|Internet-Draft||TCP CUBIC||January 2023|
|Xu, et al.||Expires 4 August 2023||[Page]|
CUBIC for Fast and Long-Distance Networks
CUBIC is a standard TCP congestion control algorithm that uses a cubic function instead of a linear congestion window increase function to improve scalability and stability over fast and long-distance networks. CUBIC has been adopted as the default TCP congestion control algorithm by the Linux, Windows, and Apple stacks.¶
This document updates the specification of CUBIC to include algorithmic improvements based on these implementations and recent academic work. Based on the extensive deployment experience with CUBIC, it also moves the specification to the Standards Track, obsoleting RFC 8312. This also requires updating RFC 5681, to allow for CUBIC's occasionally more aggressive sending behavior.¶
About This Document
This note is to be removed before publishing as an RFC.¶
Status information for this document may be found at https://datatracker.ietf.org/doc/draft-ietf-tcpm-rfc8312bis/.¶
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Source for this draft and an issue tracker can be found at https://github.com/NTAP/rfc8312bis.¶
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CUBIC has been adopted as the default TCP congestion control algorithm in the Linux, Windows, and Apple stacks, and has been used and deployed globally. Extensive, decade-long deployment experience in vastly different Internet scenarios has convincingly demonstrated that CUBIC is safe for deployment on the global Internet and delivers substantial benefits over classical Reno congestion control [RFC5681]. It is therefore to be regarded as the currently most widely deployed standard for TCP congestion control. CUBIC can also be used for other transport protocols such as QUIC [RFC9000] and SCTP [RFC9260] as a default congestion controller.¶
The design of CUBIC was motivated by the well-documented problem classical Reno TCP has with low utilization over fast and long-distance networks [K03][RFC3649]. This problem arises from a slow increase of the congestion window following a congestion event in a network with a large bandwidth-delay product (BDP). [HLRX07] indicates that this problem is frequently observed even in the range of congestion window sizes over several hundreds of packets. This problem is equally applicable to all Reno-style standards and their variants, including TCP-Reno [RFC5681], TCP-NewReno [RFC6582][RFC6675], SCTP [RFC9260], TFRC [RFC5348], and QUIC congestion control [RFC9002], which use the same linear increase function for window growth. All Reno-style standards and their variants are collectively referred to as "Reno" in this document.¶
CUBIC, originally proposed in [HRX08], is a modification to the congestion control algorithm of classical Reno to remedy this problem. Specifically, CUBIC uses a cubic function instead of the linear window increase function of Reno to improve scalability and stability under fast and long-distance networks.¶
This document updates the specification of CUBIC to include algorithmic improvements based on the Linux, Windows, and Apple implementations and recent academic work. Based on the extensive deployment experience with CUBIC, it also moves the specification to the Standards Track, obsoleting [RFC8312]. This requires an update to Section 3 of [RFC5681], which limits the aggressiveness of Reno TCP implementations. Since CUBIC is occasionally more aggressive than the [RFC5681] algorithms, this document updates the first paragraph of Section 3 of [RFC5681], replacing it with a normative reference to guideline (1) in Section 3 of [RFC5033], which allows for CUBIC's behavior as defined in this document.¶
Specifically, CUBIC may increase the congestion window more aggressively than Reno during the congestion avoidance phase. According to [RFC5681], during congestion avoidance, the sender must not increment cwnd by more than SMSS bytes once per RTT, whereas CUBIC may increase cwnd much more aggressively. Additionally, CUBIC recommends the HyStart++ algorithm [I-D.ietf-tcpm-hystartplusplus] for slow start, which allows for cwnd increases of more than SMSS bytes for incoming acknowledgments during slow start, while this behavior is not allowed as part of [RFC5681] standard.¶
Binary Increase Congestion Control (BIC-TCP) [XHR04], a predecessor of CUBIC, was selected as the default TCP congestion control algorithm by Linux in the year 2005 and had been used for several years by the Internet community at large.¶
CUBIC uses a similar window increase function as BIC-TCP and is designed to be less aggressive and fairer to Reno in bandwidth usage than BIC-TCP while maintaining the strengths of BIC-TCP such as stability, window scalability, and round-trip time (RTT) fairness.¶
[RFC5033] documents the IETF's best current practices for specifying new congestion control algorithms, specifically, ones that differ from the general congestion control principles outlined in [RFC2914]. It describes what type of evaluation is expected by the IETF to understand the suitability of a new congestion control algorithm and the process to enable a specification to be approved for widespread deployment in the global Internet.¶
There are areas in which CUBIC differs from the congestion control algorithms previously published in standards-track RFCs; those changes are specified in this document. However, it is not obvious that these changes go beyond the general congestion control principles outlined in [RFC2914], so the process in [RFC5033] may not apply.¶
Also, the wide deployment of CUBIC on the Internet was driven by direct adoption in most of the popular operating systems, and did not follow the practices documented in [RFC5033]. However, due to the resulting Internet-scale deployment experience over a long period of time, the IETF has determined that CUBIC may be published as a standards-track specification. This decision by the IETF does not alter the general guidance in [RFC2914].¶
The following sections first briefly explain the design principles of CUBIC, provide the exact specification of CUBIC, and finally discuss the safety features of CUBIC following the guidelines specified in [RFC5033].¶
The key words "MUST", "MUST NOT", "REQUIRED", "SHALL", "SHALL NOT", "SHOULD", "SHOULD NOT", "RECOMMENDED", "NOT RECOMMENDED", "MAY", and "OPTIONAL" in this document are to be interpreted as described in BCP 14 [RFC2119] [RFC8174] when, and only when, they appear in all capitals, as shown here.¶
3. Design Principles of CUBIC
CUBIC is designed according to the following design principles:¶
- Principle 1:
For better network utilization and stability, CUBIC uses both the concave and convex profiles of a cubic function to increase the congestion window size, instead of using just a convex function.¶
- Principle 2:
To be Reno-friendly, CUBIC is designed to behave like Reno in networks with short RTTs and small bandwidth where Reno performs well.¶
- Principle 3:
For RTT-fairness, CUBIC is designed to achieve linear bandwidth sharing among flows with different RTTs.¶
- Principle 4:
