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L(2, 1, 1)-Labeling Is NP-Complete for Trees
Petr A. Golovach 1, Bernard Lidicky 2, and Daniel Paulusma 3
1University of Bergen, Bergen, Norway
2University of Illinois, Urbana, USA
3University of Durham, Durham, UK
SIAM DM 2012, HalifaxJune 19, 2012
Basic definitions
Definition (L(p1, . . . , pk)-labelings)
For positive integers p1, . . . , pk , p1 ≥ . . . ≥ pk , and λ, anL(p1, . . . , pk)-labeling of a graph G with the span λ is a mappingf : V (G )→ {0, 1, . . . , λ} such that for any vertices u, v ,|f (u)− f (v)| ≥ pi if distG (u, v) ≤ i , i ∈ {1, . . . , k}.The minimum span for which an L(p1, . . . , pk)-labeling exists isdenoted by λp1,...,pk (G ).
L(1)-labeling is classical coloring.
Basic definitions
Examples of L(2, 1) and L(2, 1, 1)-labelings
3
4
5 5
0
4
1
0 2
Basic definitions
L(2, 1)-labeling of span 5
3
4
5 5
0
4
1
0 2
Basic definitions
L(2, 1, 1)-labeling of span 7
3
4
5 5
0
4
1
0 2
3
4
5 7
3
6
1
0 2
Basic definitions
Problem (L(p1, . . . , pk)-labeling)
Parameters: positive integers p1, . . . , pk .
Instance: a graph G and a positive integer λ.
Question: does G have an L(p1, . . . , pk)-labeling with span λ?
Known results
General graphs:
• L(2, 1)-labeling is NP-complete (Griggs, Yeh; ’92).
• L(2, 1)-labeling can be solved in polynomial time for λ < 4and is NP-complete otherwise (Fiala, Kloks and Kratochvıl;’01).
• L(2, 1, 1)-labeling can be solved in polynomial time for λ < 5and is NP-complete otherwise (Fiala, Golovach andKratochvıl; ’04).
• Exact algorithms for L(2, 1)-labeling of graphs (Kral’; ’05 andHavet, Klazar, Kratochvıl, Kratsch, Liedloff; ’11).
Known results
General graphs:
• L(2, 1)-labeling is NP-complete (Griggs, Yeh; ’92).
• L(2, 1)-labeling can be solved in polynomial time for λ < 4and is NP-complete otherwise (Fiala, Kloks and Kratochvıl;’01).
• L(2, 1, 1)-labeling can be solved in polynomial time for λ < 5and is NP-complete otherwise (Fiala, Golovach andKratochvıl; ’04).
• Exact algorithms for L(2, 1)-labeling of graphs (Kral’; ’05 andHavet, Klazar, Kratochvıl, Kratsch, Liedloff; ’11).
Known results
General graphs:
• L(2, 1)-labeling is NP-complete (Griggs, Yeh; ’92).
• L(2, 1)-labeling can be solved in polynomial time for λ < 4and is NP-complete otherwise (Fiala, Kloks and Kratochvıl;’01).
• L(2, 1, 1)-labeling can be solved in polynomial time for λ < 5and is NP-complete otherwise (Fiala, Golovach andKratochvıl; ’04).
• Exact algorithms for L(2, 1)-labeling of graphs (Kral’; ’05 andHavet, Klazar, Kratochvıl, Kratsch, Liedloff; ’11).
Known results
General graphs:
• L(2, 1)-labeling is NP-complete (Griggs, Yeh; ’92).
• L(2, 1)-labeling can be solved in polynomial time for λ < 4and is NP-complete otherwise (Fiala, Kloks and Kratochvıl;’01).
• L(2, 1, 1)-labeling can be solved in polynomial time for λ < 5and is NP-complete otherwise (Fiala, Golovach andKratochvıl; ’04).
• Exact algorithms for L(2, 1)-labeling of graphs (Kral’; ’05 andHavet, Klazar, Kratochvıl, Kratsch, Liedloff; ’11).
Known results
Graphs of bounded treewidth:
• For any fixed λ, L(p1, . . . , pk)-labeling can be solved inpolynomial (linear) time by the theorem of Courcelle.
