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Versions: 00 01 02                                                      
Internet Research Task Force                                   J. Levine
Internet-Draft                                      Taughannock Networks
Intended status: Experimental                             March 14, 2011
Expires: September 15, 2011


    An efficient method to publish ranges of IP addresses in the DNS
                       draft-levine-iprangepub-02

Abstract

   The DNS has long been used to publish lists of IPv4 address ranges in
   blacklists and whitelists.  The size of the IPv6 address space makes
   the entry-per-IP approach used for IPv4 lists impractical.  A new
   technique for publishing IP address ranges is described.  It is
   intended to permit efficient publishing and querying, and to have
   good DNS cache behavior.

Status of this Memo

   This Internet-Draft is submitted in full conformance with the
   provisions of BCP 78 and BCP 79.

   Internet-Drafts are working documents of the Internet Engineering
   Task Force (IETF).  Note that other groups may also distribute
   working documents as Internet-Drafts.  The list of current Internet-
   Drafts is at http://datatracker.ietf.org/drafts/current/.

   Internet-Drafts are draft documents valid for a maximum of six months
   and may be updated, replaced, or obsoleted by other documents at any
   time.  It is inappropriate to use Internet-Drafts as reference
   material or to cite them other than as "work in progress."

   This Internet-Draft will expire on September 15, 2011.

Copyright Notice

   Copyright (c) 2011 IETF Trust and the persons identified as the
   document authors.  All rights reserved.

   This document is subject to BCP 78 and the IETF Trust's Legal
   Provisions Relating to IETF Documents
   (http://trustee.ietf.org/license-info) in effect on the date of
   publication of this document.  Please review these documents
   carefully, as they describe your rights and restrictions with respect
   to this document.  Code Components extracted from this document must
   include Simplified BSD License text as described in Section 4.e of
   the Trust Legal Provisions and are provided without warranty as



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   described in the Simplified BSD License.


Table of Contents

   1.  Introduction . . . . . . . . . . . . . . . . . . . . . . . . .  3
   2.  Assumptions and Goals  . . . . . . . . . . . . . . . . . . . .  4
   3.  B-tree data structure  . . . . . . . . . . . . . . . . . . . .  5
   4.  DNS record format  . . . . . . . . . . . . . . . . . . . . . .  6
   5.  Handling enclosing ranges  . . . . . . . . . . . . . . . . . .  7
   6.  Lookup algorithm . . . . . . . . . . . . . . . . . . . . . . .  7
   7.  Details of block representation  . . . . . . . . . . . . . . .  8
     7.1.  Return values  . . . . . . . . . . . . . . . . . . . . . .  9
   8.  Building and updating DNSxLs . . . . . . . . . . . . . . . . .  9
     8.1.  Building static DNSxLs . . . . . . . . . . . . . . . . . .  9
     8.2.  Building and updating dynamic DNSxLs . . . . . . . . . . . 10
   9.  Estimated performance  . . . . . . . . . . . . . . . . . . . . 11
   10. Security considerations  . . . . . . . . . . . . . . . . . . . 12
   11. Topics for further consideration . . . . . . . . . . . . . . . 12
   12. IANA considerations  . . . . . . . . . . . . . . . . . . . . . 13
   13. References . . . . . . . . . . . . . . . . . . . . . . . . . . 13
     13.1. References - Normative . . . . . . . . . . . . . . . . . . 13
     13.2. References - Informative . . . . . . . . . . . . . . . . . 13
   Appendix A.  Change Log  . . . . . . . . . . . . . . . . . . . . . 13
     A.1.  Changes from -01 to -02  . . . . . . . . . . . . . . . . . 14
     A.2.  Changes from -00 to -01  . . . . . . . . . . . . . . . . . 14
   Author's Address . . . . . . . . . . . . . . . . . . . . . . . . . 14
























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1.  Introduction

   For many years, the Domain Name System[RFC1034] [RFC1035] has been
   the Internet's de facto distributed database.  Blacklists and
   whitelists of IPv4 addresses have been published in the DNS using a
   simple system adapted from rDNS[RFC5782].  A DNSxL (a DNSBL or DNSWL)
   is a DNS sub-tree, typically also a DNS zone, with each listed IP
   having an A and/or TXT record at a name corresponding to the IP
   address.  While this publication method has worked well for IPv4
   addresses, the size of the IPv6 address space makes an analogous
   approach unworkable.