CUBIC appropriately sets its multiplicative window decrease factor in order to balance between the scalability and convergence speed.¶
3.1. Principle 1 for the CUBIC Increase Function
For better network utilization and stability, CUBIC [HRX08] uses a cubic window increase function in terms of the elapsed time from the last congestion event. While most alternative congestion control algorithms to Reno increase the congestion window using convex functions, CUBIC uses both the concave and convex profiles of a cubic function for window growth.¶
After a window reduction in response to a congestion event detected by duplicate ACKs, Explicit Congestion Notification-Echo (ECN-Echo, ECE) ACKs [RFC3168], TCP RACK [RFC8985] or QUIC loss detection [RFC9002], CUBIC remembers the congestion window size at which it received the congestion event and performs a multiplicative decrease of the congestion window. When CUBIC enters into congestion avoidance, it starts to increase the congestion window using the concave profile of the cubic function. The cubic function is set to have its plateau at the remembered congestion window size, so that the concave window increase continues until then. After that, the cubic function turns into a convex profile and the convex window increase begins.¶
This style of window adjustment (concave and then convex) improves the algorithm stability while maintaining high network utilization [CEHRX09]. This is because the window size remains almost constant, forming a plateau around the remembered congestion window size of the last congestion event, where network utilization is deemed highest. Under steady state, most window size samples of CUBIC are close to that remembered congestion window size, thus promoting high network utilization and stability.¶
Note that congestion control algorithms that only use convex functions to increase the congestion window size have their maximum increments around the remembered congestion window size of the last congestion event, and thus introduce many packet bursts around the saturation point of the network, likely causing frequent global loss synchronizations.¶
3.2. Principle 2 for Reno-Friendliness
CUBIC promotes per-flow fairness to Reno. Note that Reno performs well over paths with small bandwidth-delay products, and only experiences problems when attempting to increase bandwidth utilization on paths with large bandwidth-delay products.¶
A congestion control algorithm designed to be friendly to Reno on a per-flow basis must increase its congestion window less aggressively in small-BDP networks than in large-BDP networks.¶
The aggressiveness of CUBIC mainly depends on the maximum window size before a window reduction, which is smaller in small-BDP networks than in large-BDP networks. Thus, CUBIC increases its congestion window less aggressively in small-BDP networks than in large-BDP networks.¶
Furthermore, in cases when the cubic function of CUBIC would increase the congestion window less aggressively than Reno, CUBIC simply follows the window size of Reno to ensure that CUBIC achieves at least the same throughput as Reno in small-BDP networks. The region where CUBIC behaves like Reno is called the "Reno-friendly region".¶
3.3. Principle 3 for RTT Fairness
Two CUBIC flows with different RTTs have a throughput ratio that is linearly proportional to the inverse of their RTT ratio, where the throughput of a flow is approximately the size of its congestion window divided by its RTT.¶
Specifically, CUBIC maintains a window increase rate independent of RTTs outside the Reno-friendly region, and thus flows with different RTTs have similar congestion window sizes under steady state when they operate outside the Reno-friendly region.¶
This notion of a linear throughput ratio is similar to that of Reno under an asynchronous loss model, where flows with different RTTs have the same packet loss rate but experience loss events at different times. However, under a synchronous loss model, where flows with different RTTs experience loss events at the same time but have different packet loss rates, the throughput ratio of Reno flows with different RTTs is quadratically proportional to the inverse of their RTT ratio [XHR04].¶
CUBIC always ensures a linear throughput ratio independent of the loss environment. This is an improvement over Reno. While there is no consensus on the optimal throughput ratio for different RTT flows, over wired Internet paths, use of a linear throughput ratio seems more reasonable than equal throughputs (i.e., the same throughput for flows with different RTTs) or a higher-order throughput ratio (e.g., a quadratical throughput ratio of Reno in synchronous loss environments).¶
3.4. Principle 4 for the CUBIC Decrease Factor
To balance between scalability and convergence speed, CUBIC sets the multiplicative window decrease factor to 0.7, whereas Reno uses 0.5.¶
While this improves the scalability of CUBIC, a side effect of this decision is slower convergence, especially under low statistical multiplexing. This design choice is following the observation that HighSpeed TCP (HSTCP) [RFC3649] and other approaches (e.g., [GV02]) made: the current Internet becomes more asynchronous with less frequent loss synchronizations under high statistical multiplexing.¶
In such environments, even strict Multiplicative-Increase Multiplicative-Decrease (MIMD) can converge. CUBIC flows with the same RTT always converge to the same throughput independent of statistical multiplexing, thus achieving intra-algorithm fairness. In environments with sufficient statistical multiplexing, the convergence speed of CUBIC is reasonable.¶
4. CUBIC Congestion Control
This section discusses how the congestion window is updated during the different stages of the CUBIC congestion controller.¶
The unit of all window sizes in this document is segments of the maximum segment size (MSS), and the unit of all times is seconds. Implementations can use bytes to express window sizes, which would require factoring in the maximum segment size wherever necessary and replacing segments_acked with the number of bytes acknowledged in Figure 4.¶
4.1.1. Constants of Interest
βcubic: CUBIC multiplicative decrease factor as described in Section 4.6.¶
αcubic: CUBIC additive increase factor used in Reno-friendly region as described in Section 4.3.¶
C: constant that determines the aggressiveness of CUBIC in competing with other congestion control algorithms in high-BDP networks. Please see Section 5 for more explanation on how it is set. The unit for C is¶
4.1.2. Variables of Interest
This section defines the variables required to implement CUBIC:¶
RTT: Smoothed round-trip time in seconds, calculated as described in [RFC6298].¶
cwnd: Current congestion window in segments.¶
ssthresh: Current slow start threshold in segments.¶
cwndprior: Size of cwnd in segments at the time of setting ssthresh most recently, either upon exiting the first slow start, or just before cwnd was reduced in the last congestion event.¶
