the response includes the peer identifier and status word.
Optionally, the response data field may contain other information, such
as described in the Read Variables command. If the association
identifier is zero, the response includes the system identifier (0) and
status word, while the data field contains a list of binary-coded pairs
<<association identifier>> <<status word>>,
one for each currently defined association.
Read Variables (2): The command data field is empty or contains a list
of identifiers separated by commas. If the association identifier is
nonzero, the response includes the requested peer identifier and status
word, while the data field contains a list of peer variables and values
as described above. If the association identifier is zero, the data
field contains a list of system variables and values. If a peer has been
selected as the synchronization source, the response includes the peer
identifier and status word; otherwise, the response includes the system
identifier (0) and status word.
Write Variables (3): The command data field contains a list of
assignments as described above. The variables are updated as indicated.
The response is as described for the Read Variables command.
Read Clock Variables (4): The command data field is empty or contains a
list of identifiers separated by commas. The association identifier
selects the system clock variables or peer clock variables in the same
way as in the Read Variables command. The response includes the
requested clock identifier and status word and the data field contains a
list of clock variables and values, including the last timecode message
received from the clock.
Write Clock Variables (5): The command data field contains a list of
assignments as described above. The clock variables are updated as
indicated. The response is as described for the Read Clock Variables
command.
Set Trap Address/Port (6): The command association identifier, status
and data fields are ignored. The address and port number for subsequent
trap messages are taken from the source address and port of the control
message itself. The initial trap counter for trap response messages is
taken from the sequence field of the command. The response association
identifier, status and data fields are not significant. Implementations
should include sanity timeouts which prevent trap transmissions if the
monitoring program does not renew this information after a lengthy
interval.
Trap Response (7): This message is sent when a system, peer or clock
exception event occurs. The opcode field is 7 and the R bit is set. The
trap counter is incremented by one for each trap sent and the sequence
field set to that value. The trap message is sent using the IP address
and port fields established by the set trap address/port command. If a
system trap the association identifier field is set to zero and the
status field contains the system status word. If a peer trap the
association identifier field is set to that peer and the status field
contains the peer status word. Optional ASCII-coded information can be
included in the data field.
Appendix C. Authentication Issues
NTP robustness requirements are similar to those of other multiple-peer
distributed protocols used for network routing, management and file
access. These include protection from faulty implementations, improper
operation and possibly malicious replay attacks with or without data
modification. These requirements are especially stringent with
distributed protocols, since damage due to failures can propagate
quickly throughout the network, devastating archives, routes and
monitoring systems and even bring down major portions of the network in
the fashion of the classic Internet Worm.
The access-control mechanism suggested in the NTP specification responds
to these requirements by limiting access to trusted peers. The various
sanity checks resist most replay and spoofing attacks by discarding old
duplicates and using the originate timestamp as a one-time pad, since it
is unlikely that even a synchronized peer can predict future timestamps
with the precision required on the basis of past observations alone. In
addition, the protocol environment resists jamming attacks by employing
redundant time servers and diverse network paths. Resistance to
stochastic disruptions, actual or manufactured, are minimized by careful
design of the filtering and selection algorithms.
However, it is possible that a determined intruder can disrupt
timekeeping operations between peers by subtle modifications of NTP
message data, such as falsifying header fields or certain timestamps. In
cases where protection from even these types of attacks is required, a
specifically engineered message-authentication mechanism based on
cryptographic techniques is necessary. Typical mechanisms involve the
use of cryptographic certificates, algorithms and key media, together
with secure media databases and key-management protocols. Ongoing
research efforts in this area are directed toward developing a standard
methodology that can be used with many protocols, including NTP.
However, while it may eventually be the case that ubiquitous, widely
applicable authentication methodology may be adopted by the Internet
community and effectively overtake the mechanism described here, it does
not appear that specific standards and implementations will happen
within the lifetime of this particular version of NTP.
The NTP authentication mechanism described here is intended for interim
use until specific standards and implementations operating at the
network level or transport level are available. Support for this
mechanism is not required in order to conform to the NTP specification
itself. The mechanism, which operates at the application level, is
designed to protect against unauthorized message-stream modification and
misrepresentation of source by insuring that unbroken, authenticated
paths exist between a trusted, stratum-one server in a particular
synchronization subnet and all other servers in that subnet. It employs
a crypto-checksum, computed by the sender and checked by the receiver,
together with a set of predistributed algorithms, certificates and
cryptographic keys indexed by a key identifier included in the message.
However, there are no provisions in NTP itself to distribute or maintain
the certificates, algorithms or keys. These quantities may occasionally
be changed, which may result in inconsistent key information while
rekeying is in progress. The nature of NTP itself is quite tolerant to
such disruptions, so no particular provisions are included to deal with
them.
The intent of the authentication mechanism is to provide a framework
that can be used in conjunction with selected mode combinations to build
specific plans to manage clockworking communities and implement policy
as necessary. It can be selectively enabled or disabled on a per-peer
basis. There is no specific plan proposed to manage the use of such
schemes; although several possibilities are immediately obvious. In one
scenario a group of time servers peers among themselves using symmetric
modes and shares one secret key, say key 1, while another group of
servers peers among themselves using symmetric modes and shares another
secret key, say key 2. Now, assume by policy it is decided that selected
servers in group 1 can provide synchronization to group 2, but not the
other way around. The selected servers in group 1 are given key 2, but
operated only in server mode, so cannot accept synchronization from
group 2; however, group 2 has authenticated access to group-1 servers.
Many other scenarios are possible with suitable combinations of modes
and keys.
A packet format and crypto-checksum procedure appropriate for NTP is
specified in the following sections. The cryptographic information is
carried in an authenticator which follows the (unmodified) NTP header
fields. The crypto-checksum procedure uses the Data Encryption Standard
(DES) [NBS77]; however, only the DES encryption algorithm is used and
the decryption algorithm is not necessary. This feature is specifically
targeted toward governmental sensitivities on the export of
cryptographic technology, since the DES decryption algorithm need not be
included in NTP software distributions and thus cannot be extracted and
used in other applications to avoid message data disclosure.
NTP Authentication Mechanism
When it is created and possibly at other times, each association is
allocated variables identifying the certificate authority, encryption
algorithm, cryptographic key and possibly other data. The specific
procedures to allocate and initialize these variables are beyond the
scope of this specification, as are the association of the identifiers
and keys and the management and distribution of the keys themselves. For
example and consistency with the conventions of the NTP specification, a
set of appropriate peer and packet variables might include the
following:
Authentication Enabled Bit (peer.authenable): This is a bit indicating
that the association is to operate in the authenticated mode. For
configured peers this bit is determined from the startup environment.
For non-configured peers, this bit is set to one if an arriving message
includes the authenticator and set to zero otherwise.
Authenticated Bit (peer.authentic): This is a bit indicating that the
last message received from the peer has been correctly authenticated.
Key Identifier (peer.hostkeyid, peer.peerkeyid, pkt.keyid): This is an
integer identifying the cryptographic key used to generate the message-
authentication code. The system variable peer.hostkeyid is used for
active associations. The peer.peerkeyid variable is initialized at zero
(unspecified) when the association is mobilized. For purposes of
authentication an unassigned value is interpreted as zero (unspecified).
Cryptographic Keys (sys.key): This is a set of 64-bit DES keys. Each key
is constructed as in the Berkeley Unix distributions, which consists of
eight octets, where the seven low-order bits of each octet correspond to
the DES bits 1-7 and the high-order bit corresponds to the DES odd-
parity bit 8. By convention, the unspecified key 0 (zero), consisting of
eight odd-parity zero octets, is used for testing and presumed known
throughout the NTP community. The remaining keys are distributed using
methods outside the scope of NTP.
Crypto-Checksum (pkt.check): This is a crypto-checksum computed by the
encryption procedure.
The authenticator field consists of two subfields, one consisting of the
pkt.keyid variable and the other the pkt.check variable computed by the
encrypt procedure, which is called by the transmit procedure described
in the NTP specification, and by the decrypt procedure, which is called
by the receive procedure described in the NTP specification. Its
presence is revealed by the fact the total datagram length according to
the UDP header is longer than the NTP message length, which includes the
header plus the data field, if present. For authentication purposes, the
NTP message is zero-padded if necessary to a 64-bit boundary, although
the padding bits are not considered part of the NTP message itself. The
authenticator format shown in Figure 7<$&fig7> has 96 bits, including a
32-bit key identifier and 64-bit crypto-checksum, and is aligned on a
32-bit boundary for efficient computation. Additional information
required in some implementations, such as certificate authority and
encryption algorithm, can be inserted between the (padded) NTP message
and the key identifier, as long as the alignment conditions are met.
Like the authenticator itself, this information is not included in the
crypto-checksum. Use of these data are beyond the scope of this
specification. These conventions may be changed in future as the result
of other standardization activities.
NTP Authentication Procedures
When authentication is implemented there are two additional procedures
added to those described in the NTP specification. One of these
(encrypt) constructs the crypto-checksum in transmitted messages, while
the other (decrypt) checks this quantity in received messages. The
procedures use a variant of the cipher-block chaining method described
in [NBS80] as applied to DES. In principal, the procedure is independent
of DES and requires only that the encryption algorithm operate on 64-bit
blocks. While the NTP authentication mechanism specifies the use of DES,
other algorithms could be used by prior arrangement.
Encrypt Procedure
For ordinary NTP messages the encryption procedure operates as follows.
If authentication is not enabled, the procedure simply exits. If the
association is active (modes 1, 3, 5), the key is determined from the
system key identifier. If the association is passive (modes 2, 4) the
key is determined from the peer key identifier, if the authentic bit is
set, or as the default key (zero) otherwise. These conventions allow
further protection against replay attacks and keying errors, as well as
facilitate testing and migration to new versions. The crypto-checksum is
calculated using the 64-bit NTP header and data words, but not the
authenticator or padding bits.
begin encrypt procedure
if (<$Eroman peer.authenable~=~0>) exit; /* do
nothing if not enabled */
if (<$Eroman {peer.hostmode~=~1~bold or~peer.hostmode~=~3~bold
or~peer.hostmode ~=~5}>)
<$Ekeyid~<<-~roman peer.hostkeyid>; /*
active modes use system key */
else
if (<$Eroman peer.authentic~=~1>) /*
passive modes use peer key */
<$Ekeyid~<<-~roman peer.peerkeyid>;
else
<$Ekeyid~<<-~0>; /*
unauthenticated use key 0 */
<$Etemp~<<-~0>; /* calculate
crypto-checksum */
for (each 64-bit header and data word) begin
<$Etemp~<<-~temp~roman bold xor~word>;
<$Etemp~<<-~roman DES (temp,~keyid)>;
endfor;
<$Eroman pkt.keyid~<<-~keyid>; /*
insert packet variables */
<$Eroman pkt.check~<<-~temp>;
end encrypt procedure;
Decrypt Procedure
For ordinary messages the decryption procedure operates as follows. If
the peer is not configured, the data portion of the message is inspected
to determine if the authenticator fields are present. If so,
authentication is enabled; otherwise, it is disabled. If authentication
is enabled and the authenticator fields are present and the crypto-
checksum succeeds, the authentication bit is set to one; otherwise, it
is set to zero.
begin decrypt procedure
<$Eroman peer.authentic~<<-~0>;
if (<$Eroman peer.config~=~0>) /* if
not configured, enable per packet */
if (authenticator present)
<$Eroman peer.authenable~<<-~1>;
else
<$Eroman peer.authenable~<<-~0>;
if (<$Eroman peer.authenable~=~0> or authenticator not present))
exit;
<$Eroman {peer.peerkeyid~<<-~pkt.keyid}>; /* use
peer key */
<$Etemp~<<-~0>; /* calculate
crypto-checksum */
for (each 64-bit header and data word) begin
<$Etemp~<<-~temp~roman bold xor~word>;
<$Etemp~<<-~roman DES (temp,~roman peer.peerkeyid)>;
endfor;
if (temp == pkt.check) <$Eroman peer.authentic~<<-~1>; /*
declare result */
end decrypt procedure;
Control-Message Procedures
In anticipation that the functions provided by the NTP control messages
will eventually be subsumed by a comprehensive network-managment
function, the peer variables are not used for control message
authentication. If an NTP command message is received with an
authenticator field, the crypto-checksum is computed as in the decrypt
procedure and the response message includes the authenticator field as
computed by the encrypt procedure. If the received authenticator is
correct, the key for the response is the same as in the command;
otherwise, the default key (zero) is used. Commands causing a change to
the peer data base, such as the write variables and set trap
address/port commands, must be correctly authenticated; however, the
remaining commands are normally not authenticated in order to minimize
the encryption overhead.
Appendix D. Differences from Previous Versions.
The original NTP, later called NTP Version 0, was described in RFC-958
[MIL85c]. Subsequently, Version 0 was superseded by Version 1 (RFC-1059
[MIL88a]), and Version 2 (RFC-1119 [MIL89]. The Version-2 description
was split into two documents, RFC-1119 defining the architecture and
specifying the protocol and algorithms, and another [MIL90b] describing
the service model, algorithmic analysis and operating experience. In
previous versions these two objectives were combined in one document.
While the architecture assumed in Version 3 is identical to Version 2,
the protocols and algorithms differ in minor ways. Differences between
NTP Version 3 and previous versions are described in this Appendix. Due
to known bugs in very old implementations, continued support for
Version-0 implementations is not recommended. It is recommended that new
implementations follow the guidelines below when interoperating with
older implementations.
Version 3 neither changes the protocol in any significant way nor
obsoletes previous versions or existing implementations. The main
motivation for the new version is to refine the analysis and
implementation models for new applications at much higher network speeds
to the gigabit-per-second regime and to provide for the enhanced
stability, accuracy and precision required at such speeds. In
particular, the sources of time and frequency errors have been
rigorously examined and error bounds established in order to improve
performance, provide a model for correctness assertions and indicate
timekeeping quality to the user. Version 3 also incorporates two new
optional features, (1) an algorithm to combine the offsets of a number
of peer time servers in order to enhance accuracy and (2) improved
local-clock algorithms which allow the poll intervals on all
synchronization paths to be substantially increased in order to reduce
network overhead. Following is a summary of previous versions of the
protocol together with details of the Version 3 changes.
1.
Version 1 supports no modes other than symmetric-active and symmetric-
passive, which are determined by inspecting the port-number fields of
the UDP packet header. The peer mode can be determined explicitly from
the packet-mode variable (pkt.mode) if it is nonzero and implicitly from
the source port (pkt.peerport) and destination port (pkt.hostport)
variables if it is zero. For the case where pkt.mode is zero the mode is
determined as follows:
@Z_TBL_BEG = COLUMNS(3), DIMENSION(IN), WIDTH(5.0000), ABOVE(.1670),
BELOW(.0830), HGUTTER(.3330), BOX(Z_SINGLE), KEEP(ON), ALIGN(CT),
L1(R1C0..R1C3)
@Z_TBL_BODY = TABLE HEADER, TABLE HEADER, TABLE HEADER
pkt.peerport, pkt.hostport, Mode
@Z_TBL_BODY = TABLE TEXT, TABLE TEXT, TABLE TEXT
NTP.PORT, NTP.PORT, symmetric active
NTP.PORT, not NTP.PORT, server
not NTP.PORT, NTP.PORT, client
@Z_TBL_BODY = TABLE HEADER, TABLE HEADER, TABLE HEADER
not NTP.PORT, not NTP.PORT, not possible
@Z_TBL_END =
Note that it is not possible in this case to distinguish between
symmetric active and symmetric passive modes. Use of the pkt.mode and
NTP.PORT variables in this way is not recommended and may not be
supported in future versions of the protocol. The low-order three bits
of the first octet, specified as zero in Version 1, are used for the
mode field in Version 2. Version-2 and Version-3 implementations
interoperating with Version-1 implementations should operate in a
passive mode only and use the value one in the version number
(pkt.version) field and zero in the mode (pkt.mode) field in transmitted
messages.