• L(2, 1)-labeling is NP-complete for graphs tw ≤ 2 (Fiala,Golovach and Kratochvıl).
• L(1, 1, . . . , 1)-labeling is solvable in polynomial time (Zhou,Kanari and Nishizeki; ’00).
Known results
Graphs of bounded treewidth:
• For any fixed λ, L(p1, . . . , pk)-labeling can be solved inpolynomial (linear) time by the theorem of Courcelle.
• L(2, 1)-labeling is NP-complete for graphs tw ≤ 2 (Fiala,Golovach and Kratochvıl).
• L(1, 1, . . . , 1)-labeling is solvable in polynomial time (Zhou,Kanari and Nishizeki; ’00).
Known results
Graphs of bounded treewidth:
• For any fixed λ, L(p1, . . . , pk)-labeling can be solved inpolynomial (linear) time by the theorem of Courcelle.
• L(2, 1)-labeling is NP-complete for graphs tw ≤ 2 (Fiala,Golovach and Kratochvıl).
• L(1, 1, . . . , 1)-labeling is solvable in polynomial time (Zhou,Kanari and Nishizeki; ’00).
Known results
Trees:
• L(2, 1)-labeling can be solved in polynomial time (Chang,Kuo; ’96). in linear time (Hasunuma, Ishii, Ono, Uno; ’09)
• L(p1, 1)-labeling can be solved in polynomial time (Chang,Ke, Kuo, Liu, Yeh; ’96).
• L(p1, p2)-labeling can be solved in polynomial time if p2
divides p1 and is NP-complete otherwise (Fiala, Golovach andKratochvıl; ’08).
• L(p1, 1)-labeling is NP-complete if p1 is part of the input(Golovach; ’06).
Known results
Trees:
• L(2, 1)-labeling can be solved in polynomial time (Chang,Kuo; ’96). in linear time (Hasunuma, Ishii, Ono, Uno; ’09)
• L(p1, 1)-labeling can be solved in polynomial time (Chang,Ke, Kuo, Liu, Yeh; ’96).
• L(p1, p2)-labeling can be solved in polynomial time if p2
divides p1 and is NP-complete otherwise (Fiala, Golovach andKratochvıl; ’08).
• L(p1, 1)-labeling is NP-complete if p1 is part of the input(Golovach; ’06).
Known results
Trees:
• L(2, 1)-labeling can be solved in polynomial time (Chang,Kuo; ’96). in linear time (Hasunuma, Ishii, Ono, Uno; ’09)
• L(p1, 1)-labeling can be solved in polynomial time (Chang,Ke, Kuo, Liu, Yeh; ’96).
• L(p1, p2)-labeling can be solved in polynomial time if p2
divides p1 and is NP-complete otherwise (Fiala, Golovach andKratochvıl; ’08).
• L(p1, 1)-labeling is NP-complete if p1 is part of the input(Golovach; ’06).
Known results
Trees:
• L(2, 1)-labeling can be solved in polynomial time (Chang,Kuo; ’96). in linear time (Hasunuma, Ishii, Ono, Uno; ’09)
• L(p1, 1)-labeling can be solved in polynomial time (Chang,Ke, Kuo, Liu, Yeh; ’96).
• L(p1, p2)-labeling can be solved in polynomial time if p2
divides p1 and is NP-complete otherwise (Fiala, Golovach andKratochvıl; ’08).
• L(p1, 1)-labeling is NP-complete if p1 is part of the input(Golovach; ’06).
Known results
TheoremEvery tree T satisfies
∆(T ) + 1 ≤ λ2,1(T ) ≤ ∆(T ) + 2.
Theorem (King, Ras, Zhou; ’10 and indep. Fiala, Golovach,Kratochvıl; ’04)
Every tree T satisfies
ω(T 3)− 1 ≤ λ2,1,1(T ) ≤ ω(T 3).
Main result
Theorem (Golovach, L., Paulusma)
The L(2, 1, 1)-labeling problem is NP-complete for the class oftrees.
Sketch of the proof
Problem (3-Satisfiability)
Instance: variables x1, . . . , xx and clauses C1, . . . ,Cm.