Wmax: Size of cwnd in segments just before cwnd was reduced in the last congestion event when fast convergence is disabled (same as cwndprior on a congestion event). However, if fast convergence is enabled, Wmax may be further reduced based on the current saturation point.¶
K: The time period in seconds it takes to increase the congestion window size at the beginning of the current congestion avoidance stage to Wmax.¶
tcurrent: Current time of the system in seconds.¶
tepoch: The time in seconds at which the current congestion avoidance stage started.¶
cwndepoch: The cwnd at the beginning of the current congestion avoidance stage, i.e., at time tepoch.¶
Wcubic(t): The congestion window in segments at time t in seconds based on the cubic increase function, as described in Section 4.2.¶
target: Target value of congestion window in segments after the next RTT, that is, Wcubic(t + RTT), as described in Section 4.2.¶
West: An estimate for the congestion window in segments in the Reno-friendly region, that is, an estimate for the congestion window of Reno.¶
segments_acked: Number of MSS-sized segments acked when a "new ACK" is received, i.e., an ACK that cumulatively acknowledges the delivery of new data. This number will be a decimal value when a new ACK acknowledges an amount of data that is not MSS-sized. Specifically, it can be less than 1 when a new ACK acknowledges a segment smaller than the MSS.¶
4.2. Window Increase Function
CUBIC maintains the acknowledgment (ACK) clocking of Reno by increasing the congestion window only at the reception of a new ACK. It does not make any changes to the TCP Fast Recovery and Fast Retransmit algorithms [RFC6582][RFC6675].¶
During congestion avoidance, after a congestion event is detected by mechanisms described in Section 3.1, CUBIC uses a window increase function different from Reno.¶
CUBIC uses the following window increase function:¶
where t is the elapsed time in seconds from the beginning of the current congestion avoidance stage, that is,¶
and where tepoch is the time at which the current congestion avoidance stage starts. K is the time period that the above function takes to increase the congestion window size at the beginning of the current congestion avoidance stage to Wmax if there are no further congestion events and is calculated using the following equation:¶
where cwndepoch is the congestion window at the beginning of the current congestion avoidance stage.¶
Upon receiving a new ACK during congestion avoidance, CUBIC computes the target congestion window size after the next RTT using Figure 1 as follows, where RTT is the smoothed round-trip time. The lower and upper bounds below ensure that CUBIC's congestion window increase rate is non-decreasing and is less than the increase rate of slow start [SXEZ19].¶
The elapsed time t in Figure 1 MUST NOT include periods during which cwnd has not been updated due to application-limited behavior (see Section 5.8).¶
Depending on the value of the current congestion window size cwnd, CUBIC runs in three different regions:¶
- The Reno-friendly region, which ensures that CUBIC achieves at least the same throughput as Reno.¶
- The concave region, if CUBIC is not in the Reno-friendly region and cwnd is less than Wmax.¶
- The convex region, if CUBIC is not in the Reno-friendly region and cwnd is greater than Wmax.¶
To summarize, CUBIC computes both Wcubic(t) and West (see Section 4.3) on receiving a new ACK in congestion avoidance and chooses the larger of the two values.¶
The next sections describe the exact actions taken by CUBIC in each region.¶
4.3. Reno-Friendly Region
Reno performs well in certain types of networks, for example, under short RTTs and small bandwidths (or small BDPs). In these networks, CUBIC remains in the Reno-friendly region to achieve at least the same throughput as Reno.¶
The Reno-friendly region is designed according to the analysis in [FHP00], which studies the performance of an AIMD algorithm with an additive factor of α (segments per RTT) and a multiplicative factor of β, denoted by AIMD(α, β). p is the packet loss rate. Specifically, the average congestion window size of AIMD(α, β) can be calculated using Figure 3.¶
By the same analysis, to achieve a similar average window size as Reno that uses AIMD(1, 0.5), α must be equal to,¶
Thus, CUBIC uses Figure 4 to estimate the window size West in the Reno-friendly region with¶
which achieves approximately the same average window size as Reno in many cases. The model used to calculate αcubic is not absolutely precise, but analysis and simulation in [AIMD-friendliness], as well as over a decade of experience with CUBIC in the public Internet, show that this approach produces acceptable levels of rate fairness between CUBIC and Reno flows. Also, no significant drawbacks of the model have been reported. However, it would be beneficial to see continued detailed analysis on it. When receiving a new ACK in congestion avoidance (where cwnd could be greater than or less than Wmax), CUBIC checks whether Wcubic(t) is less than West. If so, CUBIC is in the Reno-friendly region and cwnd SHOULD be set to West at each reception of a new ACK.¶
West is set equal to cwndepoch at the start of the congestion avoidance stage. After that, on every new ACK, West is updated using Figure 4. Note that this equation uses segments_acked and cwnd is measured in segments. An implementation that measures cwnd in bytes should adjust the equation accordingly using number of acknowledged bytes and MSS. Also note that this equation works for connections with enabled or disabled Delayed ACKs [RFC5681], as segments_acked will be different based on the segments actually acknowledged by a new ACK.¶
Once West has grown to reach the cwnd at the time of most recently setting ssthresh, that is, West >= cwndprior, the sender SHOULD set αcubic to 1 to ensure that it can achieve the same congestion window increment rate as Reno, which uses AIMD(1, 0.5).¶
The next two sections assume that CUBIC is not in the Reno-friendly region and uses the window increase function described in Section 4.2. Although cwnd is incremented in the same way for both concave and convex regions, they are discussed separately to analyze and understand the difference between the two regions.¶
4.4. Concave Region
When receiving a new ACK in congestion avoidance, if CUBIC is not in the Reno-friendly region and cwnd is less than Wmax, then CUBIC is in the concave region. In this region, cwnd MUST be incremented by¶
for each received new ACK, where target is calculated as described in Section 4.2.¶
4.5. Convex Region
When receiving a new ACK in congestion avoidance, if CUBIC is not in the Reno-friendly region and cwnd is larger than or equal to Wmax, then CUBIC is in the convex region.¶
The convex region indicates that the network conditions might have changed since the last congestion event, possibly implying more available bandwidth after some flow departures. Since the Internet is highly asynchronous, some amount of perturbation is always possible without causing a major change in available bandwidth.¶