   In an IPv4 Internet, each network is typically limited to a few
   thousand or at most a few million addresses.  A single host typically
   has a single address, or at most a few hundred addresses.  The
   limited size of each network forces a host to use its assigned
   address or addresses.  In IPv6 networks, hosts typically use
   Stateless Address Autoconfiguration [RFC4862] to select an IP
   address, with the low 64 bits of the address being almost entirely
   arbitrary.  A hostile host sending mail can easily switch to a new
   address for every message it sends, never reusing an address, due to
   the vast size of the IPv6 address space.

   An IPv6 DNSxL organized like an IPv4 DNSxL with a record per address
   could use wildcards or a specialized server such as rbldnsd [RBLDNSD]
   to list entire /64 or larger ranges, but that does not help DNS
   performance.  Since wildcards are expanded by the DNS server, every
   query for a unique IP address causes a unique query to the DNSxL's
   server.  Moreover, every unique query will take up a cache entry in
   the client's local DNS cache, either a regular entry if the DNSxL
   lists the query's address, or a negative entry[RFC2308] if it
   doesn't.  In the event that hostile mailers (which we will call
   "spammers" for short) use a unique address per message, the normal
   DNSxL query traffic will both flood the DNSxL's server and fill local
   caches with useless single-use entries, forcing out other cached data
   and causing excess traffic to all the other servers the caches query
   as well.

   For blacklists, an obvious approach would be to limit the granularity
   of DNSxLs, so that, say, each /64 had a separate listing, and the
   queries only used the high 64 bits of each address.  This arguably
   could limit the damage from DNSxL queries (although even a 64 address
   is plenty to swamp caches) it is not helpful for DNS whitelists,
   which by their nature list individual IP addresses, and are likely to
   be far more popular with IPv6 mail than they have been with IPv4
   mail.

   The problem of looking up an address in a sorted list of IP addresses



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   stored on a remote DNS server is not unlike the problem of searching
   for a key in a sorted list of keys stored on a disk, a problem that
   is common in database applications.  An approach called _B-trees_ has
   been widely used in databases since the 1970s, and is described in
   standard references such as [KNUTHV3].  The technique in this
   document stores ordered sets of IP address ranges in DNS records,
   using TXT records as a containers for binary data.  The technique is
   a straightforward adaptation of the way that B-trees store ordered
   sets of key strings in disk blocks.


2.  Assumptions and Goals

   This design is intended to meet this set of design goals:

   1.  Handle arbitrary mixtures of prefix ranges and individual IPs.

   2.  Handle overlapping ranges, and exception entries.  (It is typical
       for a single instance of rbldnsd to serve copies of several
       DNSxLs and to return answers from all of the DNSxLs that have
       entries matching a query.)  Each range can be tagged with an
       entry type, and the answer includes the tag.

   3.  Work well with existing DNS servers and caches.  The number of
       different queries should be limited, both to limit cache->server
       traffic and the number of cache entries the DNSxL uses.  I assume
       that client->cache queries are cheap, while cache->server queries
       are much more expensive, so it is a worthwhile tradeoff to
       increase the number of the former to decrease the number of the
       latter.

   4.  Don't assume senders will be well behaved.  In particular,
       spammers may use a unique IPv6 address for every message, hopping
       around within each /64 (or whatever the network size is) in which
       a zombie lives, and there will be many zombies active at the same
       time.

   5.  Don't assume MTAs remember query results from one lookup to the
       next, so the necessary info should be available in the DNS cache.
       (If they do, it doesn't hurt.)

   6.  Be compatible with DNSSEC, but don't depend on DNSSEC.

   7.  Don't attempt to be compatible with existing DNSxLs at the query
       level, but do provide a client API similar to the one for
       existing DNSxLs.  I expect these lists will mostly be served from
       something like rbldnsd, although it would also be possible to
       have an external program create the zone files and serve them



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       from a conventional DNS server such as BIND.


3.  B-tree data structure

   The goal is to see if a particular address is in one of the ranges.
   If we could retrieve the whole list in one query, it'd be easy to do
   a binary search of the list, but any useful DNSxL is much too big to
   store in one block.  So a b-tree breaks the list into a tree of
   blocks, so you can do the binary search block by block.

   As an example, the figure below shows simple two-level b-tree.  It's
   a tree of blocks, where each block contains an ordered set of values.
   The number of ranges can vary from one block to another, since I use
   a variable length encoding.)  The example below is two levels; DNSxLs
   represented as B-trees turn out to need between 2 and 5 levels.

