chapter graph algorithms -...

Chapter 5Graph Algorithms

Matching

Algorithm TheoryWS 2012/13

Fabian Kuhn

Algorithm Theory, WS 2012/13 Fabian Kuhn 2

Circulation: Demands and Lower BoundsGiven: Directed network , with• Edge capacities 0 and lower bounds ℓ for ∈• Node demands ∈ for all ∈

– 0: node needs flow and therefore is a sink– 0: node has a supply of and is therefore a source– 0: node is neither a source nor a sink

Flow: Function : → satisfying• Capacity Conditions: ∀ ∈ :ℓ

• Demand Conditions: ∀ ∈ :

Objective: Does a flow satisfying all conditions exist?If yes, find such a flow .


IntegralityTheorem: Consider a circulation problem with integral capacities, flow lower bounds, and node demands. If the problem is feasible, then it also has an integral solution.

Proof:• Graph ′ has only integral capacities and demands• Thus, the flow network used in the reduction to solve

circulation with demands and no lower bounds has only integral capacities

• The theorem now follows because a max flow problem with integral capacities also has an optimal integral solution

• It also follows that with the max flow algorithms we studied, we get an integral feasible circulation solution.


Matrix Rounding• Given: matrix , of real numbers• row sum: ∑ , , column sum: ∑ ,• Goal: Round each , , as well as and up or down to the

next integer so that the sum of rounded elements in each row (column) equals the rounded row (column) sum

• Original application: publishing census data

Example:

3.14 6.80 7.30 17.249.60 2.40 0.70 12.703.60 1.20 6.50 11.3016.34 10.40 14.50

3 7 7 1710 2 1 133 1 7 1116 10 15

original data possible rounding


Matrix RoundingTheorem: For any matrix, there exists a feasible rounding.

Remark: Just rounding to the nearest integer doesn’t work

0.35 0.35 0.35 1.050.55 0.55 0.55 1.650.90 0.90 0.90

0 0 0 01 1 1 31 1 1

0 0 1 11 1 0 21 1 1

original data

feasible roundingrounding to nearest integer


Reduction to Circulation

3.14 6.80 7.30 17.249.60 2.40 0.70 12.703.60 1.20 6.50 11.3016.34 10.40 14.50

rows:

columns:3,4

2,312,13 10,11

∞

Matrix elements and row/column sumsgive a feasible circulation that satisfiesall lower bound, capacity, and demandconstraints

all demands 0


Matrix RoundingTheorem: For any matrix, there exists a feasible rounding.

Proof:• The matrix entries , and the row and column sums and

give a feasible circulation for the constructed network

• Every feasible circulation gives matrix entries with corresponding row and column sums (follows from demand constraints)

• Because all demands, capacities, and flow lower bounds are integral, there is an integral solution to the circulation problem

gives a feasible rounding!


Matching


Gifts‐Children Graph• Which child likes which gift can be represented by a graph


MatchingMatching: Set of pairwise non‐incident edges

Maximal Matching: A matching s.t. no more edges can be added

Maximum Matching: A matching of maximum possible size

Perfect Matching:Matching of size ⁄ (every node is matched)


Bipartite GraphDefinition: A graph , is called bipartite iff its node set can be partitioned into two parts ∪ such that for each edge u, v ∈ ,

, ∩ 1.

• Thus, edges are only between the two parts

⋅


Santa’s ProblemMaximum Matching in Bipartite Graphs:

Every child can get a giftiff there is a matchingof size #children

Clearly, every matchingis at most as big

If #children #gifts,there is a solution iffthere is a perfect matching


Reducing to Maximum Flow• Like edge‐disjoint paths…

all capacities are


Reducing to Maximum FlowTheorem: Every integer solution to the max flow problem on the constructed graph induces a maximum bipartite matching of .

Proof:1. An integer flow of value | | induces a matching of size | |

– Left nodes (gifts) have incoming capacity 1– Right nodes (children) have outgoing capacity 1– Left and right nodes are incident to 1 edge of with 1

2. A matching of size implies a flow of value – For each edge , of the matching:

, , , 1

– All other flow values are 0


Running Time of Max. Bipartite MatchingTheorem: A maximum matching of a bipartite graph can be computed in time


Perfect Matching?• There can only be a perfect matching if both sides of the

partition have size ⁄ .

