Logics for Weighted Timed Pushdown Automata Manfred Droste and - - PowerPoint PPT Presentation
Logics for Weighted Timed Pushdown Automata Manfred Droste and - - PowerPoint PPT Presentation
Logics for Weighted Timed Pushdown Automata Manfred Droste and Vitaly Perevoshchikov Leipzig University YURIFEST 2015 Chapter XIII Monadic Second-Order Theories by Y. Gurevich In the present chapter we will make a case for the monadic
Chapter XIII Monadic Second-Order Theories
by Y. Gurevich In the present chapter we will make a case for the monadic second-order logic (that is to say, for the extension of first-order logic allowing quantification over monadic predicates) as a good source of theories that are both expressive and
- manageable. We will illustrate two powerful decidability techniques here—the
- ne makes use of automata and games while the other uses generalized products
a la Feferman-Vaught. The latter is, of course, particularly relevant, since monadic logic definitely appears to be the proper framework for examining generalized products. Undecidability proofs must be thought out anew in this area; for, whereas true first-order arithmetic is reducible to the monadic theory of the real line R, it is nevertheless not interpretable in the monadic theory of R. Thus, the examina- tion of a quite unusual undecidability method is another subject that will be explained in this chapter. In the last section we will briefly review the history of the methods thus far developed and give a description of some further results.
- 1. Monadic
Quantification
Monadic (second-order) logic is the extension of the first-order logic that allows quantification over monadic (unary) predicates. Thus, although binary, ternary, and other predicates, as well as functions, may appear in monadic (second-order) languages, they may nevertheless not be quantified over. LL Formal Languages for Mathematical Theories We are interested less in monadic (second-order) logic itself than in the applica- tions of this logic to mathematical theories. We are interested in the monadic formalization of the language of a mathematical theory and in monadic theories
- f corresponding mathematical objects. Before we explore this line of thought in
more detail, let us argue that formalizing a mathematical language—not necessarily in monadic logic, but rather in first-order logic or in any other formal logic for that matter—can be useful.
Weighted Timed Pushdown Automata1 (WTPDA)
WTPDA are nondeterministic finite automata equipped with: real-valued global clocks timed stack weights (of transitions and stack letters) FA stack clocks weights
1
➋➌
1Abdulla, Atig, Stenman ’14
Weighted Timed Pushdown Automata1 (WTPDA)
WTPDA are nondeterministic finite automata equipped with: real-valued global clocks timed stack weights (of transitions and stack letters) FA stack clocks weights
1
➋➌ Optimal reachability costs in WTPDA are computable1
1Abdulla, Atig, Stenman ’14
Weighted Timed Pushdown Automata1 (WTPDA)
