Branching by Edmonds: Difference between revisions
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Let <math>C'</math> be a cycle of <math>G'</math> (<math>C'=C</math> not excluded). First we show that <math>B_{\mathrm{opt}}</math> contains all arcs of <math>C'</math> except one. So, suppose for a contradiction that <math>B_{\mathrm{opt}}</math> does not contain some of the arcs of <math>C'</math>, say, <math>(v_1,w_1),\ldots,(v_k,w_k)</math> with <math>k>1</math>. | Let <math>C'</math> be a cycle of <math>G'</math> (<math>C'=C</math> not excluded). First we show that <math>B_{\mathrm{opt}}</math> contains all arcs of <math>C'</math> except one. So, suppose for a contradiction that <math>B_{\mathrm{opt}}</math> does not contain some of the arcs of <math>C'</math>, say, <math>(v_1,w_1),\ldots,(v_k,w_k)</math> with <math>k>1</math>. | ||
Replacing the incoming arc of any <math>w_i</math> by <math>(v_i,w_i)</math> in <math>B_{\mathrm{opt}}</math> and doing nothing else, would not decrease the total weight. Since <math>B_{\mathrm{opt}}</math> is as close as possible to <math>B''</math>, | Replacing the incoming arc of any <math>w_i</math> by <math>(v_i,w_i)</math> in <math>B_{\mathrm{opt}}</math> and doing nothing else, would not decrease the total weight. Since <math>B_{\mathrm{opt}}</math> is as close as possible to <math>B''</math>, such a replacement cannot result in a branching anymore. Since the indegrees do not change by that replacement, this means that adding <math>(v_i,w_i)</math> to <math>B_{\mathrm{opt}}</math> would close a cycle. In other words, there is a path <math>p_i</math> in <math>B_{\mathrm{opt}}</math> from <math>w_i</math> to <math>v_i</math>. Each path <math>p_i</math> must enter <math>C</math> at one of the nodes <math>w_j</math> because, otherwise, the node where <math>p_i</math> enters <math>C'</math> had two incoming arcs in <math>B_{\mathrm{opt}}</math>: the incoming arc on <math>C'</math> and the arc over which <math>p_i</math> enters <math>C'</math>. However, this would imply that there is a cycle in the union of all paths <math>p_i</math> plus all arcs of <math>C''</math> '''not''' in <math>\{(v_1,w_1),\ldots,(v_k,w_k)\}</math>. This union is a subset of <math>B_{\mathrm{opt}}</math>, which yields the desired contradiction. | ||
Now we know that <math>B_{\mathrm{opt}}</math> contains all arcs except one on all cycles of <math>G'</math>. Note that, for any node not on a cycle, the incomng branchng arc may be freely chosen without any effect on the rest. So, since <math>B_{\mathrm{opt}}</math> is as close as possible to <math>B''</math>,<math>B_{\mathrm{opt}}</math> and <math>B''</math> agree on all of these choices. Further note that all cycles of <math>G'</math> are node-disjoint. In summary, we may compare <math>B_{\mathrm{opt}}</math> and <math>B'</math> on each cycle of <math>G'</math> separately. | Now we know that <math>B_{\mathrm{opt}}</math> contains all arcs except one on all cycles of <math>G'</math>. Note that, for any node not on a cycle, the incomng branchng arc may be freely chosen without any effect on the rest. So, since <math>B_{\mathrm{opt}}</math> is as close as possible to <math>B''</math>,<math>B_{\mathrm{opt}}</math> and <math>B''</math> agree on all of these choices. Further note that all cycles of <math>G'</math> are node-disjoint. In summary, we may compare <math>B_{\mathrm{opt}}</math> and <math>B'</math> on each cycle of <math>G'</math> separately. | ||
Revision as of 16:29, 17 October 2014
Abstract view
Algorithmic problem: Maximum branching
Definition:
- An arc [math]\displaystyle{ (v,w)\in A }[/math] is critical if its weight is not smaller than the weight of any other incoming arc of [math]\displaystyle{ w }[/math].
- A critical subgraph [math]\displaystyle{ G'=(V,A') }[/math] of [math]\displaystyle{ G }[/math] contains exactly one incoming arc for each node with positive indegree, and this arc is critical.
Type of algorithm: recursion
Invariant: The output of a recursive call is a maximum branching of the weighted graph that was the argument of this recursive call.
