Hopcroft-Karp

Abstract view

Algorithmic problem: Cardinality-maximal matching in bipartite graphs.

Type of algorithm: loop.

Auxiliary data structures: a set [math]\displaystyle{ S }[/math] of BFS runs as iterators (cf. the corresponding remark). The modification to find augmenting paths is applied.

Invariant: Before and after each iteration:

1. [math]\displaystyle{ M }[/math] is a matching in [math]\displaystyle{ G }[/math].
2. All exposed nodes that are end nodes of augmenting paths, are in [math]\displaystyle{ S }[/math].

Variant: The shortest length of an augmenting path in terms of the number of edges is increased.

Break condition: [math]\displaystyle{ S=\emptyset }[/math].

Induction basis

Abstract view:

1. Start with an arbitrary matching, for example, the empty matching.
2. Create and initialize one BFS run for each exposed node.

Induction step

Abstract view: In the [math]\displaystyle{ i }[/math]-th iteration:

1. Process all nodes of distance [math]\displaystyle{ i-1 }[/math] in the queues of all BFS runs.
2. For each BFS run: If it had no nodes to process in step 1, remove it from [math]\displaystyle{ S }[/math].
3. While there are two BFS runs in [math]\displaystyle{ S }[/math] that have seen the same edge:
   1. Choose two such BFS runs and such an edge [math]\displaystyle{ \{v,w\} }[/math], say.
   2. Augment [math]\displaystyle{ M }[/math] along the concatenation of the paths in the arborescences of these two BFS runs from the start nodes to [math]\displaystyle{ v }[/math] and [math]\displaystyle{ w }[/math], respectively, and of [math]\displaystyle{ \{v,w\} }[/math].
   3. Remove these two BFS runs from the set of all BFS runs.

Proof: The variant is obviously maintained. To prove the variant, consider an execution of step 3.2. Let [math]\displaystyle{ p }[/math] denote the path along which the augmentation takes place. Let [math]\displaystyle{ p' }[/math] and [math]\displaystyle{ p'' }[/math] the paths in he arborescences from the start nodes to [math]\displaystyle{ v }[/math] and [math]\displaystyle{ w }[/math], respectively.

For a contradiction, suppose augmenting along [math]\displaystyle{ p }[/math] has created a a new augmenting path [math]\displaystyle{ q }[/math] that is not longer than [math]\displaystyle{ p }[/math]. In either orientation of [math]\displaystyle{ p }[/math] and [math]\displaystyle{ q }[/math], let [math]\displaystyle{ v' }[/math] be the first node of [math]\displaystyle{ p }[/math] that also belongs to [math]\displaystyle{ q }[/math], and let [math]\displaystyle{ w' }[/math] be the last node of [math]\displaystyle{ p }[/math] that also belongs to [math]\displaystyle{ q }[/math]. Without loss of generality, let [math]\displaystyle{ v }[/math] be the last node of [math]\displaystyle{ p' }[/math] and let [math]\displaystyle{ v }[/math] be on [math]\displaystyle{ p' }[/math]. Note that each edge of [math]\displaystyle{ q }[/math] that is incident to exactly one node on [math]\displaystyle{ p }[/math] must be unmatched.

First, [math]\displaystyle{ v'=v }[/math] must hold because, otherwise, one subpath of [math]\displaystyle{ p }[/math] up to [math]\displaystyle{ v' }[/math] and one of [math]\displaystyle{ q }[/math] up to [math]\displaystyle{ v' }[/math] would be a shorter augmenting path, which contradicts the induction hypothesis. Moreover, [math]\displaystyle{ v'=v }[/math] implies that [math]\displaystyle{ w }[/math] must belong to [math]\displaystyle{ p'' }[/math] and, by the same argument, [math]\displaystyle{ w'=w }[/math] must hold. So, the intersection of [math]\displaystyle{ p }[/math] and [math]\displaystyle{ q }[/math] is exactly [math]\displaystyle{ \{v,w\} }[/math]. Therefore, after the augmentation along [math]\displaystyle{ p }[/math], [math]\displaystyle{ q }[/math] becomes a candidate. Augmenting along [math]\displaystyle{ q }[/math] does not generate new augmenting paths because these new paths would intersect with [math]\displaystyle{ q }[/math] exactly on [math]\displaystyle{ \{v,w\} }[/math] for the same reason, but [math]\displaystyle{ \{v,w\} }[/math] is not matched anymore, and the two incident edges on this assumed new path are not matched, either, so this assumed new path is not alternating.

Remark: The union of all arborescences at termination is called a Hungarian forest in the literature. The algorithm and its correctness prove, constructively, that a matching in a bipartite graph is cardinality-maximal if, and only if, a Hungarian forest exists.

Correctness

Due to the invariant, the matching is cardinality-maximal if the main loop terminates. termination of the main loop results from the following complexity considerations.