WTPDA are nondeterministic finite automata equipped with: real-valued global clocks timed stack weights (of transitions and stack letters) FA stack clocks weights
1
➋➌ Optimal reachability costs in WTPDA are computable1 In this talk: no global clocks!
1Abdulla, Atig, Stenman ’14
Weighted Timed Pushdown Automata (WTPDA)
Weighted automata: 1 2 3 4 a ∣ 2 b ∣ 0 a ∣ 1 a ∣ 3 b ∣ 3 b ∣ 0 b ∣ 0
Weighted Timed Pushdown Automata (WTPDA)
Weighted timed pushdown automata: 1 2 3 4 a ∣ 2 push(∎) b ∣ 0 pop[1❀2)(∎) a ∣ 1 # a ∣ 3 push(∎) b ∣ 3 pop[0❀3](∎) b ∣ 0 pop(5❀∞)(∎) b ∣ 0 push(∎) Stack letter Weight ∎ 2 ∎ 3 ∎ 10
WTPDA: Behavior
Configuration of a WTPDA:
1 state q 2 timed stack st
2.5 1.9 1.7 0.1
3 accumulated weight wt ∈ R≥0
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 1 st = wt = 0 initial
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 1 st = wt = 2 0.0 switch: 1
a ∣ 2 ∣ push(∎)
- → 1
+2
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 1 st = wt = 2 0.2 delay: 0.2
+0.2
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 1 st = wt = 4 0.2 0.0 switch: 1
a ∣ 2 ∣ push(∎)
- → 1
+2
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 1 st = wt = 4 0.9 0.7 delay: 0.7
+0.7 +0.7
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 2 st = wt = 5 0.9 0.7 switch: 1
b ∣ 1 ∣ #
- → 2
+1
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 2 st = wt = 5 1.2 1.0 delay: 0.3
+0.3 +0.3
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 2 st = wt = 20 1.2 switch: 1
a ∣ 10 ∣ pop[1❀3](∎)
- → 2
+10 + (1✿0 ∗ 5)
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 2 st = wt = 20 2.2 delay: 1.0
+1.0
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a q = 2 st = wt = 41 switch: 1
a ∣ 10 ∣ pop[1❀3](∎)
- → 2
+10 + (2✿2 ∗ 5)
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 a 0.2 a 0.7 b 0.3 a 1.0 a weight(✚) q = 2 st = wt = 41 final
WTPDA: Behavior
1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5 Behavior: [[A]] ∶ TΣ+ → R≥0 ∪ {∞} w ↦ min{weight(✚) ∣ ✚ is a run on w}
Algebraic Framework for WTPDA
Definition1 A timed semiring S = ⟨(S❀+❀×❀0❀1)❀F⟩ consists of: a semiring (S❀+❀×❀0❀1); a class of functions F ⊆ SR≥0 with 1R≥0 ∈ F.
1Quaas ’10
Algebraic Framework for WTPDA
Definition1 A timed semiring S = ⟨(S❀+❀×❀0❀1)❀F⟩ consists of: a semiring (S❀+❀×❀0❀1); a class of functions F ⊆ SR≥0 with 1R≥0 ∈ F. Example: S = TropLin = ⟨(R≥0 ∪ {∞}❀min❀+❀∞❀0)❀F⟩ with F = {t ↦ c ⋅ t ∣ c ∈ R≥0}
1Quaas ’10
Algebraic Framework for WTPDA
Definition1 A timed semiring S = ⟨(S❀+❀×❀0❀1)❀F⟩ consists of: a semiring (S❀+❀×❀0❀1); a class of functions F ⊆ SR≥0 with 1R≥0 ∈ F. Example: S = TropLin = ⟨(R≥0 ∪ {∞}❀min❀+❀∞❀0)❀F⟩ with F = {t ↦ c ⋅ t ∣ c ∈ R≥0} WTPDA A over timed semirings: Weights of transitions: in S; weights of stack letters: in F
1Quaas ’10
Algebraic Framework for WTPDA
Definition1 A timed semiring S = ⟨(S❀+❀×❀0❀1)❀F⟩ consists of: a semiring (S❀+❀×❀0❀1); a class of functions F ⊆ SR≥0 with 1R≥0 ∈ F. Example: S = TropLin = ⟨(R≥0 ∪ {∞}❀min❀+❀∞❀0)❀F⟩ with F = {t ↦ c ⋅ t ∣ c ∈ R≥0} WTPDA A over timed semirings: Weights of transitions: in S; weights of stack letters: in F Weight of the removal of a top stack letter of age t ∈ R≥0 and weight f ∈ F: f (t) ∈ S (e.g., c ⋅ t)
