The Wagner–Fischer algorithm has a history of multiple invention. Navarro lists the following inventors of it, with date of publication, and acknowledges that the list is incomplete:
The Wagner–Fischer algorithm computes edit distance based on the observation that if we reserve a matrix to hold the edit distances between all prefixes of the first string and all prefixes of the second, then we can compute the values in the matrix by flood filling the matrix, and thus find the distance between the two full strings as the last value computed. A straightforward implementation, as pseudocode for a function LevenshteinDistance that takes two strings, s of length m, and t of length n, and returns the Levenshtein distance between them, looks as follows. Note that the input strings are one-indexed, while the matrix d is zero-indexed, and is a closed range. function LevenshteinDistance: // for all i and j, d will hold the Levenshtein distance between // the first i characters of s and the first j characters of t // note that d has * values declare int d set each element in d to zero // source prefixes can be transformed into empty string by // dropping all characters for i from 1 to m: d := i // target prefixes can be reached from empty source prefix // by inserting every character for j from 1 to n: d := j for j from 1 to n: for i from 1 to m: if s = t: substitutionCost := 0 else: substitutionCost := 1 d := minimum // substitution return d
As mentioned earlier, the invariant is that we can transform the initial segment s into t using a minimum of d operations. This invariant holds since:
It is initially true on row and column 0 because s can be transformed into the empty stringt by simply dropping all i characters. Similarly, we can transform s to t by simply adding all j characters.
If s = t, and we can transform s to t in k operations, then we can do the same to s and just leave the last character alone, giving k operations.
Otherwise, the distance is the minimum of the three possible ways to do the transformation:
* If we can transform s to t in k operations, then we can simply add t afterwards to get t in k+1 operations.
* If we can transform s to t in k operations, then we can remove s and then do the same transformation, for a total of k+1 operations.
* If we can transform s to t in k operations, then we can do the same to s, and exchange the original s for t afterwards, for a total of k+1 operations.
The operations required to transform s into t is of course the number required to transform all of s into all of t, and so d holds our result.
This proof fails to validate that the number placed in d is in fact minimal; this is more difficult to show, and involves an argument by contradiction in which we assume d is smaller than the minimum of the three, and use this to show one of the three is not minimal.
We can adapt the algorithm to use less space, O instead of O, since it only requires that the previous row and current row be stored at any one time.
We can store the number of insertions, deletions, and substitutions separately, or even the positions at which they occur, which is always j.
We can normalize the distance to the interval .
If we are only interested in the distance if it is smaller than a threshold k, then it suffices to compute a diagonal stripe of width 2k+1 in the matrix. In this way, the algorithm can be run inO time, where l is the length of the shortest string.
We can give different penalty costs to insertion, deletion and substitution. We can also give penalty costs that depend on which characters are inserted, deleted or substituted.
This algorithm parallelizes poorly, due to a large number of data dependencies. However, all the cost values can be computed in parallel, and the algorithm can be adapted to perform the minimum function in phases to eliminate dependencies.
By examining diagonals instead of rows, and by using lazy evaluation, we can find the Levenshtein distance in O time, which is much faster than the regular dynamic programming algorithm if the distance is small.
By initializing the first row of the matrix with zeros, we obtain a variant of the Wagner–Fischer algorithm that can be used for fuzzy string search of a string in a text. This modification gives the end-position of matching substrings of the text. To determine the start-position of the matching substrings, the number of insertions and deletions can be stored separately and used to compute the start-position from the end-position. The resulting algorithm is by no means efficient, but was at the time of its publication one of the first algorithms that performed approximate search.