2.
Version 1 does not support the NTP control message described in Appendix
B. Certain old versions of the Unix NTP daemon ntpd use the high-order
bits of the stratum field (pkt.stratum) for control and monitoring
purposes. While these bits are never set during normal Version-1,
Version-2 or Version-3 operations, new implementations may use the NTP
reserved mode 6 described in Appendix B and/or private reserved mode 7
for special purposes, such as remote control and monitoring, and in such
cases the format of the packet following the first octet can be
arbitrary. While there is no guarantee that different implementations
can interoperate using private reserved mode 7, it is recommended that
vanilla ASCII format be used whenever possible.
3.
Version 1 does not support authentication. The key identifiers,
cryptographic keys and procedures described in Appendix C are new to
Version 2 and continued in Version 3, along with the corresponding
variables, procedures and authenticator fields. In the NTP message
described in Appendix A and NTP control message described in Appendix B
the format and contents of the header fields are independent of the
authentication mechanism and the authenticator itself follows the header
fields, so that previous versions will ignore the authenticator.
4.
In Version 1 the total dispersion (pkt.rootdispersion) field of the NTP
header was called the estimated drift rate, but not used in the protocol
or timekeeping procedures. Implementations of the Version-1 protocol
typically set this field to the current value of the skew-compensation
register, which is a signed quantity. In a Version 2 implementation
apparent large values in this field may affect the order considered in
the clock-selection procedure. Version-2 and Version-3 implementations
interoperating with older implementations should assume this field is
zero, regardless of its actual contents.
5.
Version 2 and Version 3 incorporate several sanity checks designed to
avoid disruptions due to unsynchronized, duplicate or bogus timestamp
information. The checks in Version 3 are specifically designed to detect
lost or duplicate packets and resist invalid timestamps. The leap-
indicator bits are set to show the unsynchronized state if updates are
not received from a reference source for a considerable time or if the
reference source has not received updates for a considerable time. Some
Version-1 implementations could claim valid synchronization indefinitely
following loss of the reference source.
6.
The clock-selection procedure of Version 2 was considerably refined as
the result of accumulated experience with the Version-1 implementation.
Additional sanity checks are included for authentication, range bounds
and to avoid use of very old data. The candidate list is sorted twice,
once to select a relatively few robust candidates from a potentially
large population of unruly peers and again to order the resulting list
by measurement quality. As in Version 1, The final selection procedure
repeatedly casts out outlyers on the basis of weighted dispersion.
7.
The local-clock procedure of Version 2 were considerably improved over
Version 1 as the result of analysis, simulation and experience. Checks
have been added to warn that the oscillator has gone too long without
update from a reference source. The compliance register has been added
to improve frequency stability to the order of a millisecond per day.
The various parameters were retuned for optimum loop stability using
measured data over typical Internet paths and with typical local-clock
hardware. In version 3 the phase-lock loop model was further refined to
provide an adaptive-bandwidth feature that automatically adjusts for the
inherent stabilities of the reference clock and local clock while
providing optimum loop stability in each case.
8.
Problems in the timekeeping calculations of Version 1 with high-speed
LANs were found and corrected in Version 2. These were caused by jitter
due to small differences in clock rates and different precisions between
the peers. Subtle bugs in the Version-1 reachability and polling-rate
control were found and corrected. The peer.valid and sys.hold variables
were added to avoid instabilities when the reference source changes
rapidly due to large dispersive delays under conditions of severe
network congestion. The peer.config, peer.authenable and peer.authentic
bits were added to control special features and simplify configuration.
9.
In Version 3 The local-clock algorithm has been overhauled to improve
stability and accuracy. Appendix G presents a detailed mathematical
model and design example which has been refined with the aid of
feedback-control analysis and extensive simulation using data collected
over ordinary Internet paths. Section 5 of RFC-1119 on the NTP local
clock has been completely rewritten to describe the new algorithm. Since
the new algorithm can result in message rates far below the old ones, it
is highly recommended that they be used in new implementations. Note
that this algorithm is not integral to the NTP protocol specification
itself and its use does not affect interoperability with previous
versions or existing implementations; however, in order to insure
overall NTP subnet stability in the Internet, it is essential that the
local-clock characteristics of all NTP time servers conform to the
analytical models presented previously and in this document.
10.
In Version 3 a new algorithm to combine the offsets of a number of peer
time servers is presented in Appendix F. This algorithm is modelled on
those used by national standards laboratories to combine the weighted
offsets from a number of standard clocks to construct a synthetic
laboratory timescale more accurate than that of any clock separately. It
can be used in an NTP implementation to improve accuracy and stability
and reduce errors due to asymmetric paths in the Internet. The new
algorithm has been simulated using data collected over ordinary Internet
paths and, along with the new local-clock algorithm, implemented and
tested in the Fuzzball time servers now running in the Internet. Note
that this algorithm is not integral to the NTP protocol specification
itself and its use does not affect interoperability with previous
versions or existing implementations.
11.
Several inconsistencies and minor errors in previous versions have been
corrected in Version 3. The description of the procedures has been
rewritten in pseudo-code augmented by English commentary for clarity and
to avoid ambiguity. Appendix I has been added to illustrate C-language
implementations of the various filtering and selection algorithms
suggested for NTP. Additional information is included in Section 5 and
in Appendix E, which includes the tutorial material formerly included in
Section 2 of RFC-1119, as well as much new material clarifying the
interpretation of timescales and leap seconds.
12.
Minor changes have been made in the Version-3 local-clock algorithms to
avoid problems observed when leap seconds are introduced in the UTC
timescale and also to support an auxiliary precision oscillator, such as
a cesium clock or timing receiver, as a precision timebase. In addition,
changes were made to some procedures described in Section 3 and in the
clock-filter and clock-selection procedures described in Section 4.
While these changes were made to correct minor bugs found as the result
of experience and are recommended for new implementations, they do not
affect interoperability with previous versions or existing
implementations in other than minor ways (at least until the next leap
second).
13.
In Version 3 changes were made to the way delay, offset and dispersion
are defined, calculated and processed in order to reliably bound the
errors inherent in the time-transfer procedures. In particular, the
error accumulations were moved from the delay computation to the
dispersion computation and both included in the clock filter and
selection procedures. The clock-selection procedure was modified to
remove the first of the two sorting/discarding steps and replace with an
algorithm first proposed by Marzullo and later incorporated in the
Digital Time Service. These changes do not significantly affect the
ordinary operation of or compatibility with various versions of NTP, but
they do provide the basis for formal statements of correctness as
described in Appendix H.
Appendix E. The NTP Timescale and its Chronometry
Introduction
Following is an extended discussion on computer network chronometry,
which is the precise determination of computer time and frequency
relative to international standards and the determination of
conventional civil time and date according to the modern calendar. It
describes the methods conventionally used to establish civil time and
date and the various timescales now in use. In particular, it
characterizes the Network Time Protocol (NTP) timescale relative to the
Coordinated Universal Time (UTC) timescale, and establishes the precise
interpretation of UTC leap seconds in NTP.
In the following discussion the terms time, oscillator, clock, epoch,
calendar, date and timescale are used in a technical sense. Strictly
speaking, the time of an event is an abstraction which determines the
ordering of events in some given frame of reference. An oscillator is a
generator capable of precise frequency (relative to the given frame of
reference) to a specified tolerance. A clock is an oscillator together
with a counter which records the (fractional) number of cycles since
being initialized with a given value at a given time. The value of the
counter at any given time is called its epoch at that time. In general,
epoches are not continuous and depend on the precision of the counter.
A calendar is a mapping from epoch in some frame of reference to the
times and dates used in everyday life. Since multiple calendars are in
use today and sometimes disagree on the dating of the same events in the
past, the chronometry of past and present events is an art practiced by
historians. One of the goals of this discussion is to provide a standard
chronometry for precision dating of present and future events in a
global networking community. To synchronize frequency means to adjust
the oscillators in the network to run at the same frequency, to
synchronize time means to set the clocks so that all agree at a
particular epoch with respect to UTC, as provided by international
standards, and to synchronize clocks means to synchronize them in both
frequency and time.
In order to synchronize clocks, there must be some way to directly or
indirectly compare them in time and frequency. The ultimate frame of
reference for our world consists of the cosmic oscillators: the Sun,
Moon and other galactic orbiters. Since the frequencies of these
oscillators are relatively unstable and not known exactly, the ultimate
reference standard oscillator has been chosen by international agreement
as a synthesis of many observations of an atomic transition of exquisite
stability. The epoches of each heavenly and Earthbound oscillator
defines a distinctive timescale, not necessarily always continuous,
relative to the standard oscillator. Another goal of this presentation
is to describe a standard chronometry to rationalize conventional
computer time and UTC; in particular, how to handle leap seconds.
Primary Frequency and Time Standards
A primary frequency standard is an oscillator that can maintain
extremely precise frequency relative to a physical phenomenon, such as a
transition in the orbital states of an electron. Presently available
atomic oscillators are based on the transitions of the hydrogen, cesium
and rubidium atoms. Table 7<$&tab7> shows the characteristics for
typical oscillators of these types compared with those for various types
of quartz-crystal oscillators found in electronic equipment. For reasons
of cost and robustness cesium oscillators are used worldwide for
national primary frequency standards. On the other hand, local clocks
used in computing equipment almost always are designed with
uncompensated crystal oscillators.
For the three atomic oscillators listed in Table 7 the drift/aging
column shows the maximum offset per day from nominal standard frequency
due to systematic mechanical and electrical characteristics. In the case
of crystal oscillators this offset is not constant, which results in a
gradual change in frequency with time, called aging. Even if a crystal
oscillator is temperature compensated by some means, it must be
periodically compared to a primary standard in order to maintain the
highest accuracy. For all types of oscillators the stability column
shows the maximum variation in frequency per day due to circuit noise
and environmental factors.
As the telephone networks of the world are evolving rapidly to digital
technology, consideration should be given to the methods used for
frequency synchronization in digital networks. A network of clocks in
which each oscillator is phase-locked to a single frequency standard is
called isochronous, while a network in which some oscillators are phase-
locked to different master oscillators, but with the master oscillators
closely synchronized in frequency (not necessarily phase locked), to a
single frequency standard is called plesiochronous. In plesiochronous
systems the phase of some oscillators can slip relative to others and
cause occasional data errors in synchronous transmission systems.
The industry has agreed on a classification of clock oscillators as a
function of minimum accuracy, minimum stability and other factors
[ALL74a]. There are three factors which determine the classification:
stability, jitter and wander. Stability refers to the systematic
variation of frequency with time and is synonymous with aging, drift,
trends, etc. Jitter (also called timing jitter) refers to short-term
variations in frequency with components greater than 10 Hz, while wander
refers to long-term variations in frequency with components less than 10
Hz. The classification determines the oscillator stratum (not to be
confused with the NTP stratum), with the more accurate oscillators
assigned the lower strata and less accurate oscillators the higher
strata:
@Z_TBL_BEG = COLUMNS(3), DIMENSION(IN), COLWIDTHS(E1,E2,E2),
WIDTH(5.0000), ABOVE(.1670), BELOW(.0830), HGUTTER(.3330),
BOX(Z_SINGLE), KEEP(ON), ALIGN(CT), L1(R1C0..R1C3)
@Z_TBL_BODY = TABLE CENTER, TABLE HEADER, TABLE HEADER
Stratum, Min Accuracy (per day), Min Stability (per day)
@Z_TBL_BODY = TABLE CENTER, TABLE TEXT, TABLE TEXT
1, 1 x 10-11, not specified
2, 1.6 x 10-8, 1 x 10-10
3, 4.6 x 10-6, 3.7 x 10-7
@Z_TBL_BODY = TABLE CENTER, TABLE HEADER, TABLE HEADER
4, 3.2 x 10-5, not specified
@Z_TBL_END =
The construction, operation and maintenance of stratum-one oscillators
is assumed to be consistent with national standards and often includes
cesium oscillators or precision crystal oscillators synchronized via
LORAN-C to national standards. Stratum-two oscillators represent the
stability required for interexchange toll switches such as the AT&T 4ESS
and interexchange digital cross-connect systems, while stratum-three
oscillators represent the stability required for exchange switches such
as the AT&T 5ESS and local cross-connect systems. Stratum-four
oscillators represent the stability required for digital channel-banks
and PBX systems.
Time and Frequency Dissemination
In order that atomic and civil time can be coordinated throughout the
world, national administrations operate primary time and frequency
standards and coordinate them cooperatively by observing various radio
broadcasts and through occasional use of portable atomic clocks. Most
seafaring nations of the world operate some sort of broadcast time
service for the purpose of calibrating chronographs, which are used in
conjunction with ephemeris data to determine navigational position. In
many countries the service is primitive and limited to seconds-pips
broadcast by marine communication stations at certain hours. For
instance, a chronograph error of one second represents a longitudinal
position error of about 0.23 nautical mile at the Equator.
The U.S. National Institute of Standards and Technology (NIST - formerly
National Bureau of Standards) operates three radio services for the
dissemination of primary time and frequency information. One of these
uses high-frequency (HF or CCIR band 7) transmissions on frequencies of
2.5, 5, 10, 15 and 20 MHz from Fort Collins, CO (WWV), and Kauai, HI
(WWVH). Signal propagation is usually by reflection from the upper
ionospheric layers, which vary in height and composition throughout the
day and season and result in unpredictable delay variations at the
receiver. The timecode is transmitted over a 60-second interval at a
data rate of 1 bps using a 100-Hz subcarrier on the broadcast signal.
The timecode information includes UTC time-day information, but does not
currently include year or leap-second warning. While these transmissions
and those of Canada from Ottawa, Ontario (CHU), and other countries can
be received over large areas in the western hemisphere, reliable
frequency comparisons can be made only to the order of 10-7 and time
accuracies are limited to the order of a millisecond [BLA74]. Radio
clocks which operate with these transmissions include the Traconex 1020,
which provides accuracies to about ten milliseconds and is priced in the
$1,500 range.
A second service operated by NIST uses low-frequency (LF or CCIR band 5)
transmissions on 60 kHz from Boulder, CO (WWVB), and can be received
over the continental U.S. and adjacent coastal areas. Signal propagation
is via the lower ionospheric layers, which are relatively stable and
have predictable diurnal variations in height. The timecode is
transmitted over a 60-second interval at a rate of 1 pps using periodic
reductions in carrier power. With appropriate receiving and averaging
techniques and corrections for diurnal and seasonal propagation effects,
frequency comparisons to within 10-11 are possible and time accuracies
of from a few to 50 microseconds can be obtained [BLA74]. Some countries
in western Europe operate similar services which use transmissions on 60
kHz from Rugby, U.K. (MSF), and on 77.5 kHz from Mainflingen, West
Germany (DCF77). The timecode information includes UTC time-day-year
information and leap-second warning. Radio clocks which operate with
these transmissions include the Spectracom 8170 and Kinemetrics/TrueTime
60-DC and LF-DC, which provide accuracies to a millisecond or less and
are priced in the $2,500 range. However, these receivers do not extract
the year information and leap-second warning.