1Quaas ’10
Algebraic Framework for WTPDA
Definition1 A timed semiring S = ⟨(S❀+❀×❀0❀1)❀F⟩ consists of: a semiring (S❀+❀×❀0❀1); a class of functions F ⊆ SR≥0 with 1R≥0 ∈ F. Example: S = TropLin = ⟨(R≥0 ∪ {∞}❀min❀+❀∞❀0)❀F⟩ with F = {t ↦ c ⋅ t ∣ c ∈ R≥0} WTPDA A over timed semirings: Weights of transitions: in S; weights of stack letters: in F Weight of the removal of a top stack letter of age t ∈ R≥0 and weight f ∈ F: f (t) ∈ S (e.g., c ⋅ t) Accumulation of weights: using ×
1Quaas ’10
Algebraic Framework for WTPDA
Definition1 A timed semiring S = ⟨(S❀+❀×❀0❀1)❀F⟩ consists of: a semiring (S❀+❀×❀0❀1); a class of functions F ⊆ SR≥0 with 1R≥0 ∈ F. Example: S = TropLin = ⟨(R≥0 ∪ {∞}❀min❀+❀∞❀0)❀F⟩ with F = {t ↦ c ⋅ t ∣ c ∈ R≥0} WTPDA A over timed semirings: Weights of transitions: in S; weights of stack letters: in F Weight of the removal of a top stack letter of age t ∈ R≥0 and weight f ∈ F: f (t) ∈ S (e.g., c ⋅ t) Accumulation of weights: using × Nondeterminism resolving: using + (e.g., min)
1Quaas ’10
Algebraic Framework for WTPDA
Definition1 A timed semiring S = ⟨(S❀+❀×❀0❀1)❀F⟩ consists of: a semiring (S❀+❀×❀0❀1); a class of functions F ⊆ SR≥0 with 1R≥0 ∈ F. Example: S = TropLin = ⟨(R≥0 ∪ {∞}❀min❀+❀∞❀0)❀F⟩ with F = {t ↦ c ⋅ t ∣ c ∈ R≥0} WTPDA A over timed semirings: Weights of transitions: in S; weights of stack letters: in F Weight of the removal of a top stack letter of age t ∈ R≥0 and weight f ∈ F: f (t) ∈ S (e.g., c ⋅ t) Accumulation of weights: using × Nondeterminism resolving: using + (e.g., min) Accepted weighted language: [[A]] ∶ TΣ+ → S
1Quaas ’10
Algebraic Framework for WTPDA
Definition1 A timed semiring S = ⟨(S❀+❀×❀0❀1)❀F⟩ consists of: a semiring (S❀+❀×❀0❀1); a class of functions F ⊆ SR≥0 with 1R≥0 ∈ F. Example: S = TropLin = ⟨(R≥0 ∪ {∞}❀min❀+❀∞❀0)❀F⟩ with F = {t ↦ c ⋅ t ∣ c ∈ R≥0} WTPDA A over timed semirings: Weights of transitions: in S; weights of stack letters: in F Weight of the removal of a top stack letter of age t ∈ R≥0 and weight f ∈ F: f (t) ∈ S (e.g., c ⋅ t) Accumulation of weights: using × Nondeterminism resolving: using + (e.g., min) Accepted weighted language: [[A]] ∶ TΣ+ → S
1Quaas ’10
Logics for Timed Pushdown Automata1
Timed extension of MSO with matchings2. Definition Let Σ be an alphabet.
1 TMSO(Σ❀≤❀✖): defined by the grammar
✬ ∶∶= Pa(x) ∣ x ≤ y ∣ x ∈ X ∣ ✖(x❀y) ∈ I ∣ ✬∨✬ ∣ ¬✬ ∣ ∃x✿✬ ∣ ∃X✿✬ where a ∈ Σ and I is an interval.
2 Timed matching logic TML(Σ): the set of all formulas
∃match✖✿✬ with ✬ ∈ TMSO(Σ❀≤❀✖).
1Droste, Perevoshchikov ’15 2Lautemann, Schwentick, Thérien ’94
Logics for Timed Pushdown Automata1
Timed extension of MSO with matchings2. Definition Let Σ be an alphabet.
1 TMSO(Σ❀≤❀✖): defined by the grammar
✬ ∶∶= Pa(x) ∣ x ≤ y ∣ x ∈ X ∣ ✖(x❀y) ∈ I ∣ ✬∨✬ ∣ ¬✬ ∣ ∃x✿✬ ∣ ∃X✿✬ where a ∈ Σ and I is an interval.
2 Timed matching logic TML(Σ): the set of all formulas
∃match✖✿✬ with ✬ ∈ TMSO(Σ❀≤❀✖).