   In each non-leaf record, there is conceptually a lower level record
   between each pair of entries.  So in the example below, if you were
   looking for 29, you'd look in the top record, see it's not there but
   it's between 25 and 34, so you look at the record after 25, then see
   it's between 28 and 30.  If this weren't a leaf, there'd be another
   record under 28, but since it is a leaf, you know you didn't find it.


                         0
                         |
                         10 16 25 34 50
                           |  |  |  |
   +-----------------------+  |  |  +--------------+
   |                +-------- +  +---+             |
   |                |                |             |
   11 12 13 14 15   17 18 19 20 21   27 28 30 32   37 38 39 44 45

   In a conventional B-tree, each record is a disk block, and the
   pointers are explicitly stored in each record, typically as a disk
   block number.  But this b-tree is stored in the DNS, where each
   record has a name.  Rather than invent pseudo-block numbers to use as
   names, I use the entry that points to the block.  So the lower blocks
   in the example above would be named 10, 16, 25, and 34.  The root
   block is always named 0.

   Since the entries in a DNSBL are actually ranges of IP addresses,
   each one is represented as the base address of the range, and a
   bitmask length.  For an IPv4 DNSxL, the ranges are CIDR ranges, and
   the bitmask length is the CIDR size, e.g., in 192.168.40.0/23 the
   base address is 192.168.40.0 and the mask length is 23.  If the mask
   length is the length of the address (32 for IPv4 or 128 for IPv6, the



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   range is a single address.


4.  DNS record format

   A DNSxL is logically an ordered list of of IP address ranges.  The
   ranges are in address order from lowest to highest.  If one range
   encloses another, the ranges are ordered by the base aaddress of each
   range.  Ranges with the base same adddress are ordered from shortest
   to longest mask length.

   Each DNS record is a block of bytes representing an ordered sub-list
   of IP address ranges, Each range also includes a byte saying what
   kind of entry it is, i.e., what value to return to a client, and a
   one-bit exception saying that this entry is an exception to an
   enclosing range with the same value.

   Since each DNS record has to have a name, the name is a text version
   of the IP address of the range immediately preceding the first range
   in the record.  In this context, there is no advantage to doing rDNS-
   style nibble reversed naming, so the name is just 32 ASCII characters
   for an IPv6 DNSxL or 8 characters for an IPv4 DNSxL, the address as a
   hex number.  One block is the root of the B-tree, which is named with
   all zeros, such as 00000000000000000000000000000000.dnsxl.example or
   00000000.dnsxl.example.

   In order to improve performance, each block representing a list of
   ranges is stored in the DNS in a binary form using prefix and suffix
   compression.  The simplest way to store a block of arbitrary bytes in
   the DNS is as a TXT record, with all the strings in the record
   concatenated.  The more entries that fit in a block, the better this
   will work, so to make the best use of space, each of the strings
   other than the last should be the maxmum length, 255 bytes.  Note
   that despite its name, the contents of the strings in a TXT record
   can be arbitrary binary data, so although the text form of the
   records may look rather ugly in a master file, they will work fine in
   the DNS.  (If this design catches on, it might be worth defining an
   RR type for it to avoid scaring people who expect TXT records to be
   readable text.)

   Each block contains a set of the ranges that are in the DNSxL.  For
   blocks that are not leaves of the B-tree (identified by a per-block
   flag, described below), the the entries in the block also partition
   the address space, with the ranges between the ones in the current
   block in sub-blocks, each named by the entries in the current block.

   To minimize edge cases, the root block always contains the lowest and
   highest entries.  In other blocks, there can be sub-blocks between



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   each pair of ranges, but not before the first range or after the
   last.  In other words, the last range in a block is not used as the
   name of a sub-block.


5.  Handling enclosing ranges

   Since one range can enclose another, and some ranges enclose
   exception ranges, a search has to find not just one entry that
   contains an address, but all the ranges that contain the address.  In
   order to avoid having to walk up and down the tree of blocks, each
   block also includes copies any ranges that enclose the first range in
   the block.  This ensures that a search of a block will return all the
   values for ranges within the block.

   Note that the copied ranges have addresses equal or less to the name
   of the block's record, while the other ranges in the block have
   addresses greater than the name of the block.  Hence it is easy to
   identify copied enclosing ranges, and they need not be specially
   marked in the encoded version of the block.