The third service operated by NIST uses ultra-high frequency (UHF or
CCIR band 9) transmissions on about 468 MHz from the Geosynchronous
Orbit Environmental Satellites (GOES), three of which cover the western
hemisphere. The timecode is interleaved with messages used to
interrogate remote sensors and consists of 60 4-bit binary-coded decimal
words transmitted over an interval of 30 seconds. The timecode
information includes UTC time-day-year information and leap-second
warning. Radio clocks which operate with these transmissions include the
Kinemetrics/TrueTime 468-DC, which provides accuracies to 0.5 ms and is
priced in the $6,000 range. However, this receiver does not extract the
year information and leap-second warning.
The U.S. Department of Defense is developing the Global Positioning
System (GPS) for worldwide precision navigation. This system will
eventually provide 24-hour worldwide coverage using a constellation of
24 satellites in 12-hour orbits. For time-transfer applications GPS has
a potential accuracy in the order of a few nanoseconds; however, various
considerations of defense policy may limit accuracy to hundreds of
nanoseconds [VAN84]. The timecode information includes GPS time and UTC
correction; however, there appears to be no leap-second warning. Radio
clocks which operate with these transmissions include the
Kinemetrics/TrueTime GPS-DC, which provides accuracies to 200 <$Emu>s
and is priced in the $12,000 range. However, since only about half the
satellites have been launched, expensive rubidium or quartz oscillators
are necessary to preserve accuracy during outages. Also, since this is a
single-channel receiver, it must be supplied with geographic coordinates
within a degree from an external source before operation begins.
The U.S. Coast Guard, along with agencies of other countries, has
operated the LORAN-C [FRA82] radionavigation system for many years. It
currently provides time-transfer accuracies of less than a microsecond
and eventually may achieve 100 ns within the ground-wave coverage area
of a few hundred kilometers from the transmitter. Beyond the ground wave
area signal propagation is via the lower ionospheric layers, which
decreases accuracies to the order of 50 us. With the recent addition of
the Mid-Continent Chain, the deployment of LORAN-C transmitters now
provides complete coverage of the U.S. LORAN-C timing receivers, such as
the Austron 2000, are specialized and extremely expensive (up to
$20,000). They are used primarily to monitor local cesium clocks and are
not suited for unattended, automatic operation. While the LORAN-C system
provides a highly accurate frequency and time reference within the
ground wave area, there is no timecode modulation, so the receiver must
be supplied with UTC time to within a few tens of seconds from an
external source before operation begins.
The OMEGA [VAS78] radionavigation system operated by the U.S. Navy and
other countries consists of eight very-low-frequency (VLF or CCIR band
4) transmitters operating on frequencies from 10.2 to 13.1 kHz and
providing 24-hour worldwide coverage. With appropriate receiving and
averaging techniques and corrections for propagation effects, frequency
comparisons and time accuracies are comparable to the LF systems, but
with worldwide coverage [BLA74]. Radio clocks which operate with these
transmissions include the Kinemetrics/TrueTime OM-DC, which provides
accuracies to 1 ms and is priced in the $3,500 range. While the OMEGA
system provides a highly accurate frequency reference, there is no
timecode modulation, so the receiver must be supplied with geographic
coordinates within a degree and UTC time within five seconds from an
external source before operation begins. There are several other VLF
services intended primarily for worldwide data communications with
characteristics similar to OMEGA. These services can be used in a manner
similar to OMEGA, but this requires specialized techniques not suited
for unattended, automatic operation.
Note that not all transmission formats used by NIST radio broadcast
services [NBS79] and no currently available radio clocks include
provisions for year information and leap-second warning. This
information must be determined from other sources. NTP includes
provisions to distribute advance warnings of leap seconds using the
leap-indicator bits described in the NTP specification. The protocol is
designed so that these bits can be set manually or by the radio timecode
at the primary time servers and then automatically distributed
throughout the synchronization subnet to all other time servers.
Calendar Systems
The calendar systems used in the ancient world reflect the agricultural,
political and ritual needs characteristic of the societies in which they
flourished. Astronomical observations to establish the winter and summer
solstices were in use three to four millennia ago. By the 14th century
BC the Shang Chinese had established the solar year as 365.25 days and
the lunar month as 29.5 days. The lunisolar calendar, in which the
ritual month is based on the Moon and the agricultural year on the Sun,
was used throughout the ancient Near East (except Egypt) and Greece from
the third millennium BC. Early calendars used either thirteen lunar
months of 28 days or twelve alternating lunar months of 29 and 30 days
and haphazard means to reconcile the 354/364-day lunar year with the
365-day vague solar year.
The ancient Egyptian lunisolar calendar had twelve 30-day lunar months,
but was guided by the seasonal appearance of the star Sirius (Sothis).
In order to reconcile this calendar with the solar year, a civil
calendar was invented by adding five intercalary days for a total of 365
days. However, in time it was observed that the civil year was about
one-fourth day shorter than the actual solar year and thus would precess
relative to it over a 1460-year cycle called the Sothic cycle. Along
with the Shang Chinese, the ancient Egyptians had thus established the
solar year at 365.25 days, or within about 11 minutes of the present
measured value. In 432 BC, about a century after the Chinese had done
so, the Greek astronomer Meton calculated there were 110 lunar months of
29 days and 125 lunar months of 30 days for a total of 235 lunar months
in 6940 solar days, or just over 19 years. The 19-year cycle, called the
Metonic cycle, established the lunar month at 29.532 solar days, or
within about two minutes of the present measured value.
The Roman republican calendar was based on a lunar year and by 50 BC was
eight weeks out of step with the solar year. Julius Caesar invited the
Alexandrian astronomer Sosigenes to redesign the calendar, which led to
the adoption in 46 BC of the Julian calendar. This calendar is based on
a year of 365 days with an intercalary day inserted every four years.
However, for the first 36 years an intercalary day was mistakenly
inserted every three years instead of every four. The result was 12
intercalary days instead of nine, and a series of corrections that was
not complete until 8 AD.
The seven-day Sumerian week was introduced only in the fourth century AD
by Emperor Constantine I. During the Roman era a 15-year census cycle,
called the Indiction cycle, was instituted for taxation purposes. The
sequence of day-names for consecutive occurrences of a particular day of
the year does not recur for 28 years, called the solar cycle. Thus, the
least common multiple of the 28-year solar cycle, 19-year Metonic cycle
and 15-year Indiction cycle results in a grand 7980-year supercycle
called the Julian Era, which began in 4713 BC. A particular combination
of the day of the week, day of the year, phase of the Moon and round of
the census will recur beginning in 3268 AD.
By 1545 the discrepancy in the Julian year relative to the solar year
had accumulated to ten days. In 1582, following suggestions by the
astronomers Christopher Clavius and Luigi Lilio, Pope Gregory XIII
issued a papal bull which decreed, among other things, that the solar
year would consist of 365.2422 days. In order to more closely
approximate the new value, only those centennial years divisible by 400
would be leap years, while the remaining centennial years would not,
making the actual value 365.2425, or within about 26 seconds of the
current measured value. Since the beginning of the Common Era and prior
to 1990 there were 474 intercalary days inserted in the Julian calendar,
but 14 of these were removed in the Gregorian calendar. While the
Gregorian calendar is in use throughout most of the world today, some
countries did not adopt it until early in the twentieth century.
While it remains a fascinating field for time historians, the above
narrative provides conclusive evidence that conjugating calendar dates
of significant events and assigning NTP timestamps to them is
approximate at best. In principle, reliable dating of such events
requires only an accurate count of the days relative to some globally
alarming event, such as a comet passage or supernova explosion; however,
only historically persistent and politically stable societies, such as
the ancient Chinese and Egyptian, and especially the classic Maya,
possessed the means and will to do so.
The Modified Julian Day System
In order to measure the span of the universe or the decay of the proton,
it is necessary to have a standard day-numbering plan. Accordingly, the
International Astronomical Union has adopted the use of the standard
second and Julian Day Number (JDN) to date cosmological events and
related phenomena. The standard day consists of 86,400 standard seconds,
where time is expressed as a fraction of the whole day, and the standard
year consists of 365.25 standard days.
In the scheme devised in 1583 by the French scholar Joseph Julius
Scaliger and named after his father, Julius Caesar Scaliger, JDN 0.0
corresponds to 12h (noon) on the first day of the Julian Era, 1 January
4713 BC. The years prior to the Common Era (BC) are reckoned according
to the Julian calendar, while the years of the Common Era (AD) are
reckoned according to the Gregorian calendar. Since 1 January 1 AD in
the Gregorian calendar corresponds to 3 January 1 in the Julian calendar
[DER90], JDN 1,721,426.0 corresponds to 12h on the first day of the
Common Era, 1 January 1 AD. The Modified Julian Date (MJD), which is
sometimes used to represent dates near our own era in conventional time
and with fewer digits, is defined as MJD = JD <196> 2,400,000.5.
Following the convention that our century began at 0h on 1 January 1900,
at which time the tropical year was already 12h old, that eclectic
instant corresponds to MJD 15,020.0. Thus, the Julian timescale ticks in
standard (atomic) 365.25-day centuries and was set to a given value at
the approximate epoch of a cosmic event which apparently synchronized
the entire human community, the origin of the Common Era.
Determination of Frequency
For many years the most important use of time and frequency information
was for worldwide navigation and space science, which depend on
astronomical observations of the Sun, Moon and stars [JOR85]. Sidereal
time is based on the transit of stars across the celestial meridian of
an observer. The mean sidereal day is 23 hours, 56 minutes and 4.09
seconds, but varies about <F128M>æ<F255D>30 ms throughout the year due
to polar wandering and orbit variations. Ephemeris time is based on
tables with which a standard time interval such as the tropical year -
one complete revolution of the Earth around the Sun - can be determined
through observations of the Sun, Moon and planets. In 1958 the standard
second was defined as 1/31,556,925.9747 of the tropical year that began
this century. On this scale the tropical year is 365.2421987 days and
the lunar month - one complete revolution of the Moon around the Earth -
is 29.53059 days; however, the actual tropical year can be determined
only to an accuracy of about 50 ms and has been increasing by about 5.3
ms per year.
Of the three heavenly oscillators readily apparent to ancient mariners
and astronomers - the Earth rotation about its axis, the Earth
revolution around the Sun and the Moon revolution around the Earth -
none of the three have the intrinsic stability, relative to modern
technology, to serve as a standard reference oscillator. In 1967 the
standard second was redefined as <169>9,192,631,770 periods of the
radiation corresponding to the transition between the two hyperfine
levels of the ground state of the cesium-133 atom.<170> Since 1972 the
time and frequency standards of the world have been based on
International Atomic Time (TAI), which is defined and maintained using
multiple cesium-beam oscillators to an accuracy of a few parts in 1013,
or better than a microsecond per day. Note that, while this provides an
extraordinarily precise timescale, it does not necessarily agree with
conventional solar time and may not in fact even be absolutely uniform,
unless subtle atomic conspiracies can be ruled out.
Determination of Time and Leap Seconds
The International Bureau of Weights and Measures (IBWM) uses
astronomical observations provided by the U.S. Naval Observatory and
other observatories to determine UTC. Starting from apparent mean solar
time as observed, the UT0 timescale is determined using corrections for
Earth orbit and inclination (the Equation of Time, as used by sundials),
the UT1 (navigator's) timescale by adding corrections for polar
migration and the UT2 timescale by adding corrections for known
periodicity variations. While standard frequencies are based on TAI,
conventional civil time is based on UT1, which is presently slowing
relative to TAI by a fraction of a second per year. When the magnitude
of correction approaches 0.7 second, a leap second is inserted or
deleted in the TAI timescale on the last day of June or December.
For the most precise coordination and timestamping of events since 1972,
it is necessary to know when leap seconds are implemented in UTC and how
the seconds are numbered. As specified in CCIR Report 517, which is
reproduced in [BLA74], a leap second is inserted following second
23:59:59 on the last day of June or December and becomes second 23:59:60
of that day. A leap second would be deleted by omitting second 23:59:59
on one of these days, although this has never happened. Leap seconds
were inserted prior to 1 January 1991 on the occasions listed in Table
8<$&tab8> (courtesy U.S. Naval Observatory). Published IBWM corrections
consist not only of leap seconds, which result in step discontinuities
relative to TAI, but 100-ms UT1 adjustments called DUT1, which provide
increased accuracy for navigation and space science.
Note that the NTP time column actually shows the epoch following the
last second of the day given in the UTC date and MJD columns (except for
the first line), which is the precise epoch of insertion. The offset
column shows the cumulative seconds offset between the uncoordinated
(Julian) timescale and the UTC timescale; that is, the number of seconds
to add to the Julian clock in order to maintain nominal agreement with
the UTC clock. Finally, note that the epoch of insertion is relative to
the timescale immediately prior to that epoch; e.g., the epoch of the 31
December 90 insertion is determined on the timescale in effect following
the 31 December 1990 insertion, which means the actual insertion
relative to the Julian clock is fourteen seconds later than the apparent
time on the UTC timescale.
The UTC timescale thus ticks in standard (atomic) seconds and was set to
the value 0h MJD 41,317.0 at the epoch determined by astronomical
observation to be 0h on 1 January 1972 according to the Gregorian
calendar; that is, the inaugural tick of the UTC Era. In fact, the
inaugural tick which synchronized the cosmic oscillators, Julian clock,
UTC clock and Gregorian calendar forevermore was displaced about ten
seconds from the civil clock then in use, while the GPS clock is ahead
of the UTC clock by six seconds in late 1990. Subsequently, the UTC
clock has marched backward relative to the Julian timescale exactly one
second on scheduled occasions at monumental epoches embedded in the
institutional memory of our civilization. Note in passing that leap-
second adjustments affect the number of seconds per day and thus the
number of seconds per year. Apparently, should we choose to worry about
it, the UTC clock, Julian clock and various cosmic clocks will
inexorably drift apart with time until rationalized by some future papal
bull.
The NTP Timescale and Reckoning with UTC
The NTP timescale is based on the UTC timescale, but not necessarily
always coincident with it. At 0h on 1 January 1972 (MJD 41,317.0), the
first tick of the UTC Era, the NTP clock was set to 2,272,060,800,
representing the number of standard seconds since 0h on 1 January 1900
(MJD 15,020.0). The insertion of leap seconds in UTC and subsequently
into NTP does not affect the UTC or NTP oscillator, only the conversion
to conventional civil UTC time. However, since the only institutional
memory available to NTP are the UTC timecode broadcast services, the NTP
timescale is in effect reset to UTC as each timecode is received. Thus,
when a leap second is inserted in UTC and subsequently in NTP, knowledge
of all previous leap seconds is lost.