Unless it is overridden by the AIMD window increase, CUBIC is very careful in this region. The convex profile aims to increase the window very slowly at the beginning when cwnd is around Wmax and then gradually increases its rate of increase. This region is also called the "maximum probing phase", since CUBIC is searching for a new Wmax. In this region, cwnd MUST be incremented by¶
for each received new ACK, where target is calculated as described in Section 4.2.¶
4.6. Multiplicative Decrease
When a congestion event is detected by mechanisms described in Section 3.1, CUBIC updates Wmax and reduces cwnd and ssthresh immediately as described below. In case of packet loss, the sender MUST reduce cwnd and ssthresh immediately upon entering loss recovery, similar to [RFC5681] (and [RFC6675]). Note that other mechanisms, such as Proportional Rate Reduction [RFC6937], can be used to reduce the sending rate during loss recovery more gradually. The parameter βcubic SHOULD be set to 0.7, which is different from the multiplicative decrease factor used in [RFC5681] (and [RFC6675]) during fast recovery.¶
In Figure 5, flight_size is the amount of outstanding (unacknowledged) data in the network, as defined in [RFC5681]. Note that a rate-limited application with idle periods or periods when unable to send at the full rate permitted by cwnd could easily encounter notable variations in the volume of data sent from one RTT to another, resulting in flight_size that is significantly less than cwnd when there is a congestion event. The congestion response would therefore decrease cwnd to a much lower value than necessary. To avoid such suboptimal performance, the mechanisms described in [RFC7661] can be used. These describe how to manage and use cwnd and ssthresh during a rate-limited Interval, and how to update cwnd and ssthresh after congestion has been detected. The mechanism defined in [RFC7661] is safe to use even when cwnd is greater than the receive window, because it validates cwnd based on the amount of data acknowledged by the network in an RTT, which implicitly accounts for the allowed receive window.¶
Some implementations of CUBIC currently use cwnd instead of flight_size when calculating a new ssthresh. Implementations that use cwnd MUST use other measures to prevent cwnd from growing when the volume of bytes in flight is smaller than cwnd. This also effectively avoids cwnd from growing beyond the receive window. Such measures are important to prevent a CUBIC sender from using an arbitrarily high cwnd value when calculating new values for ssthresh and cwnd when congestion is detected. This might not be as robust as the mechanisms described in [RFC7661].¶
A QUIC sender that uses cwnd to calculate new values for cwnd and ssthresh after detecting a congestion event is REQUIRED to apply similar mechanisms [RFC9002].¶
A side effect of setting βcubic to a value bigger than 0.5 is that packet loss can happen for more than one round-trip in certain cases, but it can work efficiently in other cases, for example, when HyStart++ is used along with CUBIC or when the sending rate is limited by the application. While a more adaptive setting of βcubic could help limit packet loss to a single round, it would require detailed analyses and large-scale evaluations to validate such algorithms.¶
Note that CUBIC MUST continue to reduce cwnd in response to congestion events due to ECN-Echo ACKs until it reaches a value of 1 MSS. If congestion events indicated by ECN-Echo ACKs persist, a sender with a cwnd of 1 MSS MUST reduce its sending rate even further. It can achieve that by using a retransmission timer with exponential backoff, as described in [RFC3168].¶
4.7. Fast Convergence
To improve convergence speed, CUBIC uses a heuristic. When a new flow joins the network, existing flows need to give up some of their bandwidth to allow the new flow some room for growth, if the existing flows have been using all the network bandwidth. To speed up this bandwidth release by existing flows, the following "Fast Convergence" mechanism SHOULD be implemented.¶
With Fast Convergence, when a congestion event occurs, Wmax is updated as follows, before the window reduction described in Section 4.6.¶
At a congestion event, if the current cwnd is less than Wmax, this indicates that the saturation point experienced by this flow is getting reduced because of a change in available bandwidth. This flow can then release more bandwidth by reducing Wmax further. This action effectively lengthens the time for this flow to increase its congestion window, because the reduced Wmax forces the flow to plateau earlier. This allows more time for the new flow to catch up to its congestion window size.¶
Fast Convergence is designed for network environments with multiple CUBIC flows. In network environments with only a single CUBIC flow and without any other traffic, Fast Convergence SHOULD be disabled.¶
In case of a timeout, CUBIC follows Reno to reduce cwnd [RFC5681], but sets ssthresh using βcubic (same as in Section 4.6) in a way that is different from Reno TCP [RFC5681].¶
During the first congestion avoidance stage after a timeout, CUBIC increases its congestion window size using Figure 1, where t is the elapsed time since the beginning of the current congestion avoidance, K is set to 0, and Wmax is set to the congestion window size at the beginning of the current congestion avoidance stage. In addition, for the Reno-friendly region, West SHOULD be set to the congestion window size at the beginning of the current congestion avoidance.¶
4.9. Spurious Congestion Events
In cases where CUBIC reduces its congestion window in response to having detected packet loss via duplicate ACKs or timeouts, there is a possibility that the missing ACK would arrive after the congestion window reduction and a corresponding packet retransmission. For example, packet reordering could trigger this behavior. A high degree of packet reordering could cause multiple congestion window reduction events, where spurious losses are incorrectly interpreted as congestion signals, thus degrading CUBIC's performance significantly.¶
For TCP, there are two types of spurious events - spurious timeouts and spurious fast retransmits. In case of QUIC, there are no spurious timeouts as the loss is only detected after receiving an ACK.¶
4.9.1. Spurious timeout
An implementation MAY detect spurious timeouts based on the mechanisms described in Forward RTO-Recovery [RFC5682]. Experimental alternatives include Eifel [RFC3522]. When a spurious timeout is detected, a TCP implementation MAY follow the response algorithm described in [RFC4015] to restore the congestion control state and adapt the retransmission timer to avoid further spurious timeouts.¶
4.9.2. Spurious loss detected by acknowledgments
Upon receiving an ACK, a TCP implementation MAY detect spurious losses either using TCP Timestamps or via D-SACK[RFC2883]. Experimental alternatives include Eifel detection algorithm [RFC3522] which uses TCP Timestamps and DSACK based detection [RFC3708] which uses DSACK information. A QUIC implementation can easily determine a spurious loss if a QUIC packet is acknowledged after it has been marked as lost and the original data has been retransmitted with a new QUIC packet.¶