6.  Lookup algorithm

   A client looks up an IP address in the DNSxL as follows:

   1.  Make the root block the current block and fetch it.  Note that
       there are no matches found so far.

   2.  Search through the current block for the highest-addressed range
       entry that contains the target IP address.  Also note any
       preceding ranges that also contain the target address.  If there
       are amy matches, discard any previous set of matches, and
       remember these matches.

   3.  If the IP address is lower than the first range in the current
       block (disregarding copied ranges), or higher than the last
       range, stop.

   4.  If this is a leaf block, stop.

   5.  Find the range in the current block whose address is just below
       the target IP.  Use the address of that range as the name of new
       block, fetch that block, and make it the current one.

   6.  Go to Paragraph 2.

   The result of this algorithm is a possibly empty set of matches.



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   Some of the matches may be exceptions; if so delete both the
   exception and the preceding non-exception match with the same value.
   If there are any remaining matches, the address is present in the
   DNSxL, so return all of the values for the remaining matches.  If
   not, the address is not present in the DNSxL.

   It should be evident that this is analogous to a binary tree search,
   except that each node has a lot more than two descendants.


7.  Details of block representation

   The first byte of each block is a flag byte, with the bits
   interpreted as follows:

   L P P P P P P P

   The L bit is set if this is a leaf.  The PPPPPPP is a seven-bit
   number which is the implicit prefix size.  If all of the addresses in
   the block have the same initial bits as the name of the block does,
   which is fairly likely since DNSxL entries often occur in clusters,
   the implicit prefix size is the number of common initial bits.  The
   common prefix bits are not stored in the block's entries, but are
   logically prefixed to each address in the block.  An implicit prefix
   size of zero means no implicit prefix.

   After that is some number of ranges:

   X S S S S S S S (one byte)
   Value (one byte)
   Address (zero to 16 bytes)

   The high bit first byte (X) X is the eXception flag, and means that
   this range is an exception entry.  SSSSSSS is 0-127 (IPv6) or 0-31
   (IPv4), the mask size minus one.  The value is one byte, the details
   of which are discussed below.  The Address is 128-P-S or 32-P-S bits
   long, rounded up to a byte.  That is, it omits the implicit prefix
   bits which are obtained from the name of the block, and the bits
   beyond the prefix size.  For copied ranges, the mask size may be the
   same as or less than the implicit prefix size, in which case there
   are no address bytes in the entry, and the address bits are all taken
   from the implicit prefix.

   For example, say an entry is 2001:0DB8:5678:9ABC::/64, the implicit
   prefix size is 16 bits, and the value is hex 42.  Then the entry
   would be (in hex)

   3f 42 0D B8 56 78 9A BC



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   The 3f is the prefix size (64-1), 42 is the the 2001 is omitted since
   that's the common prefix, and the rest is the address.

   Each block should be the as large as can fit in a DNS answer.  If you
   don't believe in EDNS0, the limit is about 450 bytes.  If you do
   believe in EDNS0, it's whatever size you think clients ask for,
   probably about 4000 bytes.

7.1.  Return values

   DNSBLs traditionally can return A and TXT records.  The A records are
   the range 127.x.x.x, the TXT records can be arbitrary text that may
   be the same for all records, or customized to some extent per record.
   In practice, it is rare for a DNSxL to use a large number of
   different values.  Hence the values in this encoding are a single
   byte, used to look up the values to return.

   To look up a return value, do a DNS lookup of a record whose name is
   the letter V followed by the two-digit hex representation of the
   value, e.g., V00.dnsxl.example, for value zero.  Use its A and TXT
   records as the return value.  The most common TXT record
   customization is to insert the looked-up address.  In keeping with
   common software practice, a dollar sign in the TXT record is replaced
   by the text form of the IP address before returning it to the client
   application.

   Note: this is not entirely satisfactory.  Some DNSBLs are keyed to a
   listing database, and use a database record ID rather than the IP
   address to customize the TXT record.  It might be necessary to invent
   some sort of macro expansion scheme, with the macros in the TXT
   record and the values to be inserted included in each range's encoded
   entry.


8.  Building and updating DNSxLs

   DNSxLs are compiled as a list of ranges (prefix and length), and
   values.  They must be turned into a tree of named blocks before being
   served in the DNS.  The technique varies a little depending on
   whether the tree will be updated incrementally, or rebuilt from
   scratch if it changes.