Another way to describe this is to say there are as many NTP timescales
as historic leap seconds. In effect, a new timescale is established
after each new leap second. Thus, all previous leap seconds, not to
mention the apparent origin of the timescale itself, lurch backward one
second as each new timescale is established. If a clock synchronized to
NTP in 1990 was used to establish the UTC epoch of an event that
occurred in early 1972 without correction, the event would appear
fifteen seconds late relative to UTC. However, NTP primary time servers
resolve the epoch using the broadcast timecode, so that the NTP clock is
set to the broadcast value on the current timescale. As a result, for
the most precise determination of epoch relative to the historic UTC
clock, the user must subtract from the apparent NTP epoch the offsets
shown in Table 8 at the relative epoches shown. This is a feature of
almost all present day time-distribution mechanisms.
The chronometry involved can be illustrated with the help of Figure 8,
which shows the details of seconds numbering just before, during and
after the last scheduled leap insertion at 23:59:59 on 31 December 1989.
Notice the NTP leap bits are set on the day prior to insertion, as
indicated by the <169>+<170> symbols on the figure. Since this makes the
day one second longer than usual, the NTP day rollover will not occur
until the end of the first occurrence of second 800. The UTC time
conversion routines must notice the apparent time and the leap bits and
handle the timescale conversions accordingly. Immediately after the leap
insertion both timescales resume ticking the seconds as if the leap had
never happened. The chronometric correspondence between the UTC and NTP
timescales continues, but NTP has forgotten about all past leap
insertions. In NTP chronometric determination of UTC time intervals
spanning leap seconds will thus be in error, unless the exact times of
insertion are known.
It is possible that individual systems may use internal data formats
other than the NTP timestamp format, which is represented in seconds to
a precision of about 200 picoseconds; however, a persuasive argument
exists to use a two-part representation, one part for whole days (MJD or
some fixed offset from it) and the other for the seconds (or some scaled
value, such as milliseconds). This not only facilitates conversion
between NTP and conventional civil time, but makes the insertion of leap
seconds much easier. All that is required is to change the modulus of
the seconds counter, which on overflow increments the day counter. This
design insures that continuity of the timescale is assured, even if
outside synchronization is lost before, during or after leap-second
insertion. Since timestamp data are unaffected, synchronization is
assured, even if timestamp data are in flight at the instant and
originated before or at that instant.
Appendix F. The NTP Clock-Combining Algorithm
Introduction
A common problem in synchronization subnets is systematic time-offset
errors resulting from asymmetric transmission paths, where the networks
or transmission media in one direction are substantially different from
the other. The errors can range from microseconds on high-speed ring
networks to large fractions of a second on satellite/landline paths. It
has been found experimentally that these errors can be considerably
reduced by combining the apparent offsets of a number of time servers to
produce a more accurate working offset. Following is a description of
the combining method used in the NTP implementation for the Fuzzball
[MIL88b]. The method is similar to that used by national standards
laboratories to determine a synthetic laboratory timescale from an
ensemble of cesium clocks [ALL74b]. These procedures are optional and
not required in a conforming NTP implementation.
In the following description the stability of a clock is how well it can
maintain a constant frequency, the accuracy is how well its frequency
and time compare with national standards and the precision is how
precisely these quantities can be maintained within a particular
timekeeping system. Unless indicated otherwise, The offset of two clocks
is the time difference between them, while the skew is the frequency
difference (first derivative of offset with time) between them. Real
clocks exhibit some variation in skew (second derivative of offset with
time), which is called drift.
Determining Time and Frequency
Figure 9<$&fig9> shows the overall organization of the NTP time-server
model. Timestamps exchanged with possibly many other subnet peers are
used to determine individual roundtrip delays and clock offsets relative
to each peer as described in the NTP specification. As shown in the
figure, the computed delays and offsets are processed by the clock
filter to reduce incidental timing noise and the most accurate and
reliable subset determined by the clock-selection algorithm. The
resulting offsets of this subset are first combined as described below
and then processed by the phase-locked loop (PLL). In the PLL the
combined effects of the filtering, selection and combining operations is
to produce a phase-correction term. This is processed by the loop filter
to control the local clock, which functions as a voltage-controlled
oscillator (VCO). The VCO furnishes the timing (phase) reference to
produce the timestamps used in all calculations.
Clock Modelling
The International Standard (SI) definition of time interval is in terms
of the standard second: <169>the duration of 9,192,631,770 periods of
the radiation corresponding to the transition between the two hyperfine
levels of the ground state of the cesium-133 atom.<170> Let u represent
the standard unit of time interval so defined and <$Ev~=~1 over u> be
the standard unit of frequency. The epoch, denoted by t, is defined as
the reading of a counter that runs at frequency v and began counting at
some agreed initial epoch t0, which defines the standard or absolute
timescale. For the purposes of the following analysis, the epoch of the
standard timescale, as well as the time indicated by a clock will be
considered continuous. In practice, time is determined relative to a
clock constructed from an atomic oscillator and system of
counter/dividers, which defines a timescale associated with that
particular oscillator. Standard time and frequency are then determined
from an ensemble of such timescales and algorithms designed to combine
them to produce a composite timescale approximating the standard
timescale.
Let <$ET(t)> be the time displayed by a clock at epoch t relative to the
standard timescale:
<$ET(t)~=~1/2 D(t sub 0 )[t~-~t sub 0 ] sup 2~+~R(t sub 0 )[t~-~t sub 0
]~ +~T(t sub 0 )~+~x(t)> ,
where <$ED(t sub 0 )> is the fractional frequency drift per unit time,
<$ER(t sub 0 )> the frequency and <$ET(t sub 0 )> the time at some
previous epoch t0. In the usual stationary model these quantities can be
assumed constant or changing slowly with epoch. The random nature of the
clock is characterized by <$Ex(t)>, which represents the random noise
(jitter) relative to the standard timescale. In the usual analysis the
second-order term <$ED(t sub 0 )> is ignored and the noise term <$Ex(t)>
modelled as a normal distribution with predictable spectral density or
autocorrelation function.
The probability density function of time offset <$Eroman p (t~-~T(t))>
usually appears as a bell-shaped curve centered somewhere near zero. The
width and general shape of the curve are determined by <$Ex(t)>, which
depends on the oscillator precision and jitter characteristics, as well
as the measurement system and its transmission paths. Beginning at epoch
t0 the offset is set to zero, following which the bell creeps either to
the left or right, depending on the value of <$ER(t sub 0 )> and
accelerates depending on the value of <$ED(t sub 0 )>.
Development of a Composite Timescale
Now consider the time offsets of a number of real clocks connected by
real networks. A display of the offsets of all clocks relative to the
standard timescale will appear as a system of bell-shaped curves slowly
precessing relative to each other, but with some further away from
nominal zero than others. The bells will normally be scattered over the
offset space, more or less close to each other, with some overlapping
and some not. The problem is to estimate the true offset relative to the
standard timescale from a system of offsets collected routinely between
the clocks.
A composite timescale can be determined from a sequence of offsets
measured between the n clocks of an ensemble at nominal intervals
<$Etau>. Let <$ER sub i (t sub 0 )> be the frequency and <$ET sub i (t
sub 0 )> the time of the ith clock at epoch t0 relative to the standard
timescale and let <169>^<170> designate the associated estimates. Then,
an estimator for Ti computed at t0 for epoch <$Et sub 0~+~tau> is
<$ET hat sub i ( t sub 0~+~ tau )~=~R hat sub i (t sub 0 ) tau ~+~T sub
i (t sub 0 )> ,
neglecting second-order terms. Consider a set of n independent time-
offset measurements made between the clocks at epoch <$Et sub 0 ~+~ tau>
and let the offset between clock i and clock j at that epoch be <$ET sub
ij (t sub 0~+~ tau )>, defined as
<$ET sub ij (t sub 0~+~ tau )~==~T sub i (t sub 0~+~ tau )~-~T sub j (t
sub 0~+~ tau )> .
Note that <$ET sub ij~=~- T sub ji> and <$ET sub ii~=~0>. Let <$Ew sub i
( tau )> be a previously determined weight factor associated with the
ith clock for the nominal interval <$Etau>. The basis for new estimates
at epoch <$Et sub 0~+~ tau > is
<$ET sub j (t sub 0~+~tau )~=~sum from {i=1} to n w sub i ( tau )[ T hat
sub i (t sub 0~+~tau )~+~T sub ji (t sub 0~+~tau )].>
That is, the apparent time indicated by the jth clock is a weighted
average of the estimated time of each clock at epoch <$Et sub 0 ~+~ tau>
plus the time offset measured between the jth clock and that clock at
epoch <$Et sub 0 ~+~ tau>.
An intuitive grasp of the behavior of this algorithm can be gained with
the aid of a few examples. For instance, if <$Ew sub i ( tau )> is unity
for the ith clock and zero for all others, the apparent time for each of
the other clocks is simply the estimated time <$ET hat sub i (t sub
0~+~tau )>. If <$Ew sub i ( tau )> is zero for the ith clock, that clock
can never affect any other clock and its apparent time is determined
entirely from the other clocks. If <$Ew sub i ( tau )~=~1 / n> for all
i, the apparent time of the ith clock is equal to the average of the
time estimates computed at t0 plus the average of the time offsets
measured to all other clocks. Finally, in a system with two clocks and
<$Ew sub i ( tau )~=~1 / 2> for each, and if the estimated time at epoch
<$Et sub 0~+~tau> is fast by 1 s for one clock and slow by 1 s for the
other, the apparent time for both clocks will coincide with the standard
timescale.
In order to establish a basis for the next interval <$Etau>, it is
necessary to update the frequency estimate <$ER hat sub i (t sub 0~+~tau
)> and weight factor <$Ew sub i ( tau )>. The average frequency assumed
for the ith clock during the previous interval <$Etau> is simply the
difference between the times at the beginning and end of the interval
divided by <$Etau>. A good estimator for <$ER sub i (t sub 0~+~tau )>
has been found to be the exponential average of these differences, which
is given by
<$ER hat sub i (t sub 0~+~tau )~=~R hat sub i (t sub 0 )~+~alpha sub i [
R hat sub i (t sub 0 )~-~{T sub i (t sub 0~+~tau )~-~T sub i (t sub 0 )}
over tau ]> ,
where <$Ealpha sub i> is an experimentally determined weight factor
which depends on the estimated frequency error of the ith clock. In
order to calculate the weight factor <$Ew sub i ( tau )>, it is
necessary to determine the expected error <$Eepsilon sub i ( tau )> for
each clock. In the following, braces <169>|<170> indicate absolute value
and brackets <169><<>><170> indicate the infinite time average. In
practice, the infinite averages are computed as exponential time
averages. An estimate of the magnitude of the unbiased error of the ith
clock accumulated over the nominal interval <$Etau> is
<$Eepsilon sub i ( tau )~=~| T hat sub i ( t sub 0~+~tau )~-~T sub i ( t
sub 0~+~tau ) |~+~{0.8~<<~epsilon sub e sup 2 ( tau )~>> } over sqrt {
<<~epsilon sub i sup 2 ( tau )~>> }> ,
where <$Eepsilon sub i ( tau )> and <$Eepsilon sub e ( tau )> are the
accumulated error of the ith clock and entire clock ensemble,
respectively. The accumulated error of the entire ensemble is
<$E<<~epsilon sub e sup 2 ( tau )~>>~=~left [ sum from i=1 to n~1 over {
<<~epsilon sub i sup 2 ( tau )~>> } right ] sup {~-1}>.
Finally, the weight factor for the ith clock is calculated as
<$Ew sub i ( tau )~=~ { <<~epsilon sub e sup 2 ( tau )~>> } over {
<<~epsilon sub i sup 2 ( tau )~>> }> .
When all estimators and weight factors have been updated, the origin of
the estimation interval is shifted and the new value of t0 becomes the
old value of <$Et sub 0 ~+~ tau>.
While not entering into the above calculations, it is useful to estimate
the frequency error, since the ensemble clocks can be located some
distance from each other and become isolated for some time due to
network failures. The frequency-offset error in Ri is equivalent to the
fractional frequency yi,
<$Ey sub i~=~{ nu sub i~-~nu sub I } over nu sub I>
measured between the ith timescale and the standard timescale I.
Temporarily dropping the subscript i for clarity, consider a sequence of
N independent frequency-offset samples <$Ey(j)~ (j~=~1,~2,~... ,~N)>
where the interval between samples is uniform and equal to T. Let
<$Etau> be the nominal interval over which these samples are averaged.
The Allan variance <$Esigma sub y sup 2 ( N,~T,~tau )> [ALL74a] is
defined as
<$E<< sigma sub y sup 2 ( N,~T,~tau )~>>~=~<< ~ 1 over { N~-~1 }~ left [
sum from j=1 to N~y (j) sup 2~-~1 over N~left ( sum from j=1 to N~y(j)
right ) sup 2 right ]~>>> ,
A particularly useful formulation is <$EN~=~2> and <$ET~=~tau>:
<$E<< sigma sub y sup 2 (N~=~2,~T~=~tau ,~tau )>>~==~sigma sub y sup 2 (
tau )~=~<< {[y(j~+~1)~-~y(j)] sup 2 } over 2 >>> ,
so that
<$Esigma sub y sup 2 ( tau )~=~1 over {2(N~-~1)}sum from { j = 1 } to
{n-1 }~[y(j~+~1)~-~y(j)] sup 2> .
While the Allan variance has found application when estimating errors in
ensembles of cesium clocks, its application to NTP is limited due to the
computation and storage burden. As described in the next section, it is
possible to estimate errors with some degree of confidence using normal
byproducts of NTP processing algorithms.
Application to NTP
The NTP clock model is somewhat less complex than the general model
described above. For instance, at the present level of development it is
not necessary to separately estimate the time and frequency of all peer
clocks, only the time and frequency of the local clock. If the
timekeeping reference is the local clock itself, then the offsets
available in the peer.offset peer variables can be used directly for the
<$ET sub ij> quantities above. In addition, the NTP local-clock model
incorporates a type-II phase-locked loop, which itself reliably
estimates frequency errors and corrects accordingly. Thus, the
requirement for estimating frequency is entirely eliminated.
There remains the problem of how to determine a robust and easily
computable error estimate <$Eepsilon sub i>. The method described above,
although analytically justified, is most difficult to implement.
Happily, as a byproduct of the NTP clock-filter algorithm, a useful
error estimate is available in the form of the dispersion. As described
in the NTP specification, the dispersion includes the absolute value of
the weighted average of the offsets between the chosen offset sample and
the <$En~-~1> other samples retained for selection. The effectiveness of
this estimator was compared with the above estimator by simulation using
observed timekeeping data and found to give quite acceptable results.
The NTP clock-combining algorithm can be implemented with only minor
modifications to the algorithms as described in the NTP specification.
Although elsewhere in the NTP specification the use of general-purpose
multiply/divide routines has been successfully avoided, there seems to
be no way to avoid them in the clock-combining algorithm. However, for
best performance the local-clock algorithm described elsewhere in this
document should be implemented as well, since the combining algorithms
result in a modest increase in phase noise which the revised local-clock
algorithm is designed to suppress.