This section specifies a simple response algorithm when a spurious loss is detected by acknowledgments. Implementations would need to carefully evaluate the impact of using this algorithm in different environments that may experience sudden change in available capacity (e.g., due to variable radio capacity, a routing change, or a mobility event).¶
When a packet loss is detected via acknowledgments, a CUBIC implementation MAY save the current value of the following variables before the congestion window is reduced.¶
Once the previously declared packet loss is confirmed to be spurious, CUBIC MAY restore the original values of the above-mentioned variables as follows if the current cwnd is lower than cwndprior. Restoring the original values ensures that CUBIC's performance is similar to what it would be without spurious losses.¶
In rare cases, when the detection happens long after a spurious loss event and the current cwnd is already higher than cwndprior, CUBIC SHOULD continue to use the current and the most recent values of these variables.¶
4.10. Slow Start
CUBIC MUST employ a slow-start algorithm, when cwnd is no more than ssthresh. In general, CUBIC SHOULD use the HyStart++ slow start algorithm [I-D.ietf-tcpm-hystartplusplus], or MAY use the Reno TCP slow start algorithm [RFC5681] in the rare cases when HyStart++ is not suitable. Experimental alternatives include hybrid slow start [HR11], a predecessor to HyStart++ that some CUBIC implementations have used as the default for the last decade, and limited slow start [RFC3742]. Whichever start-up algorithm is used, work might be needed to ensure that the end of slow start and the first multiplicative decrease of congestion avoidance work well together.¶
When CUBIC uses HyStart++ [I-D.ietf-tcpm-hystartplusplus], it may exit the first slow start without incurring any packet loss and thus Wmax is undefined. In this special case, CUBIC sets cwndprior = cwnd and switches to congestion avoidance. It then increases its congestion window size using Figure 1, where t is the elapsed time since the beginning of the current congestion avoidance, K is set to 0, and Wmax is set to the congestion window size at the beginning of the current congestion avoidance stage.¶
This section further discusses the safety features of CUBIC following the guidelines specified in [RFC5033].¶
With a deterministic loss model where the number of packets between two successive packet losses is always 1/p, CUBIC always operates with the concave window profile, which greatly simplifies the performance analysis of CUBIC. The average window size of CUBIC (see Appendix C) can be obtained by the following function:¶
With βcubic set to 0.7, the above formula reduces to:¶
The following subsection will determine the value of C using Figure 7.¶
5.1. Fairness to Reno
In environments where Reno is able to make reasonable use of the available bandwidth, CUBIC does not significantly change this state.¶
Reno performs well in the following two types of networks:¶
- networks with a small bandwidth-delay product (BDP)¶
- networks with a short RTTs, but not necessarily a small BDP¶
CUBIC is designed to behave very similarly to Reno in the above two types of networks. The following two tables show the average window sizes of Reno TCP, HSTCP, and CUBIC TCP. The average window sizes of Reno TCP and HSTCP are from [RFC3649]. The average window size of CUBIC is calculated using Figure 7 and the CUBIC Reno-friendly region for three different values of C.¶
|Loss Rate P||Reno||HSTCP||CUBIC (C=0.04)||CUBIC (C=0.4)||CUBIC (C=4)|
Table 1 describes the response function of Reno TCP, HSTCP, and CUBIC in networks with RTT = 0.1 seconds. The average window size is in MSS-sized segments.¶
|Loss Rate P||Reno||HSTCP||CUBIC (C=0.04)||CUBIC (C=0.4)||CUBIC (C=4)|
Table 2 describes the response function of Reno TCP, HSTCP, and CUBIC in networks with RTT = 0.01 seconds. The average window size is in MSS-sized segments.¶
Both tables show that CUBIC with any of these three C values is more friendly to Reno TCP than HSTCP, especially in networks with a short RTT where Reno TCP performs reasonably well. For example, in a network with RTT = 0.01 seconds and p=10^-6, Reno TCP has an average window of 1200 packets. If the packet size is 1500 bytes, then Reno TCP can achieve an average rate of 1.44 Gbps. In this case, CUBIC with C=0.04 or C=0.4 achieves exactly the same rate as Reno TCP, whereas HSTCP is about ten times more aggressive than Reno TCP.¶
C determines the aggressiveness of CUBIC in competing with other congestion control algorithms for bandwidth. CUBIC is more friendly to Reno TCP, if the value of C is lower. However, it is NOT RECOMMENDED to set C to a very low value like 0.04, since CUBIC with a low C cannot efficiently use the bandwidth in fast and long-distance networks. Based on these observations and extensive deployment experience, C=0.4 seems to give a good balance between Reno-friendliness and aggressiveness of window increase. Therefore, C SHOULD be set to 0.4. With C set to 0.4, Figure 7 is reduced to:¶
Figure 8 is then used in the next subsection to show the scalability of CUBIC.¶
5.2. Using Spare Capacity
CUBIC uses a more aggressive window increase function than Reno for fast and long-distance networks.¶
The following table shows that to achieve the 10 Gbps rate, Reno TCP requires a packet loss rate of 2.0e-10, while CUBIC TCP requires a packet loss rate of 2.9e-8.¶
|Throughput (Mbps)||Average W||Reno P||HSTCP P||CUBIC P|
Table 3 describes the required packet loss rate for Reno TCP, HSTCP, and CUBIC to achieve a certain throughput, with 1500-byte packets and an RTT of 0.1 seconds.¶
The test results in [HLRX07] indicate that, in typical cases with a degree of background traffic, CUBIC uses the spare bandwidth left unused by existing Reno TCP flows in the same bottleneck link without taking away much bandwidth from the existing flows.¶
5.3. Difficult Environments
CUBIC is designed to remedy the poor performance of Reno in fast and long-distance networks.¶
5.4. Investigating a Range of Environments
CUBIC has been extensively studied using simulations, testbed emulations, Internet experiments, and Internet measurements, covering a wide range of network environments [HLRX07][H16][CEHRX09][HR11][BSCLU13][LBEWK16]. They have convincingly demonstrated that CUBIC delivers substantial benefits over classical Reno congestion control [RFC5681].¶
Same as Reno, CUBIC is a loss-based congestion control algorithm. Because CUBIC is designed to be more aggressive (due to a faster window increase function and bigger multiplicative decrease factor) than Reno in fast and long-distance networks, it can fill large drop-tail buffers more quickly than Reno and increases the risk of a standing queue [RFC8511]. In this case, proper queue sizing and management [RFC7567] could be used to mitigate the risk to some extent and reduce the packet queuing delay. Also, in large-BDP networks after a congestion event, CUBIC, due its cubic window increase function, recovers quickly to the highest link utilization point. This means that link utilization is less sensitive to an active queue management (AQM) target that is lower than the amplitude of the whole sawtooth.¶
