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Bart Jansen Polynomial Kernels for Hard Problems on Disk Graphs

Bart Jansen Polynomial Kernels for Hard Problems on Disk Graphs. Accepted for presentation at SWAT 2010. Overview. Introduction Kernelization Graph classes Kernels Triangle Packing, K t -matching, H-matching Red/Blue Dominating Set Connected Vertex Cover Conclusion.

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Bart Jansen Polynomial Kernels for Hard Problems on Disk Graphs

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  1. Bart JansenPolynomial Kernels for Hard Problems on Disk Graphs Accepted for presentation at SWAT 2010

  2. Overview • Introduction • Kernelization • Graph classes • Kernels • Triangle Packing, Kt-matching, H-matching • Red/Blue Dominating Set • Connected Vertex Cover • Conclusion

  3. Kernelization for graph problems • Consider a computational decision problem on graphs • Input: encoding x of a question about graph G and integer k. • Question: does graph G have a (…)? • Parameter:k • Parameter expresses some property of the question (size of what we are looking for, treewidth of graph, etc.) • A kernelization algorithm takes (x, k) as input and computes instance (x’, k’) of same problem in polynomial time, such that • Answer to x is YES  answer to x’ is YES • k’ ≤ g(k) for some function g • |x’| ≤ f(k) for some function f • The function f is the size of the kernel • We want f to be a (small) polynomial

  4. Recent kernelization results Bad news Good news If we require G to be planar, lots of problems have linear or quadratic kernels Even if we relax planarity to bounded genus, H-minor-free, … • Many parameterized problems are W[1]-hard and have no kernels • Several easier parameterized problems only have kernels where f is exponential

  5. Expanding the range of good news • The frameworks giving general good news about small kernels only apply under restrictions that make the graph G sparse: |E| ≤ c |V| • Dense graphs without special structure make the problem hard, implying non-existence of kernels • We consider graphs that exhibit structure, but are not sparse: (unit)disk graphs • Yields good news: • Red-Blue Dominating Set, H-Matching, Connected Vertex Cover • Do not have polynomial kernels in general graphs • Have polynomial kernels in (unit)disk graphs • And the problems are still hard on disk graphs

  6. Graph classes Linear edge count Meta-theorems Quadratic edge count planar unit-disk bounded-genus bounded-genus H-minor-free disk Our kernels Ki,j-subgraph-free Subquadratic edge count Kernels for Dominating Set general

  7. Disk graphs • Consider a set S of closed disks in the plane • The intersection graph of S: • has a vertex v for every disk D(v), • has an edge between u and v iff. the disks D(v) and D(u) intersect. • (touching disks also intersect)

  8. Properties of disk graphs • If all disks have the same radius, their intersection graph is a unit disk graph • All planar graphs are disk graphs (varying radii) • Any clique is a (unit)disk graph • Compare with K5 which is not planar • So there are disk graphs with • Class of (unit)disk graphs • Closed under vertex deletion • Not closed under edge deletion • Not closed under edge contraction

  9. Structure theory and kernels Triangle packing and h-matching

  10. Triangle Packing • Input: Graph G, integer k • Question: Are there k vertex-disjoint triangles in G? • Parameter: k • NP-complete, even on planar graphs • In FPT on general graphs with a O(k2)-vertex kernel

  11. Triangle Packing • Input: Graph G, integer k • Question: Are there k vertex-disjoint triangles in G? • Parameter: k • Single reduction rule • Try all O(n3) sets of size 3, and test if they form a triangle • Mark vertices that occur in a triangle • Delete all vertices that were not marked

  12. Kernelization algorithm • Greedily build a maximal triangle packing • Suppose the greedy packing contains k* copies

  13. Neighborhood Clique Lemma • Let v be a vertex in a unit-disk graph G. Then there is a clique of size ⌈deg(v) / 6⌉ among the neighbors of G. • G[N(v)] has a clique of size ⌈deg(v) / 6⌉ • Proof. • Consider centers of v and its neighbors in a disk realization • Divide the plane into 6 equal sectors around v • Some sector contains ⌈deg(v) / 6⌉ sectors (Pigeonhole Principle) v