Clock-Combining Procedure
The result of the NTP clock-selection procedure is a set of survivors
(there must be at least one) that represent truechimers, or correct
clocks. When clock combining is not implemented, one of these peers,
chosen as the most likely candidate, becomes the synchronization source
and its computed offset becomes the final clock correction.
Subsequently, the system variables are adjusted as described in the NTP
clock-update procedure. When clock combining is implemented, these
actions are unchanged, except that the final clock correction is
computed by the clock-combining procedure.
The clock-combining procedure is called from the clock-select procedure.
It constructs from the variables of all surviving peers the final clock
correction <$ETHETA>. The estimated error required by the algorithms
previously described is based on the synchronization distance <$ELAMBDA>
computed by the distance procedure, as defined in the NTP specification.
The reciprocal of <$ELAMBDA> is the weight of each clock-offset
contribution to the final clock correction. The following pseudo-code
describes the procedure.
begin clock-combining procedure
<$Etemp1~<<-~0>;
<$Etemp2~<<-~0>;
for (each peer remaining on the candidate list) /* scan
all survivors */
<$ELAMBDA~<<-~roman distance (peer)>;
<$Etemp~<<-~1 over roman
{peer.stratum~times~NTP.MAXDISPERSE~+~LAMBDA }>;
<$Etemp1~<<-~temp1~+~temp>; /* update weight
and offset */
<$Etemp2~<<-~temp2~+~temp~times~roman peer.offset>;
endif;
<$ETHETA~<<-~temp2 over temp1>;
/* compute final correction */
end clock-combining procedure;
The value <$ETHETA> is the final clock correction used by the local-
clock procedure to adjust the clock.
Appendix G. Computer Clock Modelling and Analysis
A computer clock includes some kind of reference oscillator, which is
stabilized by a quartz crystal or some other means, such as the power
grid. Usually, the clock includes a prescaler, which divides the
oscillator frequency to a standard value, such as 1 MHz or 100 Hz, and a
counter, implemented in hardware, software or some combination of the
two, which can be read by the processor. For systems intended to be
synchronized to an external source of standard time, there must be some
means to correct the phase and frequency by occasional vernier
adjustments produced by the timekeeping protocol. Special care is
necessary in all timekeeping system designs to insure that the clock
indications are always monotonically increasing; that is, system time
never <169>runs backwards.<170>
Computer Clock Models
The simplest computer clock consists of a hardware latch which is set by
overflow of a hardware counter or prescaler, and causes a processor
interrupt or tick. The latch is reset when acknowledged by the
processor, which then increments the value of a software clock counter.
The phase of the clock is adjusted by adding periodic corrections to the
counter as necessary. The frequency of the clock can be adjusted by
changing the value of the increment itself, in order to make the clock
run faster or slower. The precision of this simple clock model is
limited to the tick interval, usually in the order of 10 ms; although in
some systems the tick interval can be changed using a kernel variable.
This software clock model requires a processor interrupt on every tick,
which can cause significant overhead if the tick interval is small, say
in the order less 1 ms with the newer RISC processors. Thus, in order to
achieve timekeeping precisions less than 1 ms, some kind of hardware
assist is required. A straightforward design consists of a voltage-
controlled oscillator (VCO), in which the frequency is controlled by a
buffered, digital/analog converter (DAC). Under the assumption that the
VCO tolerance is 10-4 or 100 parts-per-million (ppm) (a reasonable value
for inexpensive crystals) and the precision required is 100 <$Emu roman
s> (a reasonable goal for a RISC processor), the DAC must include at
least ten bits.
A design sketch of a computer clock constructed entirely of hardware
logic components is shown in Figure 10a<$&fig10>. The clock is read by
first pulsing the read signal, which latches the current value of the
clock counter, then adding the contents of the clock-counter latch and a
64-bit clock-offset variable, which is maintained in processor memory.
The clock phase is adjusted by adding a correction to the clock-offset
variable, while the clock frequency is adjusted by loading a correction
to the DAC latch. In principle, this clock model can be adapted to any
precision by changing the number of bits of the prescaler or clock
counter or changing the VCO frequency. However, it does not seem useful
to reduce precision much below the minimum interrupt latency, which is
in the low microseconds for a modern RISC processor.
If it is not possible to vary the oscillator frequency, which might be
the case if the oscillator is an external frequency standard, a design
such as shown in Figure 10b may be used. It includes a fixed-frequency
oscillator and prescaler which includes a dual-modulus swallow counter
that can be operated in either divide-by-10 or divide-by-11 modes as
controlled by a pulse produced by a programmable divider (PD). The PD is
loaded with a value representing the frequency offset. Each time the
divider overflows a pulse is produced which switches the swallow counter
from the divide-by-10 mode to the divide-by-11 mode and then back again,
which in effect <169>swallows<170> or deletes a single pulse of the
prescaler pulse train.
The pulse train produced by the prescaler is controlled precisely over a
small range by the contents of the PD. If programmed to emit pulses at a
low rate, relatively few pulses are swallowed per second and the
frequency counted is near the upper limit of its range; while, if
programmed to emit pulses at a high rate, relatively many pulses are
swallowed and the frequency counted is near the lower limit. Assuming
some degree of freedom in the choice of oscillator frequency and
prescaler ratios, this design can compensate for a wide range of
oscillator frequency tolerances.
In all of the above designs it is necessary to limit the amount of
adjustment incorporated in any step to insure that the system clock
indications are always monotonically increasing. With the software clock
model this is assured as long as the increment is never negative. When
the magnitude of a phase adjustment exceeds the tick interval (as
corrected for the frequency adjustment), it is necessary to spread the
adjustments over mulitple tick intervals. This strategy amounts to a
deliberate frequency offset sustained for an interval equal to the total
number of ticks required and, in fact, is a feature of the Unix clock
model discussed below.
In the hardware clock models the same considerations apply; however, in
these designs the tick interval amounts to a single pulse at the
prescaler output, which may be in the order of 1 ms. In order to avoid
decreasing the indicated time when a negative phase correction occurs,
it is necessary to avoid modifying the clock-offset variable in
processor memory and to confine all adjustments to the VCO or prescaler.
Thus, all phase adjustments must be performed by means of programmed
frequency adjustments in much the same way as with the software clock
model described previously.
It is interesting to conjecture on the design of a processor assist that
could provide all of the above functions in a compact, general-purpose
hardware interface. The interface might consist of a multifunction timer
chip such as the AMD 9513A, which includes five 16-bit counters, each
with programmable load and hold registers, plus an onboard crystal
oscillator, prescaler and control circuitry. A 48-bit hardware clock
counter would utilize three of the 16-bit counters, while the fourth
would be used as the swallow counter and the fifth as the programmable
divider. With the addition of a programmable-array logic device and
architecture-specific host interface, this compact design could provide
all the functions necessary for a comprehensive timekeeping system.
The Fuzzball Clock Model
The Fuzzball clock model uses a combination of hardware and software to
provide precision timing with a minimum of software and processor
overhead. The model includes an oscillator, prescaler and hardware
counter; however, the oscillator frequency remains constant and the
hardware counter produces only a fraction of the total number of bits
required by the clock counter. A typical design uses a 64-bit software
clock counter and a 16-bit hardware counter which counts the prescaler
output. A hardware-counter overflow causes the processor to increment
the software counter at the bit corresponding to the frequency <$E2 sup
N f sub p>, where N is the number of bits of the hardware counter and fp
is the counted frequency at the prescaler output. The processor reads
the clock counter by first generating a read pulse, which latches the
hardware counter, and then adding its contents, suitably aligned, to the
software counter.
The Fuzzball clock can be corrected in phase by adding a (signed)
adjustment to the software clock counter. In practice, this is done only
when the local time is substantially different from the time indicated
by the clock and may violate the monotonicity requirement. Vernier phase
adjustments determined in normal system operation must be limited to no
more than the period of the counted frequency, which is 1 kHz for LSI-11
Fuzzballs. In the Fuzzball model these adjustments are performed at
intervals of 4 s, called the adjustment interval, which provides a
maximum frequency adjustment range of 250 ppm. The adjustment
opportunities are created using the interval-timer facility, which is a
feature of most operating systems and independent of the time-of-day
clock. However, if the counted frequency is increased from 1 kHz to 1
MHz for enhanced precision, the adjustment frequency must be increased
to 250 Hz, which substantially increases processor overhead. A modified
design suitable for high precision clocks is presented in the next
section.
In some applications involving the Fuzzball model, an external pulse-
per-second (pps) signal is available from a reference source such as a
cesium clock or GPS receiver. Such a signal generally provides much
higher accuracy than the serial character string produced by a radio
timecode receiver, typically in the low nanoseconds. In the Fuzzball
model this signal is processed by an interface which produces a hardware
interrupt coincident with the arrival of the pps pulse. The processor
then reads the clock counter and computes the residual modulo 1 s of the
clock counter. This represents the local-clock error relative to the pps
signal.
Assuming the seconds numbering of the clock counter has been determined
by a reliable source, such as a timecode receiver, the offset within the
second is determined by the residual computed above. In the NTP local-
clock model the timecode receiver or NTP establishes the time to within
<F128M>æ<F255D>128 ms, called the aperture, which guarantees the seconds
numbering to within the second. Then, the pps residual can be used
directly to correct the oscillator, since the offset must be less than
the aperture for a correctly operating timecode receiver and pps signal.
The above technique has an inherent error equal to the latency of the
interrupt system, which in modern RISC processors is in the low tens of
microseconds. It is possible to improve accuracy by latching the
hardware time-of-day counter directly by the pps pulse and then reading
the counter in the same way as usual. This requires additional circuitry
to prioritize the pps signal relative to the pulse generated by the
program to latch the counter.
The Unix Clock Model
The Unix 4.3bsd clock model is based on two system calls, settimeofday
and adjtime, together with two kernel variables tick and tickadj. The
settimeofday call unceremoniously resets the kernel clock to the value
given, while the adjtime call slews the kernel clock to a new value
numerically equal to the sum of the present time of day and the (signed)
argument given in the adjtime call. In order to understand the behavior
of the Unix clock as controlled by the Fuzzball clock model described
above, it is helpful to explore the operations of adjtime in more
detail.
The Unix clock model assumes an interrupt produced by an onboard
frequency source, such as the clock counter and prescaler described
previously, to deliver a pulse train in the 100-Hz range. In priniciple,
the power grid frequency can be used, although it is much less stable
than a crystal oscillator. Each interrupt causes an increment called
tick to be added to the clock counter. The value of the increment is
chosen so that the clock counter, plus an initial offset established by
the settimeofday call, is equal to the time of day in microseconds.
The Unix clock can actually run at three different rates, one
corresponding to tick, which is related to the intrinsic frequency of
the particular oscillator used as the clock source, one to
<$Etick~+~tickadj> and the third to <$Etick~-~tickadj>. Normally the
rate corresponding to tick is used; but, if adjtime is called, the
argument <$Edelta> given is used to calculate an interval <$EDELTA
t~=~delta~tick over tickadj> during which one or the other of the two
rates are used, depending on the sign of <$Edelta>. The effect is to
slew the clock to a new value at a small, constant rate, rather than
incorporate the adjustment all at once, which could cause the clock to
be set backward. With common values of <$Etick~=~10> ms and
<$Etickadj~=~5~mu roman s>, the maximum frequency adjustment range is
<$E+- tickadj over tick~=~+- {5~roman x~10 sup -6} over {10 sup -2}> or
<F128M>æ<F255D>500 ppm. Even larger ranges may be required in the case
of some workstations (e.g., SPARCstations) with extremely poor component
tolerances.
When precisions not less than about 1 ms are required, the Fuzzball
clock model can be adapted to the Unix model by software simulation, as
described in Section 5 of the NTP specification, and calling adjtime at
each adjustment interval. When precisions substantially better than this
are required, the hardware microsecond clock provided in some
workstations can be used together with certain refinements of the
Fuzzball and Unix clock models. The particular design described below is
appropriate for a maximum oscillator frequency tolerance of 100 ppm
(.01%), which can be obtained using a relatively inexpensive quartz
crystal oscillator, but is readily scalable for other assumed
tolerances.
The clock model requires the capability to slew the clock frequency over
the range <F128M>æ<F255D>100 ppm with an intrinsic oscillator frequency
error as great as <F128M>æ<F255D>100 ppm. Figure 11<$&fig11> shows the
timing relationships at the extremes of the requirements envelope.
Starting from an assumed offset of nominal zero and an assumed error of
+100 ppm at time 0 s, the line AC shows how the uncorrected offset grows
with time. Let <$Esigma> represent the adjustment interval and a the
interval AB, in seconds, and let r be the slew, or rate at which
corrections are introduced, in ppm. For an accuracy specification of 100
<$Emu roman s>, then
<$Esigma~<<=~{100~mu roman s} over {100~roman ppm}~+~{100~mu roman s}
over {(r~-~100)~roman ppm}~=~r over {r~-~100}> .
The line AE represents the extreme case where the clock is to be steered
<F128M>-<F255D>100 ppm. Since the slew must be complete at the end of
the adjustment interval,
<$Ea~<<=~{(r~-~200)~sigma} over r>.
These relationships are satisfied only if <$Er~>>~200~roman ppm> and
<$Esigma~<<~2~roman s>. Using <$Er~=~300~roman ppm> for convenience,
<$Esigma~=~1.5~roman s> and <$Ea~<<=~0.5~roman s>. For the Unix clock
model with <$Etick~=~10~roman ms>, this results in the value of
<$Etickadj~=~3~mu roman s>.
One of the assumptions made in the Unix clock model is that the period
of adjustment computed in the adjtime call must be completed before the
next call is made. If not, this results in an error message to the
system log. However, in order to correct for the intrinsic frequency
offset of the clock oscillator, the NTP clock model requires adjtime to
be called at regular adjustment intervals of <$Esigma> s. Using the
algorithms described here and the architecture constants in the NTP
specification, these adjustments will always complete.
Mathematical Model of the NTP Logical Clock
The NTP logical clock can be represented by the feedback-control model
shown in Figure 12<$&fig12>. The model consists of an adaptive-
parameter, phase-lock loop (PLL), which continuously adjusts the phase
and frequency of an oscillator to compensate for its intrinsic jitter,
wander and drift. A mathematical analysis of this model developed along
the lines of [SMI86] is presented in following sections, along with a
design example useful for implementation guidance in operating-systems
environments such as Unix and Fuzzball. Table 9<$&tab9> summarizes the
quantities ordinarily treated as variables in the model. By convention,
<$Ev> is used for internal loop variables, <$Etheta> for phase,
<$Eomega> for frequency and <$Etau> for time. Table 10<$&tab10>
summarizes those quantities ordinarily fixed as constants in the model.
Note that these are all expressed as a power of two in order to simplify
the implementation.
In Figure 12 the variable <$Etheta sub r> represents the phase of the
reference signal and <$Etheta sub o> the phase of the voltage-controlled
oscillator (VCO). The phase detector (PD) produces a voltage <$Ev sub d>
representing the phase difference <$Etheta sub r~-~theta sub o> . The
clock filter functions as a tapped delay line, with the output <$Ev sub
s> taken at the tap selected by the clock-filter algorithm described in
the NTP specification. The loop filter, represented by the equations
given below, produces a VCO correction voltage <$Ev sub c>, which
controls the oscillator frequency and thus the phase <$Etheta sub o>.