Basic operation at the beginning of each recursive step: compute a critical subgraph [math]\displaystyle{ G'=(V,A') }[/math] for the input graph [math]\displaystyle{ G }[/math].
Induction basis
Abstract view: Terminate if [math]\displaystyle{ G' }[/math] is cycle-free.
Proof: If [math]\displaystyle{ G' }[/math] is cycle-free, it is a branching. Consider some other branching [math]\displaystyle{ B }[/math]. We have to show that [math]\displaystyle{ B }[/math] does not have more total weight than [math]\displaystyle{ G' }[/math].
By definition, a critical graph contains one incoming arc for each node that does have incoming arcs. Therefore, for each arc [math]\displaystyle{ a }[/math] of [math]\displaystyle{ B }[/math], there is an arc [math]\displaystyle{ a' }[/math] in [math]\displaystyle{ G' }[/math] pointing to the same node. Due to the choice of arcs for [math]\displaystyle{ G' }[/math], it is [math]\displaystyle{ w(a)\leq w(a') }[/math].
Induction step
Abstract view:
- Identify some cycle [math]\displaystyle{ C }[/math] in [math]\displaystyle{ G' }[/math].
- Let [math]\displaystyle{ W }[/math] denote the minimum weight of all arcs on [math]\displaystyle{ C }[/math].
- For every arc [math]\displaystyle{ (v,w)\in A }[/math] pointing from some node [math]\displaystyle{ v }[/math] outside [math]\displaystyle{ C }[/math] to some node [math]\displaystyle{ w }[/math] on [math]\displaystyle{ C }[/math]:
- Decrease the weight of [math]\displaystyle{ (v,w) }[/math] by [math]\displaystyle{ w(v',w)-W\geq 0 }[/math], where [math]\displaystyle{ (v',w) }[/math] is the incoming arc of [math]\displaystyle{ w }[/math] on [math]\displaystyle{ C }[/math].
- If the new weight of [math]\displaystyle{ (v,w) }[/math] is not positive, remove [math]\displaystyle{ (v,w) }[/math] from [math]\displaystyle{ G }[/math].
- Shrink [math]\displaystyle{ C }[/math] into one new super-node, where every arc pointing to (resp., from) some node on [math]\displaystyle{ C }[/math] now points to (from) that super-node.
- Call the algorithm recursively for the modified weighted graph after shrinking, giving branching [math]\displaystyle{ B }[/math].
- Unshrink the graph.
- Add all arcs of [math]\displaystyle{ C }[/math] to [math]\displaystyle{ B }[/math] giving [math]\displaystyle{ B' }[/math].
- If [math]\displaystyle{ B }[/math] contains an arc [math]\displaystyle{ (v,w) }[/math] such that [math]\displaystyle{ v }[/math] is outside [math]\displaystyle{ C }[/math] and [math]\displaystyle{ w }[/math] is on [math]\displaystyle{ C }[/math]: remove the incoming arc of [math]\displaystyle{ w }[/math] on [math]\displaystyle{ C }[/math] from [math]\displaystyle{ B }[/math]; otherwise, remove one arc with weight [math]\displaystyle{ W }[/math] on [math]\displaystyle{ C }[/math]. Let [math]\displaystyle{ B'' }[/math] be the result in both cases.
- Return [math]\displaystyle{ B'' }[/math].
Proof: Obviously, [math]\displaystyle{ B'' }[/math] is a branching, so we have to prove that it has maximum weight. Let [math]\displaystyle{ B_{\mathrm{opt}} }[/math] be a maximum branching in [math]\displaystyle{ G }[/math] such that, among all maximum branchings in [math]\displaystyle{ G }[/math], [math]\displaystyle{ B_{\mathrm{opt}} }[/math] shares as many arcs as possible with [math]\displaystyle{ B'' }[/math].
Let [math]\displaystyle{ C' }[/math] be a cycle of [math]\displaystyle{ G' }[/math] ([math]\displaystyle{ C'=C }[/math] not excluded). First we show that [math]\displaystyle{ B_{\mathrm{opt}} }[/math] contains all arcs of [math]\displaystyle{ C' }[/math] except one. So, suppose for a contradiction that [math]\displaystyle{ B_{\mathrm{opt}} }[/math] does not contain some of the arcs of [math]\displaystyle{ C' }[/math], say, [math]\displaystyle{ (v_1,w_1),\ldots,(v_k,w_k) }[/math] with [math]\displaystyle{ k\gt 1 }[/math].