  14. Neighbors in each sector form a clique • Assume every disk has radius ½ • If v has a neighbor x then distance |xv| ≤ 1 y v x v

  15. Neighbors in each sector form a clique • Assume every disk has radius ½ • If v has a neighbor x then distance |xv| ≤ 1 • Consider two neighbors x,y in the same sector • By adjacency to v: |xv| ≤ 1, |yv| ≤ 1 • Sector definition: angle xvy ≤ 60o • By law of Cosines: |xy| ≤ 1 • So x,y adjacent • Neighbors within sector form a clique y x v

  16. Analysis of kernel size • If there is a maximal triangle packing with k* copies in G, then |V| is O(k*) • Proof. • We divide V in two subsets: • set S with vertices that are used in a selected copy • set W with the remainder • Since all triangles are vertex-disjoint, there are exactly 3k* vertices in S (every triangle uses 3 vertices) • We bound the size of W • Every vertex in W must be adjacent to vertex in S • Every vertex in S has at most 12 neighbors in W • So |W| ≤ 12 |S| ≤ 12(3 k*) ∈ O(k*)

  17. Extension to Kt-matching • We get a kernel with O(k) vertices for Triangle Packing in unit-disk graphs • Current best kernel for general graphs has O(k2) vertices • Generalizes to Kt-matching for every fixed t • Pack vertex-disjoint complete subgraphs of size t • Important properties still hold: • Every vertex that is not selected in a maximal packing must be adjacent to a selected vertex • Every selected vertex has O(t) neighbors in W

  18. Extension to H-Matching • H-matching problem • Pack vertex-disjoint copies of a fixed connected graph H • Kernel with O(k|H|-1) vertices by H. Moser [SOFSEM ‘09] • No kernel polynomial in |H| + k • H-matching on unit-disk graphs • H can be arbitrary • Graph G in which we find the copies is a unit-disk graph • Our result • O(k)-vertex kernel for every fixed graph H • Constant is exponential in the diameter of H • Properties of maximal H-matching in reduced graph • Every unused vertex has distance ≤ diameter(H) to a used vertex • Every vertex has O(|H|) unused neighbors

  19. Structure theory and kernels Red/blue dominating set

  20. Red/Blue Dominating Set • Input: Graph G with red vertices R, blue vertices B, integer k • Question: Is there a set of ≤ k red vertices that dominate all blue vertices? • Parameter: min(|R|,|B|)

  21. Background • min(|R|,|B|) as parameter since parameter k is W[1] hard, even on unit-disk graphs • In FPT on general graphs, no polynomial kernel • Usually assume G is bipartite with R and B as color classes • We do not assume this here; bipartite disk graphs are planar • Our results: • O(min(|R|,|B|))-vertex kernel on planar graphs • O(min(|R|,|B|)2)-vertex kernel on unit-disk graphs • O(min(|R|,|B|)4)-vertex kernel on disk graphs

  22. Reduction Rules • Red vertices r1, r2 such that N(r1) ∩ B ⊆ N(r2) ∩ B • Delete r1 • Blue vertices b1, b2 such that N(b1) ∩ R ⊆ N(b2) ∩ R • Delete b2

  23. Balance • After exhaustive application of reduction rules, the color classes must be balanced • Number of vertices in the classes must be polynomially related • Easy for planar graphs: |R| ≤ 5|B| (and vice versa) • Contribution: • |R| ∈ O(|B|2) (and vice versa) for unit-disk graphs • |R| ∈ O(|B|4) (and vice versa) for disk graphs • These structural results immediately yield kernels

  24. Balance in colored unit-disk graphs • Usual model: two vertices adjacent iff their disks intersect • Double the radius of disks • Now: two vertices adjacent iff the disk of one contains the center of the other, and vice versa • We prove: if no two red vertices see the same blue vertices, then |R| ∈ O(|B|2). ∙ ∙ ∙ ∙ radius 1 radius ½