• There is no perfect matching, iff there is an ‐ cut ofsize ⁄ in the flow network.

2 2


‐ Cuts

Partition , of node set such that ∈ and ∈

• If ∈ : edge , is in cut ,

• If ∈ : edge , is in cut ,

• Otherwise (if ∈ , ∈ ), all edges from to some ∈ are in cut ,


Hall’s Marriage TheoremTheorem: A bipartite graph ∪ , for which | |has a perfect matching if and only if

∀ ⊆ : ,where ⊆ is the set of neighbors of nodes in ′.

Proof: No perfect matching ⟺ some ‐ cut has capacity 1. Assume there is ′ for which |U |:




Proof: No perfect matching ⟺ some ‐ cut has capacity 2. Assume that there is a cut , of capacity


What About General Graphs• Can we efficiently compute a maximum matching if is not

bipartitie?

• How good is a maximal matching?– A matching that cannot be extended…

• Vertex Cover: set ⊆ of nodes such that∀ , ∈ , , ∩ ∅.

• A vertex cover covers all edges by incident nodes


Vertex Cover vs MatchingConsider a matching and a vertex cover

Claim: | |

Proof: • At least one node of every edge , ∈ is in • Needs to be a different node for different edges from


Vertex Cover vs MatchingConsider a matching and a vertex cover

Claim: If is maximal and is minimum, 2

Proof: • is maximal: for every edge , ∈ , either or (or both)

are matched

• Every edge ∈ is “covered” by at least one matching edge• Thus, the set of the nodes of all matching edges gives a vertex

cover of size 2| |.


Maximal Matching ApproximationTheorem: For any maximal matching and any maximum matching ∗, it holds that

∗

2 .

Proof:

Theorem: The set of all matched nodes of a maximal matching is a vertex cover of size at most twice the size of a min. vertex cover.


Augmenting PathsConsider a matching of a graph , :• A node ∈ is called free iff it is not matched

Augmenting Path: A (odd‐length) path that starts and ends at a free node and visits edges in ∖ and edges in alternatingly.

• Matching can be improved using an augmenting path by switching the role of each edge along the path

free nodes

alternating path


Augmenting PathsTheorem: A matching of , is maximum if and only if there is no augmenting path.Proof:• Consider non‐max. matching and max. matching ∗ and define

≔ ∖ ∗, ∗ ≔ ∗ ∖

• Note that ∩ ∗ ∅ and | ∗|• Each node ∈ is incident to at most one edge in both and ∗

• ∪ ∗ induces even cycles and paths


Finding Augmenting Paths

free nodes

augmenting path

odd cycle


Blossoms• If we find an odd cycle…

free node

blossom

stem

′ ′

contracted blossom

contract blossom

Graph

Graph ′

root

Matching

′

Matching ∖ ,is a matching of .


Lemma: Graph has an augmenting path w.r.t. matching iff ′has an augmenting path w.r.t. matching ′

Also: The matching can be computed efficiently from ′.

Contracting Blossoms

′ ′

′ ′

′ ′

Note: If stem has length 0,root of blossom if freeand thus also the node is free in ′.


Edmond’s Blossom AlgorithmAlgorithm Sketch:1. Build a tree for each free node2. Starting from an explored node at even distance from a free

node in the tree of , explore some unexplored edge , :

1. If is an unexplored node, is matched to some neighbor :add to the tree ( is now explored)

2. If is explored and in the same tree:at odd distance from root ignore and move onat even distance from root blossom found

3. If is explored and in another treeat odd distance from root ignore and move onat even distance from root augmenting path found


Running TimeFinding a Blossom: Repeat on smaller graph

Finding an Augmenting Path: Improve matching

Theorem: The algorithm can be implemented in time .


Matching AlgorithmsWe have seen:• time alg. to compute a max. matching in bipartite graphs• time alg. to compute a max. matching in general graphs

Better algorithms:

• Best known running time (bipartite and general gr.):

Weighted matching:• Edges have weight, find a matching of maximum total weight• Bipartite graphs: flow reduction works in the same way• General graphs: can also be solved in polynomial time

(Edmond’s algorithms is used as blackbox)


Happy Holidays!

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