The Luleå algorithm, designed by harvtxt|Degermark|Brodnik|Carlsson|Pink|1997, is a
patented technique for storing and searching internet routing tables efficiently. It is named after the Luleå University of Technology, the home institute of the technique's authors. The name of the algorithm does not appear in the original paper describing it, but was used in a message from Craig Partridge to the Internet Engineering Task Forcedescribing that paper prior to its publication. [" [http://www1.ietf.org/mail-archive/web/ietf/current/msg01795.html second Europe trip for IETFers...] ", Craig Partridge to IETF, May 1, 1997.]
The key task to be performed in internet routing is to match a given
IPv4address (viewed as a sequence of 32 bits) to the longest prefixof the address for which routing information is available. This prefix matching problem may be solved by a trie, but trie structures use a significant amount of space (a node for each bit of each address) and searching them requires traversing a sequence of nodes with length proportional to the number of bits in the address. The Luleå algorithm shortcuts this process by storing only the nodes at three levels of the trie structure, rather than storing the entire trie.
The main advantage of the Luleå algorithm for the routing task is that it uses very little memory, averaging 4–5 bytes per entry for large routing tables. This small memory footprint often allows the entire data structure to fit into the routing processor's cache, speeding operations. However, it has the disadvantage that it cannot be modified easily: small changes to the routing table may require most or all of the data structure to be reconstructed.
The first level of the data structure consists of
bit vectorconsisting of 216 = 65536 bits, with one entry for each 16-bit prefix of an IPv4address. A bit in this table is set to one if there is routing information associated with that prefix or with a longer sequence beginning with that prefix, or if the given prefix is the first one associated with routing information at some higher level of the trie; otherwise it is set to zero.
* An array of sixteen-bit words for each nonzero bit in the bit vector. Each
datumeither supplies an index that points to the second-level data structure object for the corresponding prefix, or supplies the routing information for that prefix directly.
* An array of "base indexes", one for each consecutive subsequence of 64 bits in the bit vector, pointing to the first datum associated with a nonzero bit in that subsequence.
* An array of "code words", one for each consecutive subsequence of 16 bits in the bit vector. Each code word is 16 bits, and consists of a 10-bit "value" and a 6-bit "offset". The sum of the offset and the associated base index gives a pointer to the first datum associated with a nonzero bit in the given 16-bit subsequence. The 10-bit value gives an index into a "maptable" from which the precise position of the appropriate datum can be found.
To look up the datum for a given address "x" in the first level of the data structure, the Luleå algorithm computes three values:
#the base index at the position in the base index array indexed by the first 10 bits of "x"
#the offset at the position in the code word array indexed by the first 12 bits of "x"
#the value in maptable ["y"] ["z"] , where "y" is the maptable index from the code word array and "z" is bits 13–16 of "x"The sum of these three values provides the index to use for "x" in the array of items.
econd and third levels
The second and third levels of the data structure are structured similarly to each other; in each of these levels the Luleå algorithm must perform prefix matching on 8-bit quantities (bits 17–24 and 25–32 of the address, respectively). The data structure is structured in "chunks", each of which allows performing this prefix matching task on some subsequence of the address space; the data items from the first level data structure point to these chunks.
If there are few enough different pieces of routing information associated with a chunk, the chunk just stores the list of these routes, and searches through them by a single step of
binary searchfollowed by a sequential search. Otherwise, an indexing technique analogous to that of the first level is applied.
first1 = Mikael | last1 = Degermark
first2 = Andrej | last2 = Brodnik
first3 = Svante | last3 = Carlsson
first4 = Stephen | last4 = Pink
contribution = Small forwarding tables for fast routing lookups
title = Proceedings of the ACM SIGCOMM '97 conference on Applications, Technologies, Architectures, and Protocols for Computer Communication
pages = 3–14 | year = 1997 | doi = 10.1145/263105.263133.
inventor1-first = Mikael | inventor1-last = Degermark
inventor2-first = Andrej | inventor2-last = Brodnik
inventor3-first = Svante | inventor3-last = Carlsson
inventor4-first = Stephen | inventor4-last = Pink
title = Fast routing lookup system using complete prefix tree, bit vector, and pointers in a routing table for determining where to route IP datagrams
issue-date = 2001
patent-number = 6266706
country-code = US.
first1 = Deepankar | last1 = Medhi
first2 = Karthikeyan | last2 = Ramasamy
title = Network Routing: Algorithms, Protocols, and Architectures
publisher = Elsevier
year = 2007
isbn = 0120885883
pages = 510–513.
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