8.1.  Building static DNSxLs

   A static DNSxL should have the minimum number of blocks, each of
   which should be as full as possible.  The technique to build the tree
   is a direct adaptation of the B-tree building technique in [WPBTREE].




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   Start with a sorted list of prefix entries.  Save one entry for the
   next pass, then take as many entries as possible and make a tentative
   block out of them.  Repeat saving an entry and creating a block until
   all entries are used.  These will be the leaf blocks.  Now, take the
   list of saved entries and repeat to create tentative blocks at the
   next level up.  To preserve the identity that there are no entries
   covered by a block's range before the first entry in the block or
   after the last entry, before creating each block, it's necessary to
   promote the first and last entries covered by the block into the
   block A way to do this is to recursively "borrow" the first from the
   first sub-block, which in turn borrows the last entry from its first
   sub-block, all the way down to the leaf.  Then do the same recursive
   procedure for the last entry in the last sub-block.  Keep repeating
   to create each level of the tree until the process creates only one
   block.  Eventually, a pass will create a single block, which is the
   root.

   Before encoding each block, insert copies of the ranges that enclose
   the first range in the block.  A way to do this is to make a linear
   pass through the entire sorted list of ranges before starting to
   create the blocks, and each entry inside an enclosing range making a
   link to the entry that encloses it.  (This can be done in linear time
   by keeping a stack of currently "open" enclosing ranges and linking
   to the range at the top of the stack.)  Then when encoding the block,
   following the links from the first range in the block will find the
   enclosing ranges that need to be copied.

   When the list changes, rebuild it from scratch.

8.2.  Building and updating dynamic DNSxLs

   One of the reasons that B-trees are so widely used is that it is
   possible to update them efficiently without rebuilding them.  The
   same should apply here.

   The general approach to updates is to add or delete an entry, then if
   that makes a block too big or makes it empty, rebalance the tree to
   fix the problem.  If a block is too big, move entries into an
   adjacent block if possible, otherwise split the block.  This will
   require updating the block above, which in turn might overflow if the
   update involves adding rather than replacing an entry.  (It might
   overflow even with a replacement if it makes the compressible prefix
   shorter.)  In that case, repeat the process, potentially all the way
   to the root.  When deleting an entry, if the block becomes empty,
   move its pointer entry from the block above up into one of the
   adjacent blocks, then adjust the upper block as needed.  Again, this
   might cause overflow in which case move entries between blocks or
   split the full one.



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   A tree in which each block is completely full is quite expensive to
   update.  The first insertion will cause a leaf to overflow, with
   overflows rippling all way up the tree to the root.  It would
   probably be a good idea when building a list that is intended to be
   updated to leave some slack space in each block, to limit the ripple
   effect from changes.  The enclosing ranges also need to be updated.

   A significant difference between this design and a conventional
   B-tree is the version skew due to DNS caching.  In a normal B-tree,
   the pages (blocks) are locked while being changed, and the changes
   are immediately visible to all the clients.  In this case, the
   clients cache each block for the DNS TTL.  If updates change the
   entries in non-leaf blocks, they will break the links between blocks
   since they use the entries as pointers.  A possible band-aid is to
   add temporary CNAME records at the former names pointing to the
   closest new name, so most (admittedly not all) of the entries can
   still be located.  Once the TTL on the old blocks has expired, the
   CNAMEs can be deleted.


9.  Estimated performance

   The size of entries varies depending on the length of the prefixes
   and the amount of common prefix compression.  A /64 with no common
   prefix would take 9 bytes, so I'll use 10 bytes as an estimate of
   average entry size.  With EDNS0 and 4K records, that would allow 400
   entries per block.  A two-level tree could hold 160,000 entries, a
   three level tree 64 million entries, which would need 160,000 blocks.
   Large v4 DNSxLs like the CBL have about seven million entries now, so
   this should be adequate.  If blocks have to fit in 512 byte
   responses, that would be about 40 entries per block.  A five-level
   tree could hold 100 million entries in about 2.5 million blocks,
   still adequate.

   The number of queries for any particular lookup is the number of
   levels, which is unlikely to be more than five in a DNSxL of
   plausible size.  The cache behavior obviously depends on both the
   layout of the entries and the query pattern, but this design avoids
   some obvious worst cases.  If a /64 is either entirely listed, not
   listed at all, or just has a single /128 listed, all queries for
   addresses in that /64 will refetch the same four or five records.  If
   a large range of addresses is either listed in one prefix, or not
   listed at all, all queries will refetch the same set of blocks, which
   would be likely to be cached.