The PLL behavior is completely determined by its open-loop, Laplace
transfer function <$EG(s)> in the s domain. Since both frequency and
phase corrections are required, an appropriate design consists of a
type-II PLL, which is defined by the function
<$EG(s)~=~{omega sub c sup 2} over {tau sup 2 s sup 2}~( 1 ~+~{tau s}
over omega sub z )> ,
where <$Eomega sub c> is the crossover frequency (also called loop
gain), <$Eomega sub z> is the corner frequency (required for loop
stability) and <$Etau> determines the PLL time constant and thus the
bandwidth. While this is a first-order function and some improvement in
phase noise might be gained from a higher-order function, in practice
the improvement is lost due to the effects of the clock-filter delay, as
described below.
The open-loop transfer function <$EG(s)> is constructed by breaking the
loop at point a on Figure 12 and computing the ratio of the output phase
<$Etheta sub o (s)> to the reference phase <$Etheta sub r (s)>. This
function is the product of the individual transfer functions for the
phase detector, clock filter, loop filter and VCO. The phase detector
delivers a voltage <$Ev sub d (t)~=~ theta sub r (t)>, so its transfer
function is simply <$EF sub d (s)~=~1>, expressed in V/rad. The VCO
delivers a frequency change <$EDELTA omega ~=~{roman d~theta sub o (t)}
over {roman dt}~=~alpha {v sub c (t)}>, where <$Ealpha> is the VCO gain
in rad/V-sec and <$Etheta sub o (t)~=~alpha~int v sub c (t)~dt>. Its
transfer function is the Laplace transform of the integral, <$EF sub o
(s)~=~alpha over s>, expressed in rad/V. The clock filter contributes a
stochastic delay due to the clock-filter algorithm; but, for present
purposes, this delay will be assumed a constant T, so its transfer
function is the Laplace transform of the delay, <$EF sub s (s)~=~e sup
{- Ts}>. Let <$EF(s)> be the transfer function of the loop filter, which
has yet to be determined. The open-loop transfer function <$EG(s)> is
the product of these four individual transfer functions:
<$EG(s)~=~{omega sub c sup 2} over {tau sup 2 s sup 2}~( 1 ~+~{tau s}
over omega sub z )~=~F sub d (s) F sub s (s) F(s) F sub o (s)~=~1e sup
{-Ts}~F(s)~alpha over s> .
For the moment, assume that the product <$ETs> is small, so that <$Ee
sup {-Ts}~approx ~1>. Making the following substitutions,
<$Eomega sub c sup 2~=~alpha over { K sub f}~~~~> and <$E~~~~omega sub
z~=~K sub g over {K sub f}>
and rearranging yields
<$EF(s)~=~1 over {K sub g~tau}~+~1 over {K sub f~tau sup 2 s }> ,
which corresponds to a constant term plus an integrating term scaled by
the PLL time constant <$Etau>. This form is convenient for
implementation as a sampled-data system, as described later.
With the parameter values given in Table 10, the Bode plot of the open-
loop transfer function <$EG(s)> consists of a <196>12 dB/octave line
which intersects the 0-dB baseline at <$Eomega sub c~=~2 sup -12> rad/s,
together with a +6 dB/octave line at the corner frequency <$Eomega sub
z~=~2 sup -14> rad/s. The damping factor <$Ezeta~=~omega sub c over {2
omega sub z}~=~2> suggests the PLL will be stable and have a large phase
margin together with a low overshoot. However, if the clock-filter delay
T is not small compared to the loop delay, which is approximately equal
to <$E1 over omega sub c>, the above analysis becomes unreliable and the
loop can become unstable. With the values determined as above, T is
ordinarily small enough to be neglected.
Assuming the output is taken at <$Ev sub s>, the closed-loop transfer
function <$EH(s)> is
<$EH(s)~==~{v sub s (s)} over {theta sub r (s)}~=~{F sub d (s) e sup {-
Ts}} over {1~+~G(s)}> .
If only the relative response is needed and the clock-filter delay can
be neglected, <$EH(s)> can be written
<$EH(s)~=~1 over {1~+~G(s)}~=~s sup 2 over {s sup 2~+~omega sub c sup 2
over {omega sub z~tau} s~+~omega sub c sup 2 over tau sup 2}> .
For some input function <$EI(s)> the output function <$EI(s)H(s)> can be
inverted to find the time response. Using a unit-step input <$EI(s)~=~1
over s> and the values determined as above, This yields a PLL risetime
of about 52 minutes, a maximum overshoot of about 4.8 percent in about
1.7 hours and a settling time to within one percent of the initial
offset in about 8.7 hours.
Parameter Management
A very important feature of the NTP PLL design is the ability to adapt
its behavior to match the prevailing stability of the local oscillator
and transmission conditions in the network. This is done using the
<$Ealpha> and <$Etau> parameters shown in Table 10. Mechanisms for doing
this are described in following sections.
Adjusting VCO Gain (<$Ebold alpha>)
The <$Ealpha> parameter is determined by the maximum frequency tolerance
of the local oscillator and the maximum jitter requirements of the
timekeeping system. This parameter is usually an architecture constant
and fixed during system operation. In the implementation model described
below, the reciprocal of <$Ealpha>, called the adjustment interval
<$Esigma>, determines the time between corrections of the local clock,
and thus the value of <$Ealpha>. The value of <$Esigma> can be
determined by the following procedure.
The maximum frequency tolerance for board-mounted, uncompensated quartz-
crystal oscillators is probably in the range of 10-4 (100 ppm). Many if
not most Internet timekeeping systems can tolerate jitter to at least
the order of the intrinsic local-clock resolution, called precision in
the NTP specification, which is commonly in the range from one to 20 ms.
Assuming 10-3 s peak-to-peak as the most demanding case, the interval
between clock corrections must be no more than <$Esigma~=~10 sup -3 over
{2 roman~x~10 sup -4}~=~5> sec. For the NTP reference model
<$Esigma~=~4> sec in order to allow for known features of the Unix
operating-system kernel. However, in order to support future anticipated
improvements in accuracy possible with faster workstations, it may be
useful to decrease <$Esigma> to as little as one-tenth the present
value.
Note that if <$Esigma> is changed, it is necessary to adjust the
parameters <$EK sub f> and <$EK sub g> in order to retain the same loop
bandwidth; in particular, the same <$Eomega sub c> and <$Eomega sub z>.
Since <$Ealpha> varies as the reciprocal of <$Esigma>, if <$Esigma> is
changed to something other than 22, as in Table 10, it is necessary to
divide both <$EK sub f> and <$EK sub g> by <$Esigma over 4> to obtain
the new values.
Adjusting PLL Bandwidth (<$Ebold tau>)
A key feature of the type-II PLL design is its capability to compensate
for the intrinsic frequency errors of the local oscillator. This
requires a initial period of adaptation in order to refine the frequency
estimate (see later sections of this appendix). The <$Etau> parameter
determines the PLL time constant and thus the loop bandwidth, which is
approximately equal to <$E{omega sub c} over tau>. When operated with a
relatively large bandwidth (small <$Etau>), as in the analysis above,
the PLL adapts quickly to changes in the input reference signal, but has
poor long term stability. Thus, it is possible to accumulate substantial
errors if the system is deprived of the reference signal for an extended
period. When operated with a relatively small bandwidth (large <$Etau>),
the PLL adapts slowly to changes in the input reference signal, and may
even fail to lock onto it. Assuming the frequency estimate has
stabilized, it is possible for the PLL to coast for an extended period
without external corrections and without accumulating significant error.
In order to achieve the best performance without requiring individual
tailoring of the loop bandwidth, it is necessary to compute each value
of <$Etau> based on the measured values of offset, delay and dispersion,
as produced by the NTP protocol itself. The traditional way of doing
this in precision timekeeping systems based on cesium clocks, is to
relate <$Etau> to the Allan variance, which is defined as the mean of
the first-order differences of sequential samples measured during a
specified interval <$Etau>,
<$Esigma sub y sup 2 ( tau )~=~1 over {2(N~-~1)}sum from { i = 1 } to
{N-1 }~[y(i~+~1)~-~y(i)] sup 2> ,
where y is the fractional frequency measured with respect to the local
timescale and N is the number of samples.
In the NTP local-clock model the Allan variance (called the compliance,
h in Table 11) is approximated on a continuous basis by exponentially
averaging the first-order differences of the offset samples using an
empirically determined averaging constant. Using somewhat ad-hoc mapping
functions determined from simulation and experience, the compliance is
manipulated to produce the loop time constant and update interval.
The NTP Clock Model
The PLL behavior can also be described by a set of recurrence equations,
which depend upon several variables and constants. The variables and
parameters used in these equations are shown in Tables 9, 10 and
11<$&tab11>. Note the use of powers of two, which facilitates
implementation using arithmetic shifts and avoids the requirement for a
multiply/divide capability.
A capsule overview of the design may be helpful in understanding how it
operates. The logical clock is continuously adjusted in small increments
at fixed intervals of <$Esigma>. The increments are determined while
updating the variables shown in Tables 9 and 11, which are computed from
received NTP messages as described in the NTP specification. Updates
computed from these messages occur at discrete times as each is
received. The intervals <$Emu> between updates are variable and can
range up to about 17 minutes. As part of update processing the
compliance h is computed and used to adjust the PLL time constant
<$Etau>. Finally, the update interval <$Erho> for transmitted NTP
messages is determined as a fixed multiple of <$Etau>.
Updates are numbered from zero, with those in the neighborhood of the
ith update shown in Figure 13<$&fig13>. All variables are initialized at
<$Ei~=~0> to zero, except the time constant <$Etau (0)~=~tau>, poll
interval <$Emu (0)~=~tau> (from Table 10) and compliance <$Eh (0)~=~K
sub s>. After an interval <$Emu (i)> (<$Ei~>>~0>) from the previous
update the ith update arrives at time <$Et(i)> including the time
offset <$Ev sub s (i)>. Then, after an interval <$Emu (i~+~1)> the
<$Ei+1 roman th> update arrives at time <$Et(i~+~1)> including the time
offset <$Ev sub s (i~+~1)>. When the update <$Ev sub s (i)> is received,
the frequency error <$Ef(i~+~1)> and phase error <$Eg(i~+~1)> are
computed:
<$Ef(i~+~1)~=~f(i)~+~{mu (i) v sub s (i)} over {tau (i) sup 2 }>
,<$E~~~~~g(i~+~1)~=~{v sub s (i)} over {tau (i)}> .
Note that these computations depend on the value of the time constant
<$Etau (i)> and poll interval <$Emu (i)> previously computed from the
<$Ei-1 roman th> update. Then, the time constant for the next interval
is computed from the current value of the compliance <$Eh(i)>
<$Etau (i~+~1)~=~roman max [K sub s~-~|~h(i)|,~1]> .
Next, using the new value of <$Etau>, called <$Etau prime> to avoid
confusion, the poll interval is computed
<$Erho (i~+~1)~=~K sub u~tau prime> .
Finally, the compliance <$Eh(i~+~1)> is recomputed for use in the <$Ei+1
roman th> update:
<$Eh(i~+~1)~=~h(i)~+~{K sub t~tau prime v sub s (i)~-~h(i) }over K sub
h> .
The factor <$Etau prime> in the above has the effect of adjusting the
bandwidth of the PLL as a function of compliance. When the compliance
has been low over some relatively long period, <$Etau prime> is
increased and the bandwidth is decreased. In this mode small timing
fluctuations due to jitter in the network are suppressed and the PLL
attains the most accurate frequency estimate. On the other hand, if the
compliance becomes high due to greatly increased jitter or a systematic
frequency offset, <$Etau prime> is decreased and the bandwidth is
increased. In this mode the PLL is most adaptive to transients which can
occur due to reboot of the system or a major timing error. In order to
maintain optimum stability, the poll interval <$Erho> is varied directly
with <$Etau>.
A model suitable for simulation and parameter refinement can be
constructed from the above recurrence relations. It is convenient to set
the temporary variable <$Ea~=~g(i~+~1)>. At each adjustment interval
<$Esigma> the quantity <$Ea over K sub g~+~{f(i~+~1)} over K sub f> is
added to the local-clock phase and the quantity <$Ea over K sub g> is
subtracted from a. For convenience, let n be the greatest integer in
<$E{mu (i)} over sigma>; that is, the number of adjustments that occur
in the ith interval. Thus, at the end of the ith interval just before
the <$Ei+1 roman th> update, the VCO control voltage is:
<$Ev sub c (i~+~1)~=~v sub c (i)~+~{[1~-~(1~-~1 over K sub g ) sup n
]}~{g(i~+~1)} ~+~n over {K sub f }~{ f(i~+~1)}~.>
Detailed simulation of the NTP PLL with the values specified in Tables
9, 10 and 11 and the clock filter described in the NTP specification
results in the following characteristics: For a 100-ms phase change the
loop reaches zero error in 39 minutes, overshoots 7 ms at 54 minutes and
settles to less than 1 ms in about six hours. For a 50-ppm frequency
change the loop reaches 1 ppm in about 16 hours and 0.1 ppm in about 26
hours. When the magnitude of correction exceeds a few milliseconds or a
few ppm for more than a few updates, the compliance begins to increase,
which causes the loop time constant and update interval to decrease.
When the magnitude of correction falls below about 0.1 ppm for a few
hours, the compliance begins to decrease, which causes the loop time
constant and update interval to increase. The effect is to provide a
broad capture range exceeding 4 s per day, yet the capability to resolve
oscillator skew well below 1 ms per day. These characteristics are
appropriate for typical crystal-controlled oscillators with or without
temperature compensation or oven control.
Appendix H. Analysis of Errors and Correctness Principles
Introduction
This appendix contains an analysis of errors arising in the generation
and processing of NTP timestamps and the determination of delays and
offsets. It establishes error bounds as a function of measured roundtrip
delay and dispersion to the root (primary reference source) of the
synchronization subnet. It also discusses correctness assertions about
these error bounds and the time-transfer, filtering and selection
algorithms used in NTP.
The notation <$Ew~=~[u,~v]> in the following describes the interval in
which u is the lower limit and v the upper limit, inclusive. Thus,
<$Eu~=~min (w)~<<=~v~=~max (w)>, and for scalar a,
<$Ew~+~a~=~[u~+~a,~v~+~a]>. Table 12<$&tab12> shows a summary of other
notation used in the analysis. The notation <$E<<~x~>>> designates the
(infinite) average of x, which is usually approximated by an exponential
average, while the notation <$Ex hat> designates an estimator for x. The
lower-case Greek letters <$Etheta>, <$Edelta> and <$Eepsilon> are used
to designate measurement data for the local clock to a peer clock, while
the upper-case Greek letters <$ETHETA>, <$EDELTA> and <$EEPSILON> are
used to designate measurement data for the local clock relative to the
primary reference source at the root of the synchronization subnet.
Exceptions will be noted as they arise.
Timestamp Errors
The standard second (1 s) is defined as <169>9,192,631,770 periods of
the radiation corresponding to the transition between the two hyperfine
levels of the ground state of the cesium-133 atom<170> [ALL74b], which
implies a granularity of about 1.1x10-10 s. Other intervals can be
determined as rational multiples of 1 s. While NTP time has an inherent
resolution of about 2.3x10-10 s, local clocks ordinarily have
resolutions much worse than this, so the inherent error in resolving NTP
time relative to the 1 s can be neglected.