Replacing the incoming arc of any [math]\displaystyle{ w_i }[/math] by [math]\displaystyle{ (v_i,w_i) }[/math] in [math]\displaystyle{ B_{\mathrm{opt}} }[/math] and doing nothing else, would not decrease the total weight. Since [math]\displaystyle{ B_{\mathrm{opt}} }[/math] is as close as possible to [math]\displaystyle{ B'' }[/math], such a replacement cannot result in a branching anymore. Since the indegrees do not change by that replacement, this means that adding [math]\displaystyle{ (v_i,w_i) }[/math] to [math]\displaystyle{ B_{\mathrm{opt}} }[/math] would close a cycle. In other words, there is a path [math]\displaystyle{ p_i }[/math] in [math]\displaystyle{ B_{\mathrm{opt}} }[/math] from [math]\displaystyle{ w_i }[/math] to [math]\displaystyle{ v_i }[/math]. Each path [math]\displaystyle{ p_i }[/math] must enter [math]\displaystyle{ C }[/math] at one of the nodes [math]\displaystyle{ w_j }[/math] because, otherwise, the node where [math]\displaystyle{ p_i }[/math] enters [math]\displaystyle{ C' }[/math] had two incoming arcs in [math]\displaystyle{ B_{\mathrm{opt}} }[/math]: the incoming arc on [math]\displaystyle{ C' }[/math] and the arc over which [math]\displaystyle{ p_i }[/math] enters [math]\displaystyle{ C' }[/math]. However, this would imply that there is a cycle in the union of all paths [math]\displaystyle{ p_i }[/math] plus all arcs of [math]\displaystyle{ C'' }[/math] not in [math]\displaystyle{ \{(v_1,w_1),\ldots,(v_k,w_k)\} }[/math]. This union is a subset of [math]\displaystyle{ B_{\mathrm{opt}} }[/math], which yields the desired contradiction.
Now we know that [math]\displaystyle{ B_{\mathrm{opt}} }[/math] contains all arcs except one on all cycles of [math]\displaystyle{ G' }[/math]. Note that, for any node not on a cycle, the incomng branchng arc may be freely chosen without any effect on the rest. So, since [math]\displaystyle{ B_{\mathrm{opt}} }[/math] is as close as possible to [math]\displaystyle{ B'' }[/math],[math]\displaystyle{ B_{\mathrm{opt}} }[/math] and [math]\displaystyle{ B'' }[/math] agree on all of these choices. Further note that all cycles of [math]\displaystyle{ G' }[/math] are node-disjoint. In summary, we may compare [math]\displaystyle{ B_{\mathrm{opt}} }[/math] and [math]\displaystyle{ B' }[/math] on each cycle of [math]\displaystyle{ G' }[/math] separately.
For [math]\displaystyle{ C }[/math], complete agreement between [math]\displaystyle{ B_{\mathrm{opt}} }[/math] and [math]\displaystyle{ B'' }[/math] follows from the observation that the choice of incoming arcs for all nodes on [math]\displaystyle{ C }[/math] is optimal in [math]\displaystyle{ B'' }[/math] due to the specific modification of the arc weights. And for all other cycles of [math]\displaystyle{ G' }[/math], complete agreement follows from the induction hypothesis. In both cases, we again used the specific choice of [math]\displaystyle{ B_{\mathrm{opt}} }[/math] to be as close to [math]\displaystyle{ B'' }[/math] as possible.
Complexity
Statement: The asymptotic complexity is in [math]\displaystyle{ \mathcal{O}((n+m)\cdot n) }[/math] in the worst case, where [math]\displaystyle{ n=|V| }[/math] and [math]\displaystyle{ m=|A| }[/math].
Proof: Using DFS for cycle detection, each recursive step requires [math]\displaystyle{ \mathcal{O}(n+m) }[/math]. In each shrink operation, the number of nodes decreases, so the recursion depth is [math]\displaystyle{ \mathcal{O}(n) }[/math].
Remarks
- The unshrink operation requires that the shrink operation performs some bookkeeping: For the super-node, a cyclically ordered sequence of all nodes and arcs on [math]\displaystyle{ Z }[/math] must probably be maintained.
- Several cycles may be discovered simultaneously by one run of DFS. Note that all cycles in a critical graph are node-disjoint, because no node has more than one incoming arc. Therefore, several cycles may be handled simulaneously, in one recursive call, without any interference.