Similar to Reno, the performance of CUBIC as a loss-based congestion control algorithm suffers in networks where a packet loss is not a good indication of bandwidth utilization, such as wireless or mobile networks [LIU16].¶
5.5. Protection against Congestion Collapse
With regard to the potential of causing congestion collapse, CUBIC behaves like Reno, since CUBIC modifies only the window adjustment algorithm of Reno. Thus, it does not modify the ACK clocking and timeout behaviors of Reno.¶
CUBIC also satisfies the "full backoff" requirement as described in [RFC5033]. After reducing the sending rate to one packet per RTT in response to congestion events due to ECN-Echo ACKs, CUBIC then exponentially increases the transmission timer for each packet retransmission while congestion persists.¶
5.6. Fairness within the Alternative Congestion Control Algorithm
CUBIC ensures convergence of competing CUBIC flows with the same RTT in the same bottleneck links to an equal throughput. When competing flows have different RTT values, their throughput ratio is linearly proportional to the inverse of their RTT ratios. This is true independently of the level of statistical multiplexing on the link. The convergence time depends on the network environments (e.g., bandwidth, RTT) and the level of statistical multiplexing, as mentioned in Section 3.4.¶
5.7. Performance with Misbehaving Nodes and Outside Attackers
CUBIC does not introduce new entities or signals, so its vulnerability to misbehaving nodes or attackers is unchanged from Reno.¶
5.8. Behavior for Application-Limited Flows
A flow is application-limited if it is currently sending less than what is allowed by the congestion window. This can happen if the flow is limited by either the sender application or the receiver application (via the receiver advertised window) and thus sends less data than what is allowed by the sender's congestion window.¶
CUBIC does not increase its congestion window if a flow is application-limited. Section 4.2 requires that t in Figure 1 does not include application-limited periods, such as idle periods, otherwise Wcubic(t) might be very high after restarting from these periods.¶
5.9. Responses to Sudden or Transient Events
If there is a sudden increase in capacity, e.g., due to variable radio capacity, a routing change, or a mobility event, CUBIC is designed to utilize the newly available capacity faster than Reno.¶
On the other hand, if there is a sudden decrease in capacity, CUBIC reduces more slowly than Reno. This remains true regardless of whether CUBIC is in Reno-friendly mode and regardless of whether fast convergence is enabled.¶
5.10. Incremental Deployment
CUBIC requires only changes to the congestion control at the sender, and it does not require any changes at receivers. That is, a CUBIC sender works correctly with Reno receivers. In addition, CUBIC does not require any changes to routers and does not require any assistance from routers.¶
6. Security Considerations
CUBIC makes no changes to the underlying security of a transport protocol and inherits the general security concerns described in [RFC5681]. Specifically, changing the window computation on the sender may allow an attacker, through dropping or injecting ACKs (as described in [RFC5681]), to either force the CUBIC implementation to reduce its bandwidth, or to convince it that there is no congestion when congestion does exist, and use the CUBIC implementation as an attack vector against other hosts. These attacks are not new to CUBIC and are inherently part of any transport protocol like TCP.¶
7. IANA Considerations
This document does not require any IANA actions.¶
8.1. Normative References
- Balasubramanian, P., Huang, Y., and M. Olson, "HyStart++: Modified Slow Start for TCP", Work in Progress, Internet-Draft, draft-ietf-tcpm-hystartplusplus-13, , <https://datatracker.ietf.org/doc/html/draft-ietf-tcpm-hystartplusplus-13>.
- Bradner, S., "Key words for use in RFCs to Indicate Requirement Levels", BCP 14, RFC 2119, DOI 10.17487/RFC2119, , <https://www.rfc-editor.org/rfc/rfc2119>.
- Floyd, S., Mahdavi, J., Mathis, M., and M. Podolsky, "An Extension to the Selective Acknowledgement (SACK) Option for TCP", RFC 2883, DOI 10.17487/RFC2883, , <https://www.rfc-editor.org/rfc/rfc2883>.
- Floyd, S., "Congestion Control Principles", BCP 41, RFC 2914, DOI 10.17487/RFC2914, , <https://www.rfc-editor.org/rfc/rfc2914>.
- Ramakrishnan, K., Floyd, S., and D. Black, "The Addition of Explicit Congestion Notification (ECN) to IP", RFC 3168, DOI 10.17487/RFC3168, , <https://www.rfc-editor.org/rfc/rfc3168>.
- Ludwig, R. and A. Gurtov, "The Eifel Response Algorithm for TCP", RFC 4015, DOI 10.17487/RFC4015, , <https://www.rfc-editor.org/rfc/rfc4015>.
- Floyd, S. and M. Allman, "Specifying New Congestion Control Algorithms", BCP 133, RFC 5033, DOI 10.17487/RFC5033, , <https://www.rfc-editor.org/rfc/rfc5033>.
- Floyd, S., Handley, M., Padhye, J., and J. Widmer, "TCP Friendly Rate Control (TFRC): Protocol Specification", RFC 5348, DOI 10.17487/RFC5348, , <https://www.rfc-editor.org/rfc/rfc5348>.
- Allman, M., Paxson, V., and E. Blanton, "TCP Congestion Control", RFC 5681, DOI 10.17487/RFC5681, , <https://www.rfc-editor.org/rfc/rfc5681>.
- Sarolahti, P., Kojo, M., Yamamoto, K., and M. Hata, "Forward RTO-Recovery (F-RTO): An Algorithm for Detecting Spurious Retransmission Timeouts with TCP", RFC 5682, DOI 10.17487/RFC5682, , <https://www.rfc-editor.org/rfc/rfc5682>.
- Paxson, V., Allman, M., Chu, J., and M. Sargent, "Computing TCP's Retransmission Timer", RFC 6298, DOI 10.17487/RFC6298, , <https://www.rfc-editor.org/rfc/rfc6298>.
- Henderson, T., Floyd, S., Gurtov, A., and Y. Nishida, "The NewReno Modification to TCP's Fast Recovery Algorithm", RFC 6582, DOI 10.17487/RFC6582, , <https://www.rfc-editor.org/rfc/rfc6582>.
- Blanton, E., Allman, M., Wang, L., Jarvinen, I., Kojo, M., and Y. Nishida, "A Conservative Loss Recovery Algorithm Based on Selective Acknowledgment (SACK) for TCP", RFC 6675, DOI 10.17487/RFC6675, , <https://www.rfc-editor.org/rfc/rfc6675>.
- Baker, F., Ed. and G. Fairhurst, Ed., "IETF Recommendations Regarding Active Queue Management", BCP 197, RFC 7567, DOI 10.17487/RFC7567, , <https://www.rfc-editor.org/rfc/rfc7567>.
- Leiba, B., "Ambiguity of Uppercase vs Lowercase in RFC 2119 Key Words", BCP 14, RFC 8174, DOI 10.17487/RFC8174, , <https://www.rfc-editor.org/rfc/rfc8174>.
- Cheng, Y., Cardwell, N., Dukkipati, N., and P. Jha, "The RACK-TLP Loss Detection Algorithm for TCP", RFC 8985, DOI 10.17487/RFC8985, , <https://www.rfc-editor.org/rfc/rfc8985>.
- Iyengar, J., Ed. and I. Swett, Ed., "QUIC Loss Detection and Congestion Control", RFC 9002, DOI 10.17487/RFC9002, , <https://www.rfc-editor.org/rfc/rfc9002>.
8.2. Informative References
- Briscoe, B. and O. Albisser, "Friendliness between AIMD Algorithms", RFC Editor, please replace this URL with the permanent arXiv one , , <https://raw.githubusercontent.com/bbriscoe/cubic-reno/main/creno_tr.pdf>.