In this analysis the local clock is represented by a counter/divider
which increments at intervals of s seconds and is driven by an
oscillator which operates at frequency <$Ef sub c~=~n over s> for some
integer n. A timestamp <$ET(t)> is determined by reading the clock at an
arbitrary time t (the argument t will be usually omitted for
conciseness). Strictly speaking, s is not known exactly, but can be
assumed bounded from above by the maximum reading error <$Erho>. The
reading error itself is represented by the random variable r bounded by
the interval <$E[-~rho ,~0]>, where <$Erho> depends on the particular
clock implementation. Since the intervals between reading the same clock
are almost always independent of and much larger than s, successive
readings can be considered independent and identically distributed. The
frequency error of the clock oscillator is represented by the random
variable f bounded by the interval <$E[-~phi ,~phi ]>, where <$Ephi>
represents the maximum frequency tolerance of the oscillator throughout
its service life. While f for a particular clock is a random variable
with respect to the population of all clocks, for any one clock it
ordinarily changes only slowly with time and can usually be assumed a
constant for that clock. Thus, an NTP timestamp can be represented by
the random variable T:
<$ET~=~t~+~r~+~f tau> ,
where t represents a clock reading, <$Etau> represents the time interval
since this reading and minor approximations inherent in the measurement
of <$Etau> are neglected.
In order to assess the nature and expected magnitude of timestamp errors
and the calculations based on them, it is useful to examine the
characteristics of the probability density functions (pdf) <$Ep sub r
(x)> and <$Ep sub f (x)> for r and f respectively. Assuming the clock
reading and counting processes are independent, the pdf for r is uniform
over the interval <$E[-~rho ,~0]>. With conventional manufacturing
processes and temperature variations the pdf for f can be approximated
by a truncated, zero-mean Gaussian distribution with standard deviation
<$Esigma>. In conventional manufacturing processes <$Esigma> is
maneuvered so that the fraction of samples rejected outside the interval
<$E[-~phi ,~phi ]> is acceptable. The pdf for the total timestamp error
<$Eepsilon (x)> is thus the sum of the r and f contributions, computed
as
<$Eepsilon (x)~ =~ int~from {- inf } to inf p sub r (t) p sub f (x~-~t)
d t> ,
which appears as a bell-shaped curve, symmetric about <$E-~rho over 2>
and bounded by the interval
<$E[ min (r)~+~min (f tau ),~max (r)~+~max (f tau )]~=~[-~rho ~-~phi tau
,~phi tau ]> .
Since f changes only slowly over time for any single clock,
<$Eepsilon~==~[ min (r)~+~f tau ,~max (r)~+~f tau ]~=~ [-~ rho ,~0]~+~f
tau> ,
where <$Eepsilon> without argument designates the interval and
<$Eepsilon (x)> designates the pdf. In the following development
subscripts will be used on various quantities to indicate to which
entity or timestamp the quantity applies. Occasionally, <$Eepsilon> will
be used to designate an absolute maximum error, rather than the
interval, but the distinction will be clear from context.
Measurement Errors
In NTP the roundtrip delay and clock offset between two peers A and B
are determined by a procedure in which timestamps are exchanged via the
network paths between them. The procedure involves the four most recent
timestamps numbered as shown in Figure 14<$&fig14>, where the <$Etheta
sub 0> represents the true clock offset of peer B relative to peer A.
The <$ET sub 1> and <$ET sub 4> timestamps are determined relative to
the A clock, while the <$ET sub 2> and <$ET sub 3> timestamps are
determined relative to the B clock. The measured roundtrip delay
<$Edelta> and clock offset <$Etheta> of B relative to A are given by
<$Edelta~=~(T sub 4~-~T sub 1 )~-~(T sub 3~-~T sub 2
)~~~~and~~~~theta~=~{(T sub 2~-~T sub 1 )~+~(T sub 3~-~T sub 4 )} over
2> .
The errors inherent in determining the timestamps T1, T2, T3 and T4 are,
respectively,
<$Eepsilon sub 1~=~[-~rho sub A ,~0]>, <$E~epsilon sub 2~=~[-~rho sub B
,~0]>, <$E~epsilon sub 3~=~[-~rho sub B ,~0]~+~f sub B (T sub 3 ~-~T sub
2 )>, <$E~epsilon sub 4~=~[-~rho sub A ,~0]~+~f sub A (T sub 4 ~-~T sub
1 )> .
For specific peers A and B, where <$Ef sub A> and <$Ef sub B> can be
considered constants, the interval containing the maximum error inherent
in determining <$Edelta> is given by
<$E[ min ( epsilon sub 4 )~-~max ( epsilon sub 1 )~-~max ( epsilon sub 3
)~+~min ( epsilon sub 2 ),~ max ( epsilon sub 4 )~-~min ( epsilon sub 1
)~-~min ( epsilon sub 3 )~+~max ( epsilon sub 2 )]>
<$E=~[-~rho sub A~-~rho sub B ,~rho sub A ~+~rho sub B ]~+~f sub A (T
sub 4~-~T sub 1 )~-~f sub B (T sub 3~-~T sub 2 )> .
In the NTP local clock model the residual frequency errors <$Ef sub A>
and <$Ef sub B> are minimized through the use of a type-II phase-lock
loop (PLL). Under most conditions these errors will be small and can be
ignored. The pdf for the remaining errors is symmetric, so that <$Edelta
hat~=~<< delta >>> is an unbiased maximum-likelihood estimator for the
true roundtrip delay, independent of the particular values of <$Erho sub
A> and <$Erho sub B>.
However, in order to reliably bound the errors under all conditions of
component variation and operational regimes, the design of the PLL and
the tolerance of its intrinsic oscillator must be controlled so that it
is not possible under any circumstances for <$Ef sub A> or <$Ef sub B>
to exceed the bounds <$E[-~phi sub A ,~phi sub A ]> or <$E[-~phi sub B
,~phi sub B ]>, respectively. Setting <$Erho~=~max ( rho sub A ,~rho sub
B )> for convenience, the absolute maximum error <$Eepsilon sub delta>
inherent in determining roundtrip delay <$Edelta> is given by
<$Eepsilon sub delta~==~rho~+~phi sub A (T sub 4~-~T sub 1 )~+~phi sub B
(T sub 3~-~T sub 2 )> ,
neglecting residuals.
As in the case for <$Edelta>, where <$Ef sub A> and <$Ef sub B> can be
considered constants, the interval containing the maximum error inherent
in determining <$Etheta> is given by
<$E{[ min ( epsilon sub 2 )~-~max ( epsilon sub 1 )~+~min ( epsilon sub
3 )~-~max ( epsilon sub 4 ),~ max ( epsilon sub 2 )~-~min ( epsilon sub
1 )~+~max ( epsilon sub 3 )~-~min ( epsilon sub 4 )]} over 2>
<$E=~[ -~rho sub B ,~rho sub A ]~+~{f sub B (T sub 3~-~T sub 2 )~-~f sub
A (T sub 4 ~-~T sub 1 )} over 2> .
Under most conditions the errors due to <$Ef sub A> and <$Ef sub B> will
be small and can be ignored. If <$Erho sub A~=~rho sub B~=~rho>; that
is, if both the A and B clocks have the same resolution, the pdf for the
remaining errors is symmetric, so that <$Etheta hat~=~<< theta >>> is an
unbiased maximum-likelihood estimator for the true clock offset <$Etheta
sub 0>, independent of the particular value of <$Erho>. If <$Erho sub
A~!=~rho sub B>, <$E<< theta >>> is not an unbiased estimator; however,
the bias error is in the order of
<$E{rho sub A~-~rho sub B } over 2> .
and can usually be neglected.
Again setting <$Erho~=~max ( rho sub A ,~rho sub B )> for convenience,
the absolute maximum error <$Eepsilon sub theta> inherent in determining
clock offset <$Etheta> is given by
<$Eepsilon sub theta~==~{rho~+~phi sub A (T sub 4~-~T sub 1 )~+~phi sub
B (T sub 3~-~T sub 2 )} over 2 > .
Network Errors
In practice, errors due to stochastic network delays usually dominate.
In general, it is not possible to characterize network delays as a
stationary random process, since network queues can grow and shrink in
chaotic fashion and arriving customer traffic is frequently bursty.
However, it is a simple exercise to calculate bounds on clock offset
errors as a function of measured delay. Let <$ET sub 2~-~T sub 1~=~a>
and <$ET sub 3~-~T sub 4~=~b>. Then,
<$Edelta~=~a~-~b~~~~ and ~~~~theta~=~{a~+~b} over 2> .
The true offset of B relative to A is called <$Etheta sub 0> in Figure
14. Let x denote the actual delay between the departure of a message
from A and its arrival at B. Therefore, <$Ex~+~theta sub 0~=~T sub 2~-~T
sub 1~==~a>. Since x must be positive in our universe, <$Ex~=~a~-~theta
sub 0~>>=~0>, which requires <$Etheta sub 0~<<=~a>. A similar argument
requires that <$Eb~<<=~theta sub 0>, so surely <$Eb~<<=~theta sub
0~<<=~a>. This inequality can also be expressed
<$Eb~=~{a~+~b} over 2~-~{a~-~b} over 2~<<=~theta sub 0~<<=~{a~+~b} over
2~+~{a~-~b} over 2~=~a> ,
which is equivalent to
<$Etheta~-~delta over 2~<<=~theta sub 0~<<=~theta~+~delta over 2> .
In the previous section bounds on delay and offset errors were
determined. Thus, the inequality can be written
<$Etheta~-~epsilon sub theta~-~{delta~+~epsilon sub delta} over
2~<<=~theta sub 0~<<=~theta~+~epsilon sub theta~+~{delta~+~ epsilon sub
delta } over 2> ,
where <$Eepsilon sub theta> is the maximum offset error and <$Eepsilon
sub delta> is the maximum delay error derived previously. The quantity
<$Eepsilon~=~epsilon sub theta~+~epsilon sub delta over 2~=~rho~+~phi
sub A (T sub 4~-~T sub 1 )~+~phi sub B (T sub 3~-~T sub 2 )> ,
called the peer dispersion, defines the maximum error in the inequality.
Thus, the correctness interval I can be defined as the interval
<$EI~=~[ theta~-~delta over 2~-~epsilon ,~theta~+~delta over 2~+~epsilon
]> ,
in which the clock offset <$EC~=~theta> is the midpoint. By
construction, the true offset <$Etheta sub 0> must lie somewhere in this
interval.
Inherited Errors
As described in the NTP specification, the NTP time server maintains the
local clock <$ETHETA>, together with the root roundtrip delay <$EDELTA>
and root dispersion <$EEPSILON> relative to the primary reference source
at the root of the synchronization subnet. The values of these variables
are either included in each update message or can be derived as
described in the NTP specification. In addition, the protocol exchange
and clock-filter algorithm provide the clock offset <$Etheta> and
roundtrip delay <$Edelta> of the local clock relative to the peer clock,
as well as various error accumulations as described below. The following
discussion establishes how errors inherent in the time-transfer process
accumulate within the subnet and contribute to the overall error budget
at each server.
An NTP measurement update includes three parts: clock offset <$Etheta>,
roundtrip delay <$Edelta> and maximum error or dispersion <$Eepsilon> of
the local clock relative to a peer clock. In case of a primary clock
update, these values are usually all zero, although <$Eepsilon> can be
tailored to reflect the specified maximum error of the primary reference
source itself. In other cases <$Etheta> and <$Edelta> are calculated
directly from the four most recent timestamps, as described in the NTP
specification. The dispersion <$Eepsilon> includes the following
contributions:
1.
Each time the local clock is read a reading error is incurred due to the
finite granularity or precision of the implementation. This is called
the measurement dispersion <$Erho>.
2.
Once an offset is determined, an error due to frequency offset or skew
accumulates with time. This is called the skew dispersion <$Ephi tau>,
where <$Ephi> represents the skew-rate constant (<$Eroman NTP.MAXSKEW
over NTP.MAXAGE> in the NTP specification) and <$Etau> is the interval
since the dispersion was last updated.
3
When a series of offsets are determined at regular intervals and
accumulated in a window of samples, as in the NTP clock-filter
algorithm, the (estimated) additional error due to offset sample
variance is called the filter dispersion <$Eepsilon sub sigma>.
4.
When a number of peers are considered for synchronization and two or
more are determined to be correctly synchronized to a primary reference
source, as in the NTP clock-selection algorithm, the (estimated)
additional error due to offset sample variance is called the selection
dispersion <$Eepsilon sub xi>.
Figure 15<$&fig15> shows how these errors accumulate in the ordinary
course of NTP processing. Received messages from a single peer are
represented by the packet variables. From the four most recent
timestamps T1, T2, T3 and T4 the clock offset and roundtrip delay sample
for the local clock relative to the peer clock are calculated directly.
Included in the message are the root roundtrip delay <$EDELTA prime> and
root dispersion <$EEPSILON prime> of the peer itself; however, before
sending, the peer adds the measurement dispersion <$Erho> and skew
dispersion <$Ephi tau>, where these quantities are determined by the
peer and <$Etau> is the interval according to the peer clock since its
clock was last updated.
The NTP clock-filter procedure saves the most recent samples <$Etheta
sub i> and <$Edelta sub i> in the clock filter as described in the NTP
specification. The quantities <$Erho> and <$Ephi> characterize the local
clock maximum reading error and frequency error, respectively. Each
sample includes the dispersion <$Eepsilon sub i~=~rho~+~phi (T sub 4~-~T
sub 1 )>, which is set upon arrival. Each time a new sample arrives all
samples in the filter are updated with the skew dispersion <$Ephi tau
sub i>, where <$Etau sub i> is the interval since the last sample
arrived, as recorded in the variable peer.update. The clock-filter
algorithm determines the selected clock offset <$Etheta> (peer.offset),
together with the associated roundtrip delay <$Edelta> (peer.delay) and
filter dispersion <$Eepsilon sub sigma>, which is added to the
associated sample dispersion <$Eepsilon sub i> to form the peer
dispersion <$Eepsilon> (peer.dispersion).
The NTP clock-selection procedure selects a single peer to become the
synchronization source as described in the NTP specification. The
operation of the algorithm determines the final clock offset <$ETHETA>
(local clock), roundtrip delay <$EDELTA> (sys.rootdelay) and dispersion
<$EEPSILON> (sys.rootdispersion) relative to the root of the
synchronization subnet, as shown in Figure 15. Note the inclusion of the
selected peer dispersion and skew accumulation since the dispersion was
last updated, as well as the select dispersion <$Eepsilon sub xi>
computed by the clock-select algorithm itself. Also, note that, in order
to preserve overall synchronization subnet stability, the final clock
offset <$ETHETA> is in fact determined from the offset of the local
clock relative to the peer clock, rather than the root of the subnet.
Finally, note that the packet variables <$EDELTA prime> and <$EEPSILON
prime> are in fact determined from the latest message received, not at
the precise time the offset selected by the clock-filter algorithm was
determined. Minor errors arising due to these simplifications will be
ignored. Thus, the total dispersion accumulation relative to the root of
the synchronization subnet is
<$EEPSILON~=~epsilon~+~phi tau~+~epsilon sub xi~+~| THETA |~+~EPSILON
prime > ,
where <$Etau> is the time since the peer variables were last updated and
<$E| THETA |> is the initial absolute error in setting the local clock.
