**Problem Detail:**

Is there a `Context-free grammar`

for the following language:

$L=\{ x\#1^m|x \in \{0,1\}^* \space and \space the \space m^{th} \space char \space in \space x \space is \space 1 \}$

If so what is it? Because i couldn't find any. I also tried to prove there isn't (by the Pumping lemma for context-free languages), but it's given that a `Context-free grammar`

does exist and I found an error in my "proof".

So what would be the grammar?

Here's the big picture of my proof:

Let's choose $m=n_0$ and take the word $w=0^{n_0}1\#1^{n_0+1}$ (so that $x$ is what's on the left side of $\#$) .

According to the lemma, $w$ can be written as $uvxyz$ and some conditions hold...

$|vxy| \leq n_0$

therefor, $vxy$ include only zeros ($0$'s).

Now let's choose `k=2`

and pump it up:

we get: $w_2=uv^2xy^2z$

which means, the number of $0$'s is now:

$n_0 + |v| + |y| \geq n_0 + 1$

(since $|vy| \geq 1$) .

Hence, the $m$th number (the $n_0$th in our case) is not $1$. It's actually $0$.

Hence, $w_2$ doesn't belong to $L$. Contradiction.

Hence, $L$ isn't `Context-free`

.

I think i know where's my mistake in the proof:

$vxy$ isn't necessarily only $0$'s. It could have the last $n_0-1$ zero's and a $1$.

###### Asked By : Alaa M.

#### Answered By : Yuval Filmus

Here is a PDA for this language. While reading $x$, the whole of $x$ is pushed onto the stack. After encountering $\#$, the PDA pops some non-deterministic amount of symbols, then verifies that the top symbol is $1$, and pops $m$ symbols. It acceptes if the stack is empty.

Variant: instead of popping a part of $x$, while reading $x$ the PDA non-deterministically stops pushing symbols into the stack; it only does so after reading a $1$.

As for a CFG for this language, here is the idea: $$ \begin{align*} &S \to \Sigma^{m-1} 1 T 1^m \\ &T \to \Sigma^* \# \end{align*} $$

I'll let you construct an actual grammar based on this idea.

###### Best Answer from StackOverflow

Question Source : http://cs.stackexchange.com/questions/24140

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