- Belhareth, S., Sassatelli, L., Collange, D., Lopez-Pacheco, D., and G. Urvoy-Keller, "Understanding TCP cubic performance in the cloud: A mean-field approach", 2013 IEEE 2nd International Conference on Cloud Networking (CloudNet), DOI 10.1109/cloudnet.2013.6710576, , <https://doi.org/10.1109/cloudnet.2013.6710576>.
- Cai, H., Eun, D., Ha, S., Rhee, I., and L. Xu, "Stochastic convex ordering for multiplicative decrease internet congestion control", Computer Networks vol. 53, no. 3, pp. 365-381, DOI 10.1016/j.comnet.2008.10.012, , <https://doi.org/10.1016/j.comnet.2008.10.012>.
- Floyd, S., Handley, M., and J. Padhye, "A Comparison of Equation-Based and AIMD Congestion Control", , <https://www.icir.org/tfrc/aimd.pdf>.
- Gorinsky, S. and H. Vin, "Extended Analysis of Binary Adjustment Algorithms", Technical Report TR2002-29, Department of Computer Sciences, The University of Texas at Austin, , <https://www.cs.utexas.edu/ftp/techreports/tr02-39.ps.gz>.
- Ha, S., "Simulation, Testbed, and Deployment Testing Results of CUBIC", , <https://web.archive.org/web/20161118125842/http://netsrv.csc.ncsu.edu/wiki/index.php/TCP_Testing>.
- Ha, S., Le, L., Rhee, I., and L. Xu, "Impact of background traffic on performance of high-speed TCP variant protocols", Computer Networks vol. 51, no. 7, pp. 1748-1762, DOI 10.1016/j.comnet.2006.11.005, , <https://doi.org/10.1016/j.comnet.2006.11.005>.
- Ha, S. and I. Rhee, "Taming the elephants: New TCP slow start", Computer Networks vol. 55, no. 9, pp. 2092-2110, DOI 10.1016/j.comnet.2011.01.014, , <https://doi.org/10.1016/j.comnet.2011.01.014>.
- Ha, S., Rhee, I., and L. Xu, "CUBIC: a new TCP-friendly high-speed TCP variant", ACM SIGOPS Operating Systems Review vol. 42, no. 5, pp. 64-74, DOI 10.1145/1400097.1400105, , <https://doi.org/10.1145/1400097.1400105>.
- Kelly, T., "Scalable TCP: improving performance in highspeed wide area networks", ACM SIGCOMM Computer Communication Review vol. 33, no. 2, pp. 83-91, DOI 10.1145/956981.956989, , <https://doi.org/10.1145/956981.956989>.
- Lukaseder, T., Bradatsch, L., Erb, B., Van Der Heijden, R., and F. Kargl, "A Comparison of TCP Congestion Control Algorithms in 10G Networks", 2016 IEEE 41st Conference on Local Computer Networks (LCN), DOI 10.1109/lcn.2016.121, , <https://doi.org/10.1109/lcn.2016.121>.
- Liu, K. and J. Lee, "On Improving TCP Performance over Mobile Data Networks", IEEE Transactions on Mobile Computing vol. 15, no. 10, pp. 2522-2536, DOI 10.1109/tmc.2015.2500227, , <https://doi.org/10.1109/tmc.2015.2500227>.
- Ludwig, R. and M. Meyer, "The Eifel Detection Algorithm for TCP", RFC 3522, DOI 10.17487/RFC3522, , <https://www.rfc-editor.org/rfc/rfc3522>.
- Floyd, S., "HighSpeed TCP for Large Congestion Windows", RFC 3649, DOI 10.17487/RFC3649, , <https://www.rfc-editor.org/rfc/rfc3649>.
- Blanton, E. and M. Allman, "Using TCP Duplicate Selective Acknowledgement (DSACKs) and Stream Control Transmission Protocol (SCTP) Duplicate Transmission Sequence Numbers (TSNs) to Detect Spurious Retransmissions", RFC 3708, DOI 10.17487/RFC3708, , <https://www.rfc-editor.org/rfc/rfc3708>.
- Floyd, S., "Limited Slow-Start for TCP with Large Congestion Windows", RFC 3742, DOI 10.17487/RFC3742, , <https://www.rfc-editor.org/rfc/rfc3742>.
- Mathis, M., Dukkipati, N., and Y. Cheng, "Proportional Rate Reduction for TCP", RFC 6937, DOI 10.17487/RFC6937, , <https://www.rfc-editor.org/rfc/rfc6937>.
- Fairhurst, G., Sathiaseelan, A., and R. Secchi, "Updating TCP to Support Rate-Limited Traffic", RFC 7661, DOI 10.17487/RFC7661, , <https://www.rfc-editor.org/rfc/rfc7661>.
- Rhee, I., Xu, L., Ha, S., Zimmermann, A., Eggert, L., and R. Scheffenegger, "CUBIC for Fast Long-Distance Networks", RFC 8312, DOI 10.17487/RFC8312, , <https://www.rfc-editor.org/rfc/rfc8312>.
- Khademi, N., Welzl, M., Armitage, G., and G. Fairhurst, "TCP Alternative Backoff with ECN (ABE)", RFC 8511, DOI 10.17487/RFC8511, , <https://www.rfc-editor.org/rfc/rfc8511>.
- Iyengar, J., Ed. and M. Thomson, Ed., "QUIC: A UDP-Based Multiplexed and Secure Transport", RFC 9000, DOI 10.17487/RFC9000, , <https://www.rfc-editor.org/rfc/rfc9000>.
- Stewart, R., Tüxen, M., and K. Nielsen, "Stream Control Transmission Protocol", RFC 9260, DOI 10.17487/RFC9260, , <https://www.rfc-editor.org/rfc/rfc9260>.
- Sun, W., Xu, L., Elbaum, S., and D. Zhao, "Model-Agnostic and Efficient Exploration of Numerical Congestion Control State Space of Real-World TCP Implementations", IEEE/ACM Transactions on Networking vol. 29, no. 5, pp. 1990-2004, DOI 10.1109/tnet.2021.3078161, , <https://doi.org/10.1109/tnet.2021.3078161>.
- Xu, L., Harfoush, K., and I. Rhee, "Binary increase congestion control (BIC) for fast long-distance networks", IEEE INFOCOM 2004, DOI 10.1109/infcom.2004.1354672, , <https://doi.org/10.1109/infcom.2004.1354672>.
Appendix A. Acknowledgments
Richard Scheffenegger and Alexander Zimmermann originally co-authored [RFC8312].¶
These individuals suggested improvements to this document:¶
Mohit P. Tahiliani¶
Appendix B. Evolution of CUBIC
B.1. Since draft-ietf-tcpm-rfc8312bis-14
B.2. Since draft-ietf-tcpm-rfc8312bis-13
- Add contents of https://cse.unl.edu/~xu/avg_cubic_cwnd.pdf to Appendix C.¶
- Multiple comments from Martin, define synchronized/asynchronized loss model, clean up 3465 reference, clarficiation for when Cubic is not in Reno-friendly region, referring to proof of avg Cubic window, better text for misbehaving nodes and fix typo in cwndepoch. (#158)¶
B.3. Since draft-ietf-tcpm-rfc8312bis-12
B.4. Since draft-ietf-tcpm-rfc8312bis-11
B.5. Since draft-ietf-tcpm-rfc8312bis-10
B.6. Since draft-ietf-tcpm-rfc8312bis-09
B.7. Since draft-ietf-tcpm-rfc8312bis-08
B.8. Since draft-ietf-tcpm-rfc8312bis-07
B.9. Since draft-ietf-tcpm-rfc8312bis-06
B.10. Since draft-ietf-tcpm-rfc8312bis-05
- Clarify meaning of "application-limited" in Section 5.8 (#137)¶
- Create new subsections for spurious timeouts and spurious loss via ACK (#90)¶
- Brief discussion of convergence in Section 5.6 (#96)¶
- Add more test results to Section 5 and update some references (#91)¶
- Change wording around setting ssthresh (#131)¶
B.11. Since draft-ietf-tcpm-rfc8312bis-04
- Fix incorrect math (#106)¶
- Update RFC5681 (#99)¶
- Rephrase text around algorithmic alternatives, add HyStart++ (#85, #86, #90)¶
- Clarify what we mean by "new ACK" and use it in the text in more places. (#101)¶
- Rewrite the Responses to Sudden or Transient Events section (#98)¶
- Remove confusing text about cwndepoch in Section 4.2 (#100)¶
- Change terminology from "AIMD" to "Reno" (#108)¶
- Moved MUST NOT from app-limited section to main cubic AI section (#97)¶
- Clarify cwnd decrease during multiplicative decrease (#102)¶
- Clarify text around queuing and slow adaptation of CUBIC in wireless environments (#94)¶
- Set lower bound of cwnd to 1 MSS and use retransmit timer thereafter (#83)¶
- Use FlightSize instead of cwnd to update ssthresh (#114)¶
B.12. Since draft-ietf-tcpm-rfc8312bis-03
B.13. Since draft-ietf-tcpm-rfc8312bis-02
- Description of packet loss rate p (#65)¶
- Clarification of TCP Friendly Equation for ABC and Delayed ACK (#66)¶
- add applicability to QUIC and SCTP (#61)¶
- clarity on setting alphaaimd to 1 (#68)¶
- introduce alphacubic (#64)¶
- clarify cwnd growth in convex region (#69)¶
- add guidance for using bytes and mention that segments count is decimal (#67)¶
- add loss events detected by RACK and QUIC loss detection (#62)¶
B.14. Since draft-ietf-tcpm-rfc8312bis-01
B.15. Since draft-ietf-tcpm-rfc8312bis-00
- use updated xml2rfc with better text rendering of subscripts¶
B.16. Since draft-eggert-tcpm-rfc8312bis-03
B.17. Since draft-eggert-tcpm-rfc8312bis-02
B.18. Since draft-eggert-tcpm-rfc8312bis-01
- rename TCP-Friendly to AIMD-Friendly and rename Standard TCP to AIMD TCP to avoid confusion as CUBIC has been widely used on the Internet. (#38)¶
- change introductory text to reflect the significant broader deployment of CUBIC on the Internet. (#39)¶
- rephrase introduction to avoid referring to variables that have not been defined yet.¶
B.19. Since draft-eggert-tcpm-rfc8312bis-00
- acknowledge former co-authors (#15)¶
- prevent cwnd from becoming less than two (#7)¶
- add list of variables and constants (#5, #6)¶
- update K's definition and add bounds for CUBIC target cwnd [SXEZ19] (#1, #14)¶
- update West to use AIMD approach (#20)¶
B.20. Since RFC8312
B.21. Since the Original Paper
CUBIC has gone through a few changes since the initial release [HRX08] of its algorithm and implementation. This section highlights the differences between the original paper and [RFC8312].¶
- The original paper [HRX08] includes the pseudocode of CUBIC implementation using Linux's pluggable congestion control framework, which excludes system-specific optimizations. The simplified pseudocode might be a good source to start with and understand CUBIC.¶
- [HRX08] also includes experimental results showing its performance and fairness.¶
- The definition of betacubic constant was changed in [RFC8312]. For example, betacubic in the original paper was the window decrease constant while [RFC8312] changed it to CUBIC multiplication decrease factor. With this change, the current congestion window size after a congestion event in [RFC8312] was betacubic * Wmax while it was (1-betacubic) * Wmax in the original paper.¶
- Its pseudocode used Wlast_max while [RFC8312] used Wmax.¶
- Its AIMD-friendly window was Wtcp while [RFC8312] used West.¶
Appendix C. Proof of the Average CUBIC Window Size
This appendix contains a proof for the average CUBIC window size AVG_Wcubic in Figure 6.¶
We find AVG_Wcubic under a deterministic loss model, where the number of packets between two successive packet losses is 1/p. With this model, CUBIC always operates with the concave window profile and the time period between two successive packet losses is K.¶
The average window size AVG_Wcubic is defined as follows, where the numerator 1/p is the total number of packets between two successive packet losses, and the denominator K/RTT is the total number of RTTs between two successive packet losses.¶
Below, we find K as a function of CUBIC parameters βcubic and C, and network parameters p and RTT. According to the definition of K in Figure 2, we have¶
The total number of packets between two successive packet losses can also be obtained as follows using the window increase function in Figure 1. Specifically, the window size in the first RTT (i.e., n=1 or equivalently t=0) is C(-K)3+Wmax and the window size in the last RTT (i.e., n=K/RTT or equivalently t=K-RTT) is C(-RTT)3+Wmax.¶
After solving Figure 10 and Figure 11 for K and Wmax, we have¶
The average CUBIC window size AVG_Wcubic can be obtained by substituting K with Figure 12 in Figure 9¶