   The total number of DNS records used is always less than the number
   of records for a traditional entry-per-IP DNSxL for the same set of
   entries.  Since all the DNS queries are made by following the tree of



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   entries, clients shouldn't make queries that fail, so there will be
   no negative cache entries.  (This isn't quite true due to version
   skew in updated DNSxLs, but it's hard to imagine a plausible scenario
   in which there would be a lot of different failing queries.)  This
   suggests that the overall cache behavior will be no worse than, and
   quite possibly much better than the behavior of traditional IPv4
   DNSxLs.

   Some preliminary tests using traces of real mail server connection
   data and 15 minute TTLs suggest that hit rates will be about 80% for
   DNSxLs that include individual addresses, and close to 100% for
   DNSxLs that include large ranges.


10.  Security considerations

   Semantically, there is little difference between a DNSxL published
   using this scheme and one published using the traditional entry per
   IP approach, since both publish the operator's opinion about some
   subset of the IP address space.

   One significant practical difference is that it is much easier for
   clients to obtain copies of all or part of the database.  For a
   traditional DNSxL, the only way to determine its contents is to query
   the entire address space (or at least the active part of it) one
   address at a time, which would require several billion queries for
   IPv4, and is deterred by rate limiting the queries.  In this scheme,
   the names of all of the DNS records are easy for clients to
   determine, so they can efficiently walk the tree.  While rate
   limiting is possible, it is less effective since clients fetch more
   data with each query.  It is also easy for a client to fetch all the
   entries for a particular IP range, such as the range of a network the
   client controls to see what parts of it are blacklisted.


11.  Topics for further consideration

   o  There might be better ways to do prefix compression, e.g., a per-
      entry field that says how many bits are the same as the previous
      entry.  Entries in blocks could be bit rather than byte aligned,
      although I expect that would be a lot more work for minimal extra
      compression.  There may be clever tricks to allocate entries into
      blocks to maximize the size of the prefix in each block.  If a
      block consists entirely of /128's it might be worth a special
      case, leaving out the length byte on each entry.

   o  When adding a new entry to a full leaf block, another possibility
      would be to make the block a non-leaf, and create two new leaves



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      below it.  This would make updates faster and less disruptive, at
      the cost of possibly slower lookups since some parts of the tree
      will be deeper.  Perhaps a hybrid approach would make sense,
      rebuild or rebalance the tree when it gets too ragged, with more
      than a one-level depth difference between the deepest and
      shallowest leaves.


12.  IANA considerations

   This document makes no requests to IANA.  All data are stored and
   queried using existing DNS record types and operations.


13.  References

13.1.  References - Normative

   [RFC1034]  Mockapetris, P., "Domain names - concepts and facilities",
              STD 13, RFC 1034, November 1987.

   [RFC1035]  Mockapetris, P., "Domain names - implementation and
              specification", STD 13, RFC 1035, November 1987.

13.2.  References - Informative

   [KNUTHV3]  Knuth, D., "The Art of Computer Programming: Volume 3,
              Sorting and Searching", 1998.

   [RBLDNSD]  Tokarev, M., "rbldnsd: Small Daemon for DNSBLs".

   [RFC2308]  Andrews, M., "Negative Caching of DNS Queries (DNS
              NCACHE)", RFC 2308, March 1998.

   [RFC4862]  Thomson, S., Narten, T., and T. Jinmei, "IPv6 Stateless
              Address Autoconfiguration", RFC 4862, September 2007.

   [RFC5782]  Levine, J., "DNS Blacklists and Whitelists", RFC 5782,
              February 2010.

   [WPBTREE]  Wikipedia, "B-tree", December 2010.


Appendix A.  Change Log

   *NOTE TO RFC EDITOR: This section may be removed upon publication of
   this document as an RFC.*




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A.1.  Changes from -01 to -02

   Fix typos

A.2.  Changes from -00 to -01

   Change CIDRs to prefixes.  Allow for IPv4 addresses.

   Add possible updates producing unbalanced trees.


Author's Address

   John Levine
   Taughannock Networks
   PO Box 727
   Trumansburg, NY  14886

   Phone: +1 831 480 2300
   Email: standards@taugh.com
   URI:   http://jl.ly






























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