Logics for Weighted Timed Pushdown Automata Manfred Droste and - - PowerPoint PPT Presentation

logics for weighted timed pushdown automata
SMART_READER_LITE
LIVE PREVIEW

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


slide-1
SLIDE 1

Logics for Weighted Timed Pushdown Automata

Manfred Droste and Vitaly Perevoshchikov

Leipzig University

YURIFEST 2015

slide-2
SLIDE 2

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.

slide-3
SLIDE 3
slide-4
SLIDE 4

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

slide-5
SLIDE 5

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

slide-6
SLIDE 6

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

slide-7
SLIDE 7

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

slide-8
SLIDE 8

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

slide-9
SLIDE 9

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

slide-10
SLIDE 10

WTPDA: Behavior

1 2 b ∣ 1 # a ∣ 2 push(∎) a ∣ 10 pop[1❀3](∎) Stack letter Weight ∎ 5

slide-11
SLIDE 11

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

slide-12
SLIDE 12

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

slide-13
SLIDE 13

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

slide-14
SLIDE 14

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

slide-15
SLIDE 15

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

slide-16
SLIDE 16

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

slide-17
SLIDE 17

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

slide-18
SLIDE 18

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)

slide-19
SLIDE 19

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

slide-20
SLIDE 20

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)

slide-21
SLIDE 21

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

slide-22
SLIDE 22

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}

slide-23
SLIDE 23

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

slide-24
SLIDE 24

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

slide-25
SLIDE 25

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

slide-26
SLIDE 26

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

slide-27
SLIDE 27

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

slide-28
SLIDE 28

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

slide-29
SLIDE 29

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

slide-30
SLIDE 30

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

slide-31
SLIDE 31

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

slide-32
SLIDE 32

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

slide-33
SLIDE 33

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;

slide-34
SLIDE 34

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:

✔ ✖

slide-35
SLIDE 35

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:

✔ ✖

slide-36
SLIDE 36

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.

slide-37
SLIDE 37

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

slide-38
SLIDE 38

Weighted Timed Matching Logics: Semantics

Semantics: [[✬]] ∶ TΣ+

Var → S.

Let w = (a1❀t1)✿✿✿(an❀tn) ∈ TΣ+. ✿ [[☞]](w❀✛) = ⎧ ⎪ ⎪ ⎨ ⎪ ⎪ ⎩ 1❀ if (w❀✛) ⊧ ☞ 0❀

  • therwise
slide-39
SLIDE 39

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

slide-40
SLIDE 40

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❀✛)

slide-41
SLIDE 41

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❀✛)

slide-42
SLIDE 42

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])

slide-43
SLIDE 43

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])

slide-44
SLIDE 44

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])

slide-45
SLIDE 45

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
slide-46
SLIDE 46

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)

slide-47
SLIDE 47

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
slide-48
SLIDE 48

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))]

slide-49
SLIDE 49

Restricted WTML

Formulas with unrecognizable semantics: formulas with nested ⊗x✿-quantifiers; formulas with ⊗X✿-quantifiers; ✬ ✬ ✿✬ ✬ ✖

slide-50
SLIDE 50

Restricted WTML

Formulas with unrecognizable semantics: formulas with nested ⊗x✿-quantifiers; formulas with ⊗X✿-quantifiers; formulas ✬1 ⊗ ✬2; ✿✬ ✬ ✖

slide-51
SLIDE 51

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.

slide-52
SLIDE 52

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.

slide-53
SLIDE 53

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.

slide-54
SLIDE 54

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).

slide-55
SLIDE 55

Proof

FA TA PDA TPDA WA WTA WPDA WTPDA

MSO RDL ML TML WMSO WRDL WTML WML

slide-56
SLIDE 56

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)

slide-57
SLIDE 57

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❀∞)}

slide-58
SLIDE 58

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 )

slide-59
SLIDE 59

Conclusions

1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks.

✖✿

slide-60
SLIDE 60

Conclusions

1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:

✖✿

slide-61
SLIDE 61

Conclusions

1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:

WTPDA with additional properties of F. ✖✿

slide-62
SLIDE 62

Conclusions

1 Effective translation ⇒ decidability results. 2 WTPDA with global clocks. 3 Future work:

WTPDA with additional properties of F. WTPDA with location weights. ✖✿

slide-63
SLIDE 63

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?

slide-64
SLIDE 64

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

slide-65
SLIDE 65

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

slide-66
SLIDE 66

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

slide-67
SLIDE 67

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

THANK YOU!