Question: can φ = C1 ∧ . . . ∧ Cm be satisfied?
Sketch of the proof - Idea of the reduction
......
xi{4i, λ− 4i, 4i+ 2,
λ− (4i+ 2)}
xi ∨ xj ∨ xs{4i, λ− 4i, 4j + 2,λ− (4j + 2), 4s, λ− 4s}
Sketch of the proof - Idea of the reduction
distance 2 distance 4
......
xi{4i, λ− 4i, 4i+ 2,
λ− (4i+ 2)}
xi ∨ xj ∨ xs{4i, λ− 4i, 4j + 2,λ− (4j + 2), 4s, λ− 4s}
Sketch of the proof - Idea of the reduction
distance 2 distance 4
......
xi{4i, λ− 4i, 4i+ 2,
λ− (4i+ 2)}
xi ∨ xj ∨ xs{4i, λ− 4i, 4j + 2,λ− (4j + 2), 4s, λ− 4s}
4i 4i+ 2 λ− (4i+ 2) λ− 4i
xi =
{true, if 4i or λ− 4i is not used,
false, if 4i + 2 or λ− (4i + 2) is not used.
Sketch of the proof - Idea of the reduction
distance 2 distance 4
......
xi{4i, λ− 4i, 4i+ 2,
λ− (4i+ 2)}
xi ∨ xj ∨ xs{4i, λ− 4i, 4j + 2,λ− (4j + 2), 4s, λ− 4s}
4i λ− 4i λ− (4i+ 2) ? not xi
xi =
{true, if 4i or λ− 4i is not used,
false, if 4i + 2 or λ− (4i + 2) is not used.
Sketch of the proof - Forcing lists
......
xi{4i, λ− 4i, 4i+ 2,
λ− (4i+ 2)}
xi ∨ xj ∨ xs{4i, λ− 4i, 4j + 2,λ− (4j + 2), 4s, λ− 4s}
Sketch of the proof - Forcing lists
T (k){2, 4, . . . , 2k}∪∪{λ− 2k , λ− 2k − 2, . . . , λ− 2}
{0, λ} {1, λ− 1}
Sketch of the proof - Forcing lists
T (k) {2k , λ− 2k}
2k − 2 copies of T (k − 1)
Trees F (k)
Sketch of the proof - Forcing lists
T (k) S
F (i)F (i)
s.t. 2i /∈ SFor each i ∈ {1, . . . , k},
Forcing of a listS ⊆ {2, 4, . . . , 2k} ∪ {λ− 2k , λ− 2k − 2, . . . , λ− 2} s.t. ∀x ∈ S ,
λ− x ∈ S .
Cyclic labelings
Definition (Cyclic metric (modulo λ + 1))
For positive integers a, b ∈ {0, . . . , λ},|a− b|c = min{|a− b|, λ+ 1− |a− b|}.
Definition (C (p1, . . . , pk)-labelings)
For positive integers p1, . . . , pk , p1 ≥ . . . ≥ pk , and λ, anC (p1, . . . , pk)-labeling of a graph G with the span λ is a mappingf : V (G )→ {0, 1, . . . , λ} such that for any vertices u, v ,|f (u)− f (v)|c ≥ pi if distG (u, v) ≤ i , i ∈ {1, . . . , k}.
Cyclic labelings
Definition (Cyclic metric (modulo λ + 1))
For positive integers a, b ∈ {0, . . . , λ},|a− b|c = min{|a− b|, λ+ 1− |a− b|}.
Definition (C (p1, . . . , pk)-labelings)
For positive integers p1, . . . , pk , p1 ≥ . . . ≥ pk , and λ, anC (p1, . . . , pk)-labeling of a graph G with the span λ is a mappingf : V (G )→ {0, 1, . . . , λ} such that for any vertices u, v ,|f (u)− f (v)|c ≥ pi if distG (u, v) ≤ i , i ∈ {1, . . . , k}.
Cyclic labelings
C (2, 1)-labeling of span 6
0 2
4
0
1
5
4
3
5
Cyclic labelings
What is the computational complexity of C (2, 1, 1)-Labeling ontrees?
Thank you for your attention!