The three values of clock offset, roundtrip delay and dispersion are all
additive; that is, if <$ETHETA sub i>, <$EDELTA sub i> and <$EEPSILON
sub i> represent the values at peer i relative to the root of the
synchronization subnet, the values
<$ETHETA sub j (t)~==~THETA sub i~+~theta sub j (t)> , <$EDELTA sub j
(t)~==~DELTA sub i~+~delta sub j> , <$EEPSILON sub j (t)~==~EPSILON
sub i~+~epsilon sub i~+~epsilon sub j (t)> ,
represent the clock offset, roundtrip delay and dispersion of peer j at
time t. The time dependence of <$Etheta sub j (t)> and <$Eepsilon sub j
(t)> represents the local-clock correction and dispersion accumulated
since the last update was received from peer i, while the term
<$Eepsilon sub i> represents the dispersion accumulated by peer i from
the time its clock was last set until the latest update was sent to peer
j. Note that, while the offset of the local clock relative to the peer
clock can be determined directly, the offset relative to the root of the
synchronization subnet is not directly determinable, except on a
probabilistic basis and within the bounds established in this and the
previous section.
The NTP synchronization subnet topology is that of a tree rooted at the
primary server(s). Thus, there is an unbroken path from every time
server to the primary reference source. Accuracy and stability are
proportional to synchronization distance <$ELAMBDA>, defined as
<$ELAMBDA~==~EPSILON~+~DELTA over 2> .
The selection algorithm favors the minimum-distance paths and thus
maximizes accuracy and stability. Since <$ETHETA sub 0>, <$EDELTA sub 0>
and <$EEPSILON sub 0> are all zero, the sum of the clock offsets,
roundtrip delays and dispersions of each server along the minimum-
distance path from the root of the synchronization subnet to a given
server i are the clock offset <$ETHETA sub i>, roundtrip delay <$EDELTA
sub i> and dispersion <$EEPSILON sub i> inherited by and characteristic
of that server.
Correctness Principles
In order to minimize the occurrence of errors due to incorrect clocks
and maximize the reliability of the service, NTP relies on multiple
peers and disjoint peer paths whenever possible. In the previous
development it was shown that, if the primary reference source at the
root of the synchronization subnet is in fact a correct clock, then the
true offset <$Etheta sub 0> relative to that clock must be contained in
the interval
<$E[ THETA~-~LAMBDA ,~THETA~+~LAMBDA ]~==~[ THETA~-~EPSILON~-~DELTA over
2 ,~THETA~+~EPSILON~+~DELTA over 2 ]> .
When a number of clocks are involved, it is not clear beforehand which
are correct and which are not; however, as cited previously, there are a
number of techniques based on clustering and filtering principles which
yield a high probability of detecting and discarding incorrect clocks.
Marzullo and Owicki [MAR85] devised an algorithm designed to find an
appropriate interval containing the correct time given the confidence
intervals of m clocks, of which no more than f are considered incorrect.
The algorithm finds the smallest single intersection containing all
points in at least <$Em~-~f> of the given confidence intervals.
Figure 16<$&fig16> illustrates the operation of this algorithm with a
scenario involving four clocks A, B, C and D, with the calculated time
(shown by the <F128>ì<F255> symbol) and confidence interval shown for
each. These intervals are computed as described in previous sections of
this appendix. For instance, any point in the A interval may possibly
represent the actual time associated with that clock. If all clocks are
correct, there must exist a nonempty intersection including all four
intervals; but, clearly this is not the case in this scenario. However,
if it is assumed that one of the clocks is incorrect (e.g., D), it might
be possible to find a nonempty intersection including all but one of the
intervals. If not, it might be possible to find a nonempty intersection
including all but two of the intervals and so on.
The algorithm proposed by DEC for use in the Digital Time Service
[DEC89] is based on these principles. For the scenario illustrated in
Figure 16, it computes the interval for <$Em~=~4> clocks, three of which
turn out to be correct and one not. The low endpoint of the intersection
is found as follows. A variable f is initialized with the number of
presumed incorrect clocks, in this case zero, and a counter i is
initialized at zero. Starting from the lowest endpoint, the algorithm
increments i at each low endpoint, decrements i at each high endpoint,
and stops when <$Ei~>>=~m~-~f>. The counter records the number of
intersections and thus the number of presumed correct clocks. In the
example the counter never reaches four, so f is increased by one and the
procedure is repeated. This time the counter reaches three and stops at
the low endpoint of the intersection marked DTS. The upper endpoint of
this intersection is found using a similar procedure.
This algorithm will always find the smallest single intersection
containing points in at least one of the original <$Em~-~f> confidence
intervals as long as the number of incorrect clocks is less than half
the total <$Ef~<<~m over 2>. However, some points in the intersection
may not be contained in all <$Em~-~f> of the original intervals;
moreover, some or all of the calculated times (such as for C in Figure
16) may lie outside the intersection. In the NTP clock-selection
procedure the above algorithm is modified so as to include at least
<$Em~-~f> of the calculated times. In the modified algorithm a counter c
is initialized at zero. When starting from either endpoint, c is
incremented at each calculated time; however, neither f nor c are reset
between finding the low and high endpoints of the intersection. If after
both endpoints have been found <$Ec~>>~f>, f is increased by one and the
entire procedure is repeated. The revised algorithm finds the smallest
intersection of <$Em~-~f> intervals containing at least <$Em~-~f>
calculated times. As shown in Figure 16, the modified algorithm produces
the intersection marked NTP and including the calculated time for C.
In the NTP clock-selection procedure the peers represented by the clocks
in the final intersection, called the survivors, are placed on a
candidate list. In the remaining steps of the procedure one or more
survivors may be discarded from the list as outlyers. Finally, the
clock-combining algorithm described in Appendix F provides a weighted
average of the remaining survivors based on synchronization distance.
The resulting estimates represent a synthetic peer with offset between
the maximum and minimum offsets of the remaining survivors. This defines
the clock offset <$ETHETA>, total roundtrip total delay <$EDELTA> and
total dispersion <$EEPSILON> which the local clock inherits. In
principle, these values could be included in the time interface provided
by the operating system to the user, so that the user could evaluate the
quality of indications directly.
Appendix I. Selected C-Language Program Listings
Following are C-language program listings of selected algorithms
described in the NTP specification. While these have been tested as part
of a software simulator using data collected in regular operation, they
do not necessarily represent a standard implementation, since many other
implementations could in principle conform to the NTP specification.
Common Definitions and Variables
The following definitions are common to all procedures and peers.
#define NMAX 40 /* max clocks */
#define FMAX 8 /* max filter size */
#define HZ 1000 /* clock rate */
#define MAXSTRAT 15 /* max stratum */
#define MAXSKEW 1 /* max skew error per
MAXAGE */
#define MAXAGE 86400 /* max clock age */
#define MAXDISP 16 /* max dispersion */
#define MINCLOCK 3 /* min survivor clocks
*/
#define MAXCLOCK 10 /* min candidate clocks
*/
#define FILTER .5 /* filter weight
*/
#define SELECT .75 /* select weight */
The folowing are peer state variables (one set for each peer).
double filtp[NMAX][FMAX]; /* offset
samples */
double fildp[NMAX][FMAX]; /* delay samples */
double filep[NMAX][FMAX]; /* dispersion samples */
double tp[NMAX]; /* offset */
double dp[NMAX]; /* delay */
double ep[NMAX]; /* dispersion */
double rp[NMAX]; /* last offset
*/
double utc[NMAX]; /* update tstamp
*/
int st[NMAX]; /* stratum */
The following are system state variables and constants.
double rho = 1./HZ; /* max reading
error */
double phi = MAXSKEW/MAXAGE; /* max skew rate */
double bot, top; /* confidence
interval limits */
double theta; /* clock offset
*/
double delta; /* roundtrip
delay */
double epsil; /* dispersion */
double tstamp; /* current time */
int source; /* clock source
*/
int n1, n2; /* min/max clock
ids */
The folowing are temporary lists shared by all peers and procedures.
double list[3*NMAX]; /* temporary list*/
int index[3*NMAX]; /* index list */
Clock<196>Filter Algorithm
/*
clock filter algorithm
n = peer id, offset = sample offset, delay = sample delay, disp =
sample dispersion;
computes tp[n] = peer offset, dp[n] = peer delay, ep[n] = peer
dispersion
*/
void filter(int n, double offset, double delay, double disp) {
int i, j, k, m; /* int temps */
double x; /* double temps
*/
for (i = FMAX<196>1; i >> 0; i<196> <196>) { /*
update/shift filter */
filtp[n][i] = filtp[n][i<196>1]; fildp[n][i] =
fildp[n][i<196>1];
filep[n][i] = filep[n][i<196>1]+phi*(tstamp<196>utc[n]);
}
utc[n] = tstamp; filtp[n][0] = offset<196>tp[0]; fildp[n][0] =
delay; filep[n][0] = disp;
m = 0; /*
construct/sort temp list */
for (i = 0; i << FMAX; i++) {
if (filep[n][i] >>= MAXDISP) continue;
list[m] = filep[n][i]+fildp[n][i]/2.; index[m] = i;
for (j = 0; j << m; j++) {
if (list[j] >> list[m]) {
x = list[j]; k = index[j]; list[j] =
list[m]; index[j] = index[m];
list[m] = x; index[m] = k;
}
}
m = m+1;
}
if (m <<= 0) ep[n] = MAXDISP; /* compute filter
dispersion */
else {
ep[n] = 0;
for (i = FMAX<196>1; i >>= 0; i<196> <196>) {
if (i << m) x =
fabs(filtp[n][index[0]]<196>filtp[n][index[i]]);
else x = MAXDISP;
ep[n] = FILTER*(ep[n]+x);
}
i = index[0]; ep[n] = ep[n]+filep[n][i]; tp[n] =
filtp[n][i]; dp[n] = fildp[n][i];
}
return;
}
Interval Intersection Algorithm
/*
compute interval intersection
computes bot = lowpoint, top = highpoint (bot >> top if no
intersection)
*/
void dts() {
int f; /* intersection
ceiling */
int end; /* endpoint
counter */
int clk; /*
falseticker counter */
int i, j, k, m, n; /* int temps */
double x, y; /* double temps
*/
m = 0; i = 0;
for (n = n1; n <<= n2; n++) { /* construct endpoint list */
if (ep[n] >>= MAXDISP) continue;
m = m+1;
list[i] = tp[n]<196>dist(n); index[i] = <196>1; /*
lowpoint */
for (j = 0; j << i; j++) {
if ((list[j] >> list[i]) || ((list[j] ==
list[i]) && (index[j] >> index[i]))) {
x = list[j]; k = index[j]; list[j] =
list[i]; index[j] = index[i];
list[i] = x; index[i] = k;
}
}
i = i+1;
list[i] = tp[n]; index[i] = 0; /* midpoint */
for (j = 0; j << i; j++) {
if ((list[j] >> list[i]) || ((list[j] ==
list[i]) && (index[j] >> index[i]))) {
x = list[j]; k = index[j]; list[j] =
list[i]; index[j] = index[i];
list[i] = x; index[i] = k;
}
}
i = i+1;
list[i] = tp[n]+dist(n); index[i] = 1; /* highpoint */
for (j = 0; j << i; j++) {
if ((list[j] >> list[i]) || ((list[j] ==
list[i]) && (index[j] >> index[i]))) {
x = list[j]; k = index[j]; list[j] =
list[i]; index[j] = index[i];
list[i] = x; index[i] = k;
}
}
i = i+1;
}
if (m <<= 0) return;
for (f = 0; f << m/2; f++) { /* find
intersection */
clk = 0; end = 0; /* lowpoint */
for (j = 0; j << i; j++) {
end = end<196>index[j]; bot = list[j];
if (end >>= (m<196>f)) break;
if (index[j] == 0) clk = clk+1;
}
end = 0; /* highpoint */
for (j = i<196>1; j >>= 0; j<196> <196>) {
end = end+index[j]; top = list[j];
if (end >>= (m<196>f)) break;
if (index[j] == 0) clk = clk+1;
}
if (clk <<= f) break;
}
return;
}
Clock<196>Selection Algorithm
/*
select best subset of clocks in candidate list
bot = lowpoint, top = highpoint; constructs index = candidate index
list,
m = number of candidates, source = clock source,
theta = clock offset, delta = roundtrip delay, epsil = dispersion
*/
void select() {
double xi; /* max select
dispersion */
double eps; /* min peer
dispersion */
int i, j, k, n; /* int temps */
double x, y, z; /* double temps */
m = 0;
for (n = n1; n <<= n2; n++) { /* make/sort candidate list */
if ((st[n] >> 0) && (st[n] << MAXSTRAT) && (tp[n] >>=
bot) && (tp[n] <<= top)) {
list[m] = MAXDISP*st[n]+dist(n); index[m] = n;
for (j = 0; j << m; j++) {
if (list[j] >> list[m]) {
x = list[j]; k = index[j];
list[j] = list[m]; index[j] = index[m];
list[m] = x; index[m] = k;
}
}
m = m+1;
}
}
if (m <<= 0) {
source = 0; return;
}
if (m >> MAXCLOCK) m = MAXCLOCK;
while (1) { /* cast out
falsetickers */
xi = 0.; eps = MAXDISP;
for (j = 0; j << m; j++) {
x = 0.;
for (k = m<196>1; k >>= 0; k<196> <196>)
x =
SELECT*(x+fabs(tp[index[j]]<196>tp[index[k]]));
if (x >> xi) {
xi = x; i = j; /* max(xi) */
}
x = ep[index[j]]+phi*(tstamp<196>utc[index[j]]);
if (x << eps) eps = x; /* min(eps) */
}
if ((xi <<= eps) || (m <<= MINCLOCK)) break;
if (index[i] == source) source = 0;
for (j = i; j << m<196>1; j++) index[j] = index[j+1];
m = m<196>1;
}
i = index[0]; /* declare
winner */
if (source != i)
if (source == 0) source = i;
else if (st[i] << st[source]) source = i;
theta = combine(); delta = dp[i]; epsil =
ep[i]+phi*(tstamp<196>utc[i])+xi;
return;
}
Clock<196>Combining Procedure
/*
compute weighted ensemble average
index = candidate index list, m = number of candidates; returns
combined clock offset
*/
double combine() {
int i; /* int temps */
double x, y, z; /* double temps */
z = 0. ; y = 0.;
for (i = 0; i << m; i++) { /* compute
weighted offset */
j = index[i]; x = dist(j)); z = z+tp[j]/x; y = y+1./x;
}
return z/y; /* normalize */
}
Subroutine to Compute Synchronization Distance
/*
compute synchronization distance
n = peer id; returns synchronization distance
*/
double dist(int n) {
return ep[n]+phi*(tstamp<196>utc[n])+fabs(dp[n])/2.;
}
Security considerations
see Section 3.6 and Appendix C
Author's address
David L. Mills
Electrical Engineering Department
University of Delaware
Newark, DE 19716
Phone (302) 451<196>8247
EMail mills@udel.edu