  25. Proof • We prove: if no two red vertices see the same blue vertices, then |R| ∈ O(|B|2) • Look at arrangement of the plane induced by blue circles • Each region contains at most one red center • Complexity of the arrangement is O(|B|2) ∙ ∙ ∙ ∙ ∙ ∙ ∙ ∙ ∙ ∙ ∙ ∙

  26. Balance in colored disk graphs • Reconsider usual model: vertices adjacent iff disks intersect • We prove: if no red disk sees a subset of the blue vertices seen by another red disk, then |R| ∈ O(|B|4) [A,B] [A,B,C] [B,A] [B,A,C] A B C

  27. Balance in colored disk graphs • A face in the arrangement of bisector curves determines a unique order of encountering blue disks • The blue neighbors of a red disk are a prefix of the string determined by the face containing its center • So any face contains at most one red disk [A,B,C] [B,A,C] A B [B,C,A] [A,C,B] C [C,A,B] [C,B,A]

  28. Balance in colored disk graphs • Given n curves for which each pair intersects O(1) times, the complexity of the arrangement is O(n2) • We have O(|B|2) curves, hence complexity is O(|B|4) • Total number of red disks is O(|B|4) [A,B,C] [B,A,C] [B,C,A] [A,C,B] [C,A,B] [C,B,A]

  29. Summary of kernels for Red/Blue Dominating Set • By applying the reduction rules we find in polynomial time an equivalent instance such that no red vertex sees a subset of what another red vertex sees • Same for the blue vertices • Structural theorems show that in such colored graphs the sizes of the color classes are polynomially related • So size of the largest class is polynomial in the size of smallest class • Hence |V| = |R| + |B| ≤ min(|R|+|B|) + max(|R|,|B|) is O(min(|R|+|B|)c)

  30. Structure theory and kernels Connected vertex cover

  31. Connected Vertex Cover • Input: Graph G, integer k • Question: Is there a vertex cover of ≤ k vertices that induces a connected subgraph? • Parameter: k • FPT on general graphs, no polynomial kernel • Trivial linear-vertex kernel on unit-disk graphs • Any vertex cover for a unit-disk graph must have size ≥ n/12 (Erik-Jan’s thesis)

  32. Annotated Connected Vertex Cover • Input: Graph G, set of marked vertices S, integer k • Question: Is there a vertex cover of ≤ k vertices that induces a connected subgraph, and which contains all marked vertices? • Parameter: k • Unmarked vertex v is dead if all its neighbors are marked, if not then v is live • Reduction rules • Unmarked vertex v with degree > k: mark v • Distinct dead vertices u,v such that N(u) ⊆ N(v): delete u

  33. Analysis • Call an edge covered if it’s incident on a marked vertices • Otherwise an edge is uncovered • > k2 uncovered edges: output NO • > k marked vertices: output NO • In remaining cases ≤ k2 uncovered edges • ≤ 2k2 live vertices since each live vertex is incident on an uncovered edge • ≤ k marked vertices • Remains to bound the dead vertices • # Dead vertices can be bounded in # marked vertices by the balance argument, gives #dead is O(k4) • More intricate argument gives O(k2) bound • Annotation can be undone

  34. Conclusion and discussion • Several parameterized problems without polynomial kernels on general graphs, do allow polynomial kernels on dense (unit)disk graphs • Colored Ki,j-subgraph-free graphs also have the “polynomial balance property” • Polynomial kernels for Red/Blue Dom. Set and Connected V.C. • Open problems • Poly kernel for H-matching in disk graphs? • Poly kernel for unit-disk Edge Clique Cover? • Poly kernel for unit-disk Partition (Vertex Set) Into Cliques? • Improve the quartic bound for balance in disk graphs • Find other problems where colored graph balance implies poly kernels

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