1Droste, Perevoshchikov ’15 2Lautemann, Schwentick, Thérien ’94
Logics for Timed Pushdown Languages
Definition (Matching). A relation M ⊆ {1❀✿✿✿❀n}2 is a matching if:
1 (x❀y) ∈ M ⇒ x < y; 2 every x ∈ {1❀✿✿✿❀n} belongs to at most one pair in M;
Logics for Timed Pushdown Languages
Definition (Matching). A relation M ⊆ {1❀✿✿✿❀n}2 is a matching if:
1 (x❀y) ∈ M ⇒ x < y; 2 every x ∈ {1❀✿✿✿❀n} belongs to at most one pair in M; 3 M is non-crossing:
✔ ✖
Logics for Timed Pushdown Languages
Definition (Matching). A relation M ⊆ {1❀✿✿✿❀n}2 is a matching if:
1 (x❀y) ∈ M ⇒ x < y; 2 every x ∈ {1❀✿✿✿❀n} belongs to at most one pair in M; 3 M is non-crossing:
✔ ✖
Logics for Timed Pushdown Languages
Definition (Matching). A relation M ⊆ {1❀✿✿✿❀n}2 is a matching if:
1 (x❀y) ∈ M ⇒ x < y; 2 every x ∈ {1❀✿✿✿❀n} belongs to at most one pair in M; 3 M is non-crossing:
✔ ✖ For w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+, we let (w❀✛) ⊧ ✖(x❀y) ∈ I iff:
1 (✛(x)❀✛(y)) ∈ ✛(✖); 2 (t✛(y) − t✛(x)) ∈ I.
Weighted Timed Matching Logics
Weighted extension of TML1. Let Σ be an alphabet and S = ⟨(S❀+❀×❀0❀1)❀F⟩ a timed semiring. Definition Weighted timed matching logic WTML(Σ❀S): consists of formulas ⊕match✖✿✬ with ✬ ∶∶= ☞ ∣ s ∣ f (✖ − x) ∣ ✬⊕✬ ∣ ✬⊗✬ ∣ ⊕x✿✬ ∣ ⊗x✿✬ ∣ ⊕X✿✬ ∣ ⊗X✿✬ where ☞ ∈ TMSO(Σ❀≤❀✖), s ∈ S and f ∈ F.
1Droste, Gastin ’07
Weighted Timed Matching Logics: Semantics
Semantics: [[✬]] ∶ TΣ+
Var → S.
Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. ✿ [[☞]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ 1❀ if (w❀✛) ⊧ ☞ 0❀
- therwise
Weighted Timed Matching Logics: Semantics
Semantics: [[✬]] ∶ TΣ+
Var → S.
Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. ✿ [[☞]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ 1❀ if (w❀✛) ⊧ ☞ 0❀
- therwise
[[s]](w❀✛) = s
Weighted Timed Matching Logics: Semantics
Semantics: [[✬]] ∶ TΣ+
Var → S.
Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. ✿ [[☞]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ 1❀ if (w❀✛) ⊧ ☞ 0❀
- therwise
[[s]](w❀✛) = s [[✬1 ⊕ ✬2]](w❀✛) = [[✬1]](w❀✛) + [[✬2]](w❀✛)
Weighted Timed Matching Logics: Semantics
Semantics: [[✬]] ∶ TΣ+
Var → S.
Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. ✿ [[☞]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ 1❀ if (w❀✛) ⊧ ☞ 0❀
- therwise
[[s]](w❀✛) = s [[✬1 ⊕ ✬2]](w❀✛) = [[✬1]](w❀✛) + [[✬2]](w❀✛) [[✬1 ⊗ ✬2]](w❀✛) = [[✬1]](w❀✛) × [[✬2]](w❀✛)
Weighted Timed Matching Logics: Semantics
Semantics: [[✬]] ∶ TΣ+
Var → S.
Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. ✿ [[☞]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ 1❀ if (w❀✛) ⊧ ☞ 0❀
- therwise
[[s]](w❀✛) = s [[✬1 ⊕ ✬2]](w❀✛) = [[✬1]](w❀✛) + [[✬2]](w❀✛) [[✬1 ⊗ ✬2]](w❀✛) = [[✬1]](w❀✛) × [[✬2]](w❀✛) [[⊕x✿✬]](w❀✛) = ∑i∈{1❀✿✿✿❀n}[[✬]](w❀✛[x/i])
Weighted Timed Matching Logics: Semantics
Semantics: [[✬]] ∶ TΣ+
Var → S.
Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. ✿ [[☞]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ 1❀ if (w❀✛) ⊧ ☞ 0❀
- therwise
[[s]](w❀✛) = s [[✬1 ⊕ ✬2]](w❀✛) = [[✬1]](w❀✛) + [[✬2]](w❀✛) [[✬1 ⊗ ✬2]](w❀✛) = [[✬1]](w❀✛) × [[✬2]](w❀✛) [[⊕x✿✬]](w❀✛) = ∑i∈{1❀✿✿✿❀n}[[✬]](w❀✛[x/i]) [[⊕X✿✬]](w❀✛) = ∑I⊆{1❀✿✿✿❀n}[[✬]](w❀✛[X/I])
Weighted Timed Matching Logics: Semantics
Semantics: [[✬]] ∶ TΣ+
Var → S.
Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. ✿ [[☞]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ 1❀ if (w❀✛) ⊧ ☞ 0❀
- therwise
[[s]](w❀✛) = s [[✬1 ⊕ ✬2]](w❀✛) = [[✬1]](w❀✛) + [[✬2]](w❀✛) [[✬1 ⊗ ✬2]](w❀✛) = [[✬1]](w❀✛) × [[✬2]](w❀✛) [[⊕x✿✬]](w❀✛) = ∑i∈{1❀✿✿✿❀n}[[✬]](w❀✛[x/i]) [[⊕X✿✬]](w❀✛) = ∑I⊆{1❀✿✿✿❀n}[[✬]](w❀✛[X/I]) [[⊗x✿✬]](w❀✛) = ∏i∈{1❀✿✿✿❀n}[[✬]](w❀✛[x/i]) [[⊗X✿✬]](w❀✛) = ∏I⊆{1❀✿✿✿❀n}[[✬]](w❀✛[X/I])
Weighted Timed Matching Logics: Semantics
Semantics: [[✬]] ∶ TΣ+
Var → S.
Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. [[ f (✖ − x) ]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ f (tj − t✛(x))❀ if (✛(x)❀j) ∈ ✛(✖)❀ 0❀
- therwise
Weighted Timed Matching Logics: Semantics
Semantics: [[✬]] ∶ TΣ+
Var → S.
Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. [[ f (✖ − x) ]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ f (tj − t✛(x))❀ if (✛(x)❀j) ∈ ✛(✖)❀ 0❀
- therwise
[[ ⊕match✖✿✬ ]](w❀✛) = ∑([[✬]](w❀✛[✖/M]) ∣ M ⊆ {1❀✿✿✿❀n}2 matching)
Example
For Σ = {open❀close}, let D ⊆ Σ+ be the Dyck language, i.e., the set of all correctly nested sequences of brackets.
- pen open close open close close
time t1 t2 t3 t4 t5 t6 Example. Weighted timed Dyck language D ∶ TΣ+ → R≥0 ∪ {∞} is defined for all w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+ by D(w) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ minimal time between matching brackets❀ if a1✿✿✿an ∈ D❀ ∞❀
- therwise
Example
Example. Weighted timed Dyck language D ∶ TΣ+ → R≥0 ∪ {∞} is defined for all w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+ by D(w) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ minimal time between matching brackets❀ if a1✿✿✿an ∈ D❀ ∞❀
- therwise
D is defined by the WTML(Σ❀TropLin)-formula: ✬ = ⊕match✖✿(☞ ⊗ ⊕x✿id(✖ − x)) where ☞ = ∀x✿[(Popen(x) → ∃y✿✖(x❀y)) ∧ (Pclose(x) → ∃y✿✖(y❀x))]
Restricted WTML
Formulas with unrecognizable semantics: formulas with nested ⊗x✿-quantifiers; formulas with ⊗X✿-quantifiers; ✬ ✬ ✿✬ ✬ ✖
Restricted WTML
Formulas with unrecognizable semantics: formulas with nested ⊗x✿-quantifiers; formulas with ⊗X✿-quantifiers; formulas ✬1 ⊗ ✬2; ✿✬ ✬ ✖
Restricted WTML
Formulas with unrecognizable semantics: formulas with nested ⊗x✿-quantifiers; formulas with ⊗X✿-quantifiers; formulas ✬1 ⊗ ✬2; formulas ⊗x✿✬ where ✬ contains f (✖ − y) with y ≠ x.
Restricted WTML
Formulas with unrecognizable semantics: formulas with nested ⊗x✿-quantifiers; formulas with ⊗X✿-quantifiers; formulas ✬1 ⊗ ✬2; formulas ⊗x✿✬ where ✬ contains f (✖ − y) with y ≠ x.
Restricted WTML
Formulas with unrecognizable semantics: formulas with nested ⊗x✿-quantifiers; formulas with ⊗X✿-quantifiers; formulas ✬1 ⊗ ✬2; formulas ⊗x✿✬ where ✬ contains f (✖ − y) with y ≠ x. Let S = ⟨(S❀+❀×❀0❀1)❀F⟩. Definition (restricted WTML). WTMLres(Σ❀S): the set of all formulas ⊕match✖✿✬ with ✌x ∶∶= ☞ ∣ s ⊗ f (✖ − x) ∣ ✌x ⊕ ✌x ∣ ☞ ⊗ ✌x ✬ ∶∶= ☞ ∣ s ⊗ f (✖ − x) ∣ ✬ ⊕ ✬ ∣ ☞ ⊗ ✬ ∣ ⊕x✿✬ ∣ ⊕X✿✬ ∣ ⊗x✿✌x where ☞ ∈ TMSO(Σ), s ∈ S and f ∈ F.
Main Result
Let Σ be an alphabet and S = ⟨(S❀+❀×❀0❀1)❀F⟩ a timed semiring. Theorem. Let W ∶ TΣ+ → S be a weighted timed language. TFAE:
1 W is recognizable by a weighted timed pushdown automaton
(WTPDA) over Σ and S.
2 W is definable by a restricted weighted timed matching
sentence in WTMLres(Σ❀S).
Proof
FA TA PDA TPDA WA WTA WPDA WTPDA
MSO RDL ML TML WMSO WRDL WTML WML
Proof
FA TA PDA TPDA VPDA1 WA WTA WPDA WTPDA
MSO RDL ML TML WMSO WRDL WTML WML MSO
1Visibly pushdown automata (Alur, Madhusudan ’04)
Decomposition of WTPDA
➋ ➋ ➋ 1
WTPDA
- ver Σ
✙ ∶ Γ → Σ
∩
VPDA
- ver Γ
➋ ➋ ➋ 1
"Primitive" WTPDL T ∶ TΓ+ → S Extended alphabet Γ = ∆
- transitions
× P(k)
- stack constraints
× ˆ S
- S-constants
× ˆ F
- F-constants
×{push❀#❀pop} ÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜÜ
stack commands
k ∶= maximal number appearing in constraints P(k) ∶= {[0❀0]❀(0❀1)❀[1❀1]❀✿✿✿❀(k − 1❀k)❀[k❀k]❀(k❀∞)}
Decomposition of WTPDA
➋ ➋ ➋ 1
WTPDA
- ver Σ
✙ ∶ Γ → Σ
∩
VPDA
- ver Γ
➋ ➋ ➋ 1
"Primitive" WTPDL T ∶ TΓ+ → S Theorem Let W ∶ TΣ+ → S. TFAE:
1 W is recognizable by a WTPDA. 2 There exist k ∈ N, alphabets ∆, ˆ
S ⊆ S and ˆ F ⊆ F, and a VPDL L ⊆ (Γ(k❀∆❀ ˆ S❀ ˆ F))+ with W = ✙(L′ ∩ T )
Conclusions
1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks.
✖✿
Conclusions
1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:
✖✿
Conclusions
1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:
WTPDA with additional properties of F. ✖✿
Conclusions
1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:
WTPDA with additional properties of F. WTPDA with location weights. ✖✿
Conclusions
1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:
WTPDA with additional properties of F. WTPDA with location weights. ∃match✖✿FO ≡ TPDA?
Conclusions
1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:
WTPDA with additional properties of F. WTPDA with location weights. ∃match✖✿FO ≡ TPDA? Applications
Conclusions
1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:
WTPDA with additional properties of F. WTPDA with location weights. ∃match✖✿FO ≡ TPDA? Applications
Conclusions
1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:
WTPDA with additional properties of F. WTPDA with location weights. ∃match✖✿FO ≡ TPDA? Applications
Conclusions
1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work: