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Finding Cycles and Trees in Sublinear Time
Oded Goldreich Weizmann Institute of Science Joint work with Artur Czumaj, Dana Ron, C. Seshadhri, Asaf Shapira, and Christian Sohler General perspective – find small substructures in case the object is far from lacking them.
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Preliminaries (boring, but needed…)
Consider algorithms in the bounded-degree graph model (for a fixed degree bound, d): The algorithms use queries of the form (v,i) (where id) that are answered with the ith neighbor of v. Distances are measured as fractions of the maximum possible number of edges (i.e., dN/2). For simplicity, far = being (1)-far. (The results extend to the case that the algorithm is given a proximity parameter , but then the complexity depends on .) All algorithms that I will discuss operate by queries to an input graph, viewed as an oracle. cycle = simple cycle
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Our results at a glance – take 1 (naïve)
In the bounded-degree graph model cycle = simple cycle THM 1: An Õ(N1/2)-time algorithm for finding (small) cycles in N-vertex graphs that are far from being cycle-free. THM 2: For every fixed k>3, an Õ(N1/2)-time algorithm for finding (small) cycles of length at least k in N-vertex graphs that are far from lacking cycles of such length. Optimality: No o(N1/2)-query algorithm can find such cycles. THM 3: For every fixed k>1, an O(1)-time algorithm for finding trees with at least k leaves in graphs that are far from lacking such trees. All algorithms run in time that is polynomial in the reciprocal of the proximity parameter. small = polylog(N)-size
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Our results at a glance – take 2 (minors)
In the bounded-degree graph model cycle = simple cycle Ck = k-vertex cycle Def: A graph G has an H-minor if H can be obtained from G by vertex and edge removal and edge contraction. THM 1: An Õ(N1/2)-time algorithm for finding (small) C3-minors in N-vertex graphs that are far from being C3-minor free. THM 2: For every fixed k>3, an Õ(N1/2)-time algorithm for finding (small) Ck-minors in N-vertex graphs that are far from being Ck-minor free. Optimality: For any H that contains a cycle, no o(N1/2)-query algorithm can find H-minors in a N-vertex graphs that is far from being H-minor free. THM 3: For every fixed k>1, an O(1)-time algorithm for finding Tk-minors in graphs that are far from Tk–minor free, where Tk denotes the k-vertex star. THM 4: For any cycle-free H, an O(1)-time algorithm for finding H-minors in graphs that are far from H–minor free. The algorithms of Thms 1-3 run in time that is polynomial in the reciprocal of the proximity parameter. Dichotomy: H with/w.o. cycles.
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Property Testing: One-sided versus two-sided error
(Aux. slide) Property Testing: One-sided versus two-sided error Specialized to testing graph properties (in the bounded degree model) A (two-sided error) tester is a probabilistic oracle machine T that is given input n (#vertices) and oracle access to a n-vertex graph G and satisfies: If G has the property, then Prob[TG(n)=1] ≥ 2/3 (1 for one-sided error). If G is far from having the property, then Prob[TG(n)=1] ≤ 1/3. The definition extend to the case that the tester is also given a proximity parameter (and input), and then “far” = “e-far”. Definitions of one/two-sided error testers are provided here.
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One-sided error testing and finding structures
Observation: When a one-sided error tester for a property rejects a graph G, it must be the case that the subgraph viewed by the tester is inconsistent with any graph in . In some cases, this subgraph has a natural appeal. E.g., if is being bipartite, then the subgraph must be a non-bipartite graph; if is being H-minor free, then the subgraph must be an H-minor. Thus, all our results can be stated in terms of results regarding one-sided error testers (see next slide…). Recall that two-sided error testers of O(1)-time are known for H-minor freeness (cf. [BSS] vastly extending [GR]). N.B.: These testers do not yield algorithms for finding minors. Definitions of one/two-sided error testers should be provided. Dichotomy: one/two-sided error.
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Our results at a glance – take 3 (1-sided-error-testers)
In the bounded-degree graph model cycle = simple cycle Ck = k-vertex cycle Def: A graph G has an H-minor if H can be obtained from G by vertex and edge removal and edge contraction. THM 1: An Õ(N1/2)-time one-sided error tester for C3-minor freeness (a.k.a cycle-freeness). THM 2: For every fixed k>3, an Õ(N1/2)-time one-sided error tester for Ck-minor freeness. Optimality: For any H that contains a cycle, no o(N1/2)-query one-sided error tester for H-minor freeness. Yet, an O(1)-time two-sided error tester exists (cf. [BSS])! THM 4: For any cycle-free H, an O(1)-time one-sided error tester for H–minor freeness. The algorithms of Thms 1-3 run in time that is polynomial in the reciprocal of the proximity parameter. Two dichotomies: H with/without cycles, one/two-sided error
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Techniques: testing cycle-freeness
THM 1: An Õ(N1/2)-time one-sided error tester for cycle-freeness. In the bounded-degree graph model cycle = simple cycle The two-sided error tester just compares the # of edges to the # of cc. Idea: randomly reduce testing cycle-freeness to testing bipartiteness, by replacing each edge with a 2-path w.p. ½ (and leaving it intact otherwise). A cycle-free graph is always mapped to a bipartite graph, whereas each cycle is mapped with probability ½ to an odd cycle. CLM: A graph that is -far from being cycle-free is mapped, w.v.h.p, to a graph that is ()-far from being bipartite. Details: Local implementation of the reduction. Operations of the bipartite-tester are emulated via queries to the original graph. Before presenting the one-sided error tester, recall that the two-sided error tester does not even try to find cycles.
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Techniques: testing Ck-minor freeness
Two triangles sharing an edge contain a cycle of length four. A C4-minor free graph is a “tree” of triangles and edges. THM 2: An Õ(N1/2)-time one-sided error tester for Ck-minor freeness. In the bounded-degree graph model cycle = simple cycle Ck = k-vertex cycle Idea: (deterministically) reduce testing Ck-minor freeness to testing cycle-freeness, by replacing cycles of length < k with adequate gadgets. E.g., for k=4, replace each triangle by a 3-star. A C4-minor free graph is always mapped to a cycle-free graph, whereas any C4-minor is mapped to a cycle. CLM: A graph that is -far from being C4-minor free is mapped to a graph that is ()-far from being cycle-free. Details: Local implementation of the reduction. Operations of the bipartite-tester are emulated via queries to the original graph. The claim is illustrated in the upper-right rectangle and in the next (aux.) slide. The reduction blows-up the size of the graph by a poly(d^k) factor! (See next slide)
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(Aux. slide) Testing C4-minor freeness (via a reduction): Replacing triangles by 3-stars The reduction replaces red edges by blue edges. (Black edges remain intact.) Two triangles sharing an edge contain a cycle of length four. They are replaced by edges that contain a 4-cycle. A C4-minor free graph is a “tree” of triangles and edges. These triangles disappear (in replacement) and the tree remains. Triangles are replaced by 3-stars; the effect on BAD and GOOD graphs is shown.
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Techniques: testing Tk-minor freeness
THM 3: An poly(k/)-time one-sided error tester for Tk-minor freeness. In the bounded-degree graph model Tk = the k-vertex star The tester performs a BFS from a randomly chosen start vertex till either encountering k vertices in a layer or visiting 4k/ layers. Accept iff the explored subgraph is Tk-minor free. Call a vertex v bad if it is contained in a set S such that the subgraph induced by S contains a Tk-minor and has radius at most 4k/ from v. Observe that if the graph has few bad vertices, then it is close to being Tk-minor free (by isolating all bad vertices and omitting the edges that separate each 4k/-depth BFS from the rest of the graph). The algorithms of Thms 1-3 run in time that is polynomial in the reciprocal of the proximity parameter.
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A few open problems Main: Sublinear-time one-sided error tester of H-minor freeness for every fixed H. Recall: we only handle cycles and trees (actually forests). For sake of curiosity: Deterministic (local) reduction of testing cycle-freeness to testing bipartiteness? Recall: Our reduction was randomized. One-sided error tester of sublinear-time for Ck-minor freeness also for d > sqrt(n)? Our tester (via reduction) has a hidden poly(dk) factor. One-sided error tester of query complexity poly(k/e) for Pk-minor freeness (i.e., absence of k-paths). There is an obvious exp(k)/e-time tester. Re last item: Finding a longest path *may* be NPC even if the graph is far from lacking it.
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The End The slides of this talk are available at The paper itself is available at
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