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Considering the following language as an example:

$$\begin{align} S &\rightarrow aS \mid bA \\ A &\rightarrow bA \mid aB \mid aD \mid \varepsilon \\ B &\rightarrow aB \mid \varepsilon \\ D &\rightarrow aD \mid \varepsilon \end{align}$$

This has ambiguous transitions on the string $ba$, but how do we prove in general that a right linear language is ambiguous. Is there an algorithm for this?

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    $\begingroup$ All right linear languages are regular, so they are all unambiguous. Do you mean to ask how to prove whether a right linear grammar is ambiguous? $\endgroup$ – reinierpost Oct 5 '20 at 15:17
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For simplicity, let me assume that the only allowed rules are of the form $A \to aB$ and $A \to \epsilon$. Denote the set of nonterminals by $V$, where $S \in V$ is the starting symbol.

Construct a new right linear grammar with nonterminals $V \times V \times \{0,1\}$. The new grammar will simulate two different production sequences for each word, keeping track whether the two actually differ. The starting symbol is $(S,S,0)$, and the rules are:

  • For every pair of original rules $A \to aB$ and $C \to aD$ we add the rule $(A,C,1) \to a(B,D,1)$. (Possibly some of $A,B,C,D$ are equal.)

  • For every pair of original rules $A \to aB$ and $A \to aC$ such that $B \neq C$ we add the rule $(A,A,0) \to a(B,C,1)$. (Possibly $A=B$ or $A=C$.)

  • For every pair of original rules $A \to \epsilon$ and $B \to \epsilon$ we add the rule $(A,B,1) \to \epsilon$. (Possibly $A=B$.)

A word $w$ has two different derivations in the original grammar iff it can be generated by the new one.

For example, in your sample grammar the word $ba$ has two different derivations, $S \to bA \to baB \to ba$ and $S \to bA \to baD \to ba$, and this is reflected in the following derivation in the new grammar: $$ (S,S,0) \to b(A,A,0) \to ba(B,D,1) \to ba. $$

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  • $\begingroup$ Nice, what is the time+space complexity of this algorithm. $\endgroup$ – A. K. Oct 7 '20 at 1:40
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    $\begingroup$ That’s a nice question for you to ponder. $\endgroup$ – Yuval Filmus Oct 7 '20 at 4:01
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A right linear grammar with rules of the form $A\to aB$ and $A\to\varepsilon$ is a finite state automaton in disguise.

Such a linear grammar is ambiguous iff the following holds:

There is a pair of productions $A\to aB$ and $A\to aC$ ($B\neq C$) such that $A$ is reachable from $S$, and the languages derivable from $B$ and $C$ have a string in common.

How do we check whether pairs $B,C$ generate a common string? This can be done by a recursive marking algorithm. We start by marking pairs $(B,C)$ such that $B\to \varepsilon$ and $C\to \varepsilon$ (including $B=C$). Now repeatedly mark pairs $(X,Y)$ for which there are productions $X\to a B$ and $Y\to aC$ with $(B,C)$ marked.

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  • $\begingroup$ Yes, this may seem different, but basically this is the same solution as given by Yuval. $\endgroup$ – Hendrik Jan Oct 5 '20 at 16:34

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