 Huffman coding

Char Freq Code space 7 111 a 4 010 e 4 000 f 3 1101 h 2 1010 i 2 1000 m 2 0111 n 2 0010 s 2 1011 t 2 0110 l 1 11001 o 1 00110 p 1 10011 r 1 11000 u 1 00111 x 1 10010 In computer science and information theory, Huffman coding is an entropy encoding algorithm used for lossless data compression. The term refers to the use of a variablelength code table for encoding a source symbol (such as a character in a file) where the variablelength code table has been derived in a particular way based on the estimated probability of occurrence for each possible value of the source symbol. It was developed by David A. Huffman while he was a Ph.D. student at MIT, and published in the 1952 paper "A Method for the Construction of MinimumRedundancy Codes".
Huffman coding uses a specific method for choosing the representation for each symbol, resulting in a prefix code (sometimes called "prefixfree codes", that is, the bit string representing some particular symbol is never a prefix of the bit string representing any other symbol) that expresses the most common source symbols using shorter strings of bits than are used for less common source symbols. Huffman was able to design the most efficient compression method of this type: no other mapping of individual source symbols to unique strings of bits will produce a smaller average output size when the actual symbol frequencies agree with those used to create the code. A method was later found to design a Huffman code in linear time if input probabilities (also known as weights) are sorted.^{[citation needed]}
For a set of symbols with a uniform probability distribution and a number of members which is a power of two, Huffman coding is equivalent to simple binary block encoding, e.g., ASCII coding. Huffman coding is such a widespread method for creating prefix codes that the term "Huffman code" is widely used as a synonym for "prefix code" even when such a code is not produced by Huffman's algorithm.
Although Huffman's original algorithm is optimal for a symbolbysymbol coding (i.e. a stream of unrelated symbols) with a known input probability distribution, it is not optimal when the symbolbysymbol restriction is dropped, or when the probability mass functions are unknown, not identically distributed, or not independent (e.g., "cat" is more common than "cta"). Other methods such as arithmetic coding and LZW coding often have better compression capability: both of these methods can combine an arbitrary number of symbols for more efficient coding, and generally adapt to the actual input statistics, the latter of which is useful when input probabilities are not precisely known or vary significantly within the stream. However, the limitations of Huffman coding should not be overstated; it can be used adaptively, accommodating unknown, changing, or contextdependent probabilities. In the case of known independent and identicallydistributed random variables, combining symbols together reduces inefficiency in a way that approaches optimality as the number of symbols combined increases.
Contents
History
In 1951, David A. Huffman and his MIT information theory classmates were given the choice of a term paper or a final exam. The professor, Robert M. Fano, assigned a term paper on the problem of finding the most efficient binary code. Huffman, unable to prove any codes were the most efficient, was about to give up and start studying for the final when he hit upon the idea of using a frequencysorted binary tree and quickly proved this method the most efficient.^{[1]}
In doing so, the student outdid his professor, who had worked with information theory inventor Claude Shannon to develop a similar code. Huffman avoided the major flaw of the suboptimal ShannonFano coding by building the tree from the bottom up instead of from the top down.
Problem definition
Informal description
 Given
 A set of symbols and their weights (usually proportional to probabilities).
 Find
 A prefixfree binary code (a set of codewords) with minimum expected codeword length (equivalently, a tree with minimum weighted path length from the root).
Formalized description
Input.
Alphabet , which is the symbol alphabet of size n.
Set , which is the set of the (positive) symbol weights (usually proportional to probabilities), i.e. .
Output.
Code , which is the set of (binary) codewords, where c_{i} is the codeword for .
Goal.
Let be the weighted path length of code C. Condition: for any code .Samples
Input (A, W) Symbol (a_{i}) a b c d e Sum Weights (w_{i}) 0.10 0.15 0.30 0.16 0.29 = 1 Output C Codewords (c_{i}) 010 011 11 00 10 Codeword length (in bits)
(l_{i})3 3 2 2 2 Weighted path length
(l_{i} w_{i} )0.30 0.45 0.60 0.32 0.58 L(C) = 2.25 Optimality Probability budget
(2^{li})1/8 1/8 1/4 1/4 1/4 = 1.00 Information content (in bits)
(−log_{2} w_{i}) ≈3.32 2.74 1.74 2.64 1.79 Entropy
(−w_{i} log_{2} w_{i})0.332 0.411 0.521 0.423 0.518 H(A) = 2.205 For any code that is biunique, meaning that the code is uniquely decodeable, the sum of the probability budgets across all symbols is always less than or equal to one. In this example, the sum is strictly equal to one; as a result, the code is termed a complete code. If this is not the case, you can always derive an equivalent code by adding extra symbols (with associated null probabilities), to make the code complete while keeping it biunique.
As defined by Shannon (1948), the information content h (in bits) of each symbol a_{i} with nonnull probability is
The entropy H (in bits) is the weighted sum, across all symbols a_{i} with nonzero probability w_{i}, of the information content of each symbol:
(Note: A symbol with zero probability has zero contribution to the entropy, since So for simplicity, symbols with zero probability can be left out of the formula above.)
As a consequence of Shannon's source coding theorem, the entropy is a measure of the smallest codeword length that is theoretically possible for the given alphabet with associated weights. In this example, the weighted average codeword length is 2.25 bits per symbol, only slightly larger than the calculated entropy of 2.205 bits per symbol. So not only is this code optimal in the sense that no other feasible code performs better, but it is very close to the theoretical limit established by Shannon.
Note that, in general, a Huffman code need not be unique, but it is always one of the codes minimizing L(C).
Basic technique
Compression
The technique works by creating a binary tree of nodes. These can be stored in a regular array, the size of which depends on the number of symbols, n. A node can be either a leaf node or an internal node. Initially, all nodes are leaf nodes, which contain the symbol itself, the weight (frequency of appearance) of the symbol and optionally, a link to a parent node which makes it easy to read the code (in reverse) starting from a leaf node. Internal nodes contain symbol weight, links to two child nodes and the optional link to a parent node. As a common convention, bit '0' represents following the left child and bit '1' represents following the right child. A finished tree has up to n leaf nodes and n − 1 internal nodes. A Huffman tree that omits unused symbols produces the most optimal code lengths.
The process essentially begins with the leaf nodes containing the probabilities of the symbol they represent, then a new node whose children are the 2 nodes with smallest probability is created, such that the new node's probability is equal to the sum of the children's probability. With the previous 2 nodes merged into one node (thus not considering them anymore), and with the new node being now considered, the procedure is repeated until only one node remains, the Huffman tree.
The simplest construction algorithm uses a priority queue where the node with lowest probability is given highest priority:
 Create a leaf node for each symbol and add it to the priority queue.
 While there is more than one node in the queue:
 Remove the two nodes of highest priority (lowest probability) from the queue
 Create a new internal node with these two nodes as children and with probability equal to the sum of the two nodes' probabilities.
 Add the new node to the queue.
 The remaining node is the root node and the tree is complete.
Since efficient priority queue data structures require O(log n) time per insertion, and a tree with n leaves has 2n−1 nodes, this algorithm operates in O(n log n) time, where n is the number of symbols.
If the symbols are sorted by probability, there is a lineartime (O(n)) method to create a Huffman tree using two queues, the first one containing the initial weights (along with pointers to the associated leaves), and combined weights (along with pointers to the trees) being put in the back of the second queue. This assures that the lowest weight is always kept at the front of one of the two queues:
 Start with as many leaves as there are symbols.
 Enqueue all leaf nodes into the first queue (by probability in increasing order so that the least likely item is in the head of the queue).
 While there is more than one node in the queues:
 Dequeue the two nodes with the lowest weight by examining the fronts of both queues.
 Create a new internal node, with the two justremoved nodes as children (either node can be either child) and the sum of their weights as the new weight.
 Enqueue the new node into the rear of the second queue.
 The remaining node is the root node; the tree has now been generated.
Although this algorithm may appear "faster" complexitywise than the previous algorithm using a priority queue, this is not actually the case because the symbols need to be sorted by probability beforehand, a process that takes O(n log n) time in itself.
In many cases, time complexity is not very important in the choice of algorithm here, since n here is the number of symbols in the alphabet, which is typically a very small number (compared to the length of the message to be encoded); whereas complexity analysis concerns the behavior when n grows to be very large.
It is generally beneficial to minimize the variance of codeword length. For example, a communication buffer receiving Huffmanencoded data may need to be larger to deal with especially long symbols if the tree is especially unbalanced. To minimize variance, simply break ties between queues by choosing the item in the first queue. This modification will retain the mathematical optimality of the Huffman coding while both minimizing variance and minimizing the length of the longest character code.
Here's an example using the French subject string "j'aime aller sur le bord de l'eau les jeudis ou les jours impairs":
Decompression
Generally speaking, the process of decompression is simply a matter of translating the stream of prefix codes to individual byte values, usually by traversing the Huffman tree node by node as each bit is read from the input stream (reaching a leaf node necessarily terminates the search for that particular byte value). Before this can take place, however, the Huffman tree must be somehow reconstructed. In the simplest case, where character frequencies are fairly predictable, the tree can be preconstructed (and even statistically adjusted on each compression cycle) and thus reused every time, at the expense of at least some measure of compression efficiency. Otherwise, the information to reconstruct the tree must be sent a priori. A naive approach might be to prepend the frequency count of each character to the compression stream. Unfortunately, the overhead in such a case could amount to several kilobytes, so this method has little practical use. If the data is compressed using canonical encoding, the compression model can be precisely reconstructed with just B2^{B} bits of information (where B is the number of bits per symbol). Another method is to simply prepend the Huffman tree, bit by bit, to the output stream. For example, assuming that the value of 0 represents a parent node and 1 a leaf node, whenever the latter is encountered the tree building routine simply reads the next 8 bits to determine the character value of that particular leaf. The process continues recursively until the last leaf node is reached; at that point, the Huffman tree will thus be faithfully reconstructed. The overhead using such a method ranges from roughly 2 to 320 bytes (assuming an 8bit alphabet). Many other techniques are possible as well. In any case, since the compressed data can include unused "trailing bits" the decompressor must be able to determine when to stop producing output. This can be accomplished by either transmitting the length of the decompressed data along with the compression model or by defining a special code symbol to signify the end of input (the latter method can adversely affect code length optimality, however).
Main properties
The probabilities used can be generic ones for the application domain that are based on average experience, or they can be the actual frequencies found in the text being compressed. (This variation requires that a frequency table or other hint as to the encoding must be stored with the compressed text; implementations employ various tricks to store tables efficiently.)
Huffman coding is optimal when the probability of each input symbol is a negative power of two. Prefix codes tend to have inefficiency on small alphabets, where probabilities often fall between these optimal points. "Blocking", or expanding the alphabet size by grouping multiple symbols into "words" of fixed or variablelength before Huffman coding helps both to reduce that inefficiency and to take advantage of statistical dependencies between input symbols within the group (as in the case of natural language text). The worst case for Huffman coding can happen when the probability of a symbol exceeds 2^{−1} = 0.5, making the upper limit of inefficiency unbounded. These situations often respond well to a form of blocking called runlength encoding; for the simple case of Bernoulli processes, Golomb coding is a provably optimal runlength code.
Arithmetic coding produces some gains over Huffman coding, although arithmetic coding has higher computational complexity. Also, arithmetic coding was historically a subject of some concern over patent issues. However, as of mid2010, various wellknown effective techniques for arithmetic coding have passed into the public domain as the early patents have expired.
Variations
Many variations of Huffman coding exist, some of which use a Huffmanlike algorithm, and others of which find optimal prefix codes (while, for example, putting different restrictions on the output). Note that, in the latter case, the method need not be Huffmanlike, and, indeed, need not even be polynomial time. An exhaustive list of papers on Huffman coding and its variations is given by "Code and Parse Trees for Lossless Source Encoding"[1].
nary Huffman coding
The nary Huffman algorithm uses the {0, 1, ... , n − 1} alphabet to encode message and build an nary tree. This approach was considered by Huffman in his original paper. The same algorithm applies as for binary (n equals 2) codes, except that the n least probable symbols are taken together, instead of just the 2 least probable. Note that for n greater than 2, not all sets of source words can properly form an nary tree for Huffman coding. In this case, additional 0probability place holders must be added. This is because the tree must form an n to 1 contractor; for binary coding, this is a 2 to 1 contractor, and any sized set can form such a contractor. If the number of source words is congruent to 1 modulo n1, then the set of source words will form a proper Huffman tree.
Adaptive Huffman coding
A variation called adaptive Huffman coding involves calculating the probabilities dynamically based on recent actual frequencies in the sequence of source symbols, and changing the coding tree structure to match the updated probability estimates.
Huffman template algorithm
Most often, the weights used in implementations of Huffman coding represent numeric probabilities, but the algorithm given above does not require this; it requires only that the weights form a totally ordered commutative monoid, meaning a way to order weights and to add them. The Huffman template algorithm enables one to use any kind of weights (costs, frequencies, pairs of weights, nonnumerical weights) and one of many combining methods (not just addition). Such algorithms can solve other minimization problems, such as minimizing , a problem first applied to circuit design [2].
Lengthlimited Huffman coding
Lengthlimited Huffman coding is a variant where the goal is still to achieve a minimum weighted path length, but there is an additional restriction that the length of each codeword must be less than a given constant. The packagemerge algorithm solves this problem with a simple greedy approach very similar to that used by Huffman's algorithm. Its time complexity is O(nL), where L is the maximum length of a codeword. No algorithm is known to solve this problem in linear or linearithmic time, unlike the presorted and unsorted conventional Huffman problems, respectively.
Huffman coding with unequal letter costs
In the standard Huffman coding problem, it is assumed that each symbol in the set that the code words are constructed from has an equal cost to transmit: a code word whose length is N digits will always have a cost of N, no matter how many of those digits are 0s, how many are 1s, etc. When working under this assumption, minimizing the total cost of the message and minimizing the total number of digits are the same thing.
Huffman coding with unequal letter costs is the generalization in which this assumption is no longer assumed true: the letters of the encoding alphabet may have nonuniform lengths, due to characteristics of the transmission medium. An example is the encoding alphabet of Morse code, where a 'dash' takes longer to send than a 'dot', and therefore the cost of a dash in transmission time is higher. The goal is still to minimize the weighted average codeword length, but it is no longer sufficient just to minimize the number of symbols used by the message. No algorithm is known to solve this in the same manner or with the same efficiency as conventional Huffman coding.
Optimal alphabetic binary trees (HuTucker coding)
In the standard Huffman coding problem, it is assumed that any codeword can correspond to any input symbol. In the alphabetic version, the alphabetic order of inputs and outputs must be identical. Thus, for example, could not be assigned code , but instead should be assigned either or . This is also known as the HuTucker problem, after the authors of the paper presenting the first linearithmic solution to this optimal binary alphabetic problem, which has some similarities to Huffman algorithm, but is not a variation of this algorithm. These optimal alphabetic binary trees are often used as binary search trees.
The canonical Huffman code
If weights corresponding to the alphabetically ordered inputs are in numerical order, the Huffman code has the same lengths as the optimal alphabetic code, which can be found from calculating these lengths, rendering HuTucker coding unnecessary. The code resulting from numerically (re)ordered input is sometimes called the canonical Huffman code and is often the code used in practice, due to ease of encoding/decoding. The technique for finding this code is sometimes called HuffmanShannonFano coding, since it is optimal like Huffman coding, but alphabetic in weight probability, like ShannonFano coding. The HuffmanShannonFano code corresponding to the example is {000,001,01,10,11}, which, having the same codeword lengths as the original solution, is also optimal.
Applications
Arithmetic coding can be viewed as a generalization of Huffman coding, in the sense that they produce the same output when every symbol has a probability of the form 1/2^{k}; in particular it tends to offer significantly better compression for small alphabet sizes. Huffman coding nevertheless remains in wide use because of its simplicity and high speed. Intuitively, arithmetic coding can offer better compression than Huffman coding because its "code words" can have effectively noninteger bit lengths, whereas code words in Huffman coding can only have an integer number of bits. Therefore, there is an inefficiency in Huffman coding where a code word of length k only optimally matches a symbol of probability 1/2^{k} and other probabilities are not represented as optimally; whereas the code word length in arithmetic coding can be made to exactly match the true probability of the symbol.
Huffman coding today is often used as a "backend" to some other compression methods. DEFLATE (PKZIP's algorithm) and multimedia codecs such as JPEG and MP3 have a frontend model and quantization followed by Huffman coding (or variablelength prefixfree codes with a similar structure, although perhaps not necessarily designed by using Huffman's algorithm).
See also
 Adaptive Huffman coding
 Canonical Huffman code
 Huffyuv
 Modified Huffman coding  used in fax machines
 ShannonFano coding
 Data compression
 Lempel–Ziv–Welch
 Varicode
Notes
 ^ see Ken Huffman (1991)
References
 D.A. Huffman, "A Method for the Construction of MinimumRedundancy Codes", Proceedings of the I.R.E., September 1952, pp 1098–1102. Huffman's original article.
 Ken Huffman. Profile: David A. Huffman, Scientific American, September 1991, pp. 54–58
 Thomas H. Cormen, Charles E. Leiserson, Ronald L. Rivest, and Clifford Stein. Introduction to Algorithms, Second Edition. MIT Press and McGrawHill, 2001. ISBN 0262032937. Section 16.3, pp. 385–392.
External links
 Huffman Encoding & Decoding Animation
 Program for explaining the Huffman Coding procedure.
 nary Huffman Template Algorithm
 Huffman Tree visual graph generator
 Sloane A098950 Minimizing kordered sequences of maximum height Huffman tree
 Mordecai J. Golin, Claire Kenyon, Neal E. Young "Huffman coding with unequal letter costs" (PDF), STOC 2002: 785791
 Huffman Coding: A CS2 Assignment a good introduction to Huffman coding
 A quick tutorial on generating a Huffman tree
 Pointers to Huffman coding visualizations
 Huffman in C
 Description of an implementation in Python
 Explanation of Huffman coding with examples in several languages
 Interactive Huffman Tree Construction
 A C program doing basic Huffman coding on binary and text files
 Efficient implementation of Huffman codes for blocks of binary sequences
Data compression methods Information theory Lossless Shannon–Fano · Shannon–Fano–Elias · Huffman · Adaptive Huffman · Arithmetic · Range · Golomb · Universal (Gamma · ExpGolomb · Fibonacci · Levenshtein)RLE · Byte pair encoding · DEFLATE · Lempel–Ziv (LZ77/78 · LZSS · LZW · LZWL · LZO · LZMA · LZX · LZRW · LZJB · LZS · LZT · ROLZ) · Statistical Lempel ZivOthersAudio Audio codec partsOthersImage TermsMethodsOthersVideo TermsVideo characteristics · Frame · Frame rate · Interlace · Frame types · Video quality · Video resolutionOthersSee Compression formats for formats and Compression software implementations for codecs Categories: 